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Our goals: understand principles behind transport layer services: Multiplexing and demultiplexing reliable data transfer flow control congestion control. learn about transport layer protocols in the Internet: UDP: connectionless transport TCP: connection-oriented transport - PowerPoint PPT Presentation
Citation preview
3-1
Chapter 3 Transport LayerOur goals understand
principles behind transport layer services Multiplexing and
demultiplexing reliable data
transfer flow control congestion
control
learn about transport layer protocols in the Internet UDP connectionless
transport TCP connection-
oriented transport TCP congestion control
1 Multiplexing is to support multiple flows
2 Network can damage pkt lose pkt duplicate pkt
3 One of my favorite layer
3-2
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-3
Transport services and protocols provide logical
communication between app processes running on different hosts
transport protocols run in end systems send side breaks app
messages into segments passes to network layer
rcv side reassembles segments into messages passes to app layer
more than one transport protocol available to apps Internet TCP and UDP
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
3-4
Transport vs network layer network layer
logical communication between hosts
transport layer logical communication between processes relies on enhances
network layer services
Household analogy12 kids sending
letters to 12 kids processes = kids app messages =
letters in envelopes hosts = houses transport protocol
= Ann and Bill network-layer
protocol = postal service
Another analogy1 Post office -gt network layer2 My wife -gt transport layer
3-5
Internet transport-layer protocols reliable in-order
delivery (TCP) congestion control
(distributed control) flow control connection setup
unreliable unordered delivery UDP no-frills extension of
ldquobest-effortrdquo IP
services not available delay guarantees bandwidth guarantees
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
Research issues
3-6
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-7
Multiplexingdemultiplexing
application
transport
network
link
physical
P1 application
transport
network
link
physical
application
transport
network
link
physical
P2P3 P4P1
host 1 host 2 host 3
= process= socket
delivering received segmentsto correct socket
Demultiplexing at rcv hostgathering data from multiplesockets enveloping data with header (later used for demultiplexing)
Multiplexing at send host
FTP telnet
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-2
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-3
Transport services and protocols provide logical
communication between app processes running on different hosts
transport protocols run in end systems send side breaks app
messages into segments passes to network layer
rcv side reassembles segments into messages passes to app layer
more than one transport protocol available to apps Internet TCP and UDP
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
3-4
Transport vs network layer network layer
logical communication between hosts
transport layer logical communication between processes relies on enhances
network layer services
Household analogy12 kids sending
letters to 12 kids processes = kids app messages =
letters in envelopes hosts = houses transport protocol
= Ann and Bill network-layer
protocol = postal service
Another analogy1 Post office -gt network layer2 My wife -gt transport layer
3-5
Internet transport-layer protocols reliable in-order
delivery (TCP) congestion control
(distributed control) flow control connection setup
unreliable unordered delivery UDP no-frills extension of
ldquobest-effortrdquo IP
services not available delay guarantees bandwidth guarantees
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
Research issues
3-6
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-7
Multiplexingdemultiplexing
application
transport
network
link
physical
P1 application
transport
network
link
physical
application
transport
network
link
physical
P2P3 P4P1
host 1 host 2 host 3
= process= socket
delivering received segmentsto correct socket
Demultiplexing at rcv hostgathering data from multiplesockets enveloping data with header (later used for demultiplexing)
Multiplexing at send host
FTP telnet
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-3
Transport services and protocols provide logical
communication between app processes running on different hosts
transport protocols run in end systems send side breaks app
messages into segments passes to network layer
rcv side reassembles segments into messages passes to app layer
more than one transport protocol available to apps Internet TCP and UDP
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
3-4
Transport vs network layer network layer
logical communication between hosts
transport layer logical communication between processes relies on enhances
network layer services
Household analogy12 kids sending
letters to 12 kids processes = kids app messages =
letters in envelopes hosts = houses transport protocol
= Ann and Bill network-layer
protocol = postal service
Another analogy1 Post office -gt network layer2 My wife -gt transport layer
3-5
Internet transport-layer protocols reliable in-order
delivery (TCP) congestion control
(distributed control) flow control connection setup
unreliable unordered delivery UDP no-frills extension of
ldquobest-effortrdquo IP
services not available delay guarantees bandwidth guarantees
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
Research issues
3-6
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-7
Multiplexingdemultiplexing
application
transport
network
link
physical
P1 application
transport
network
link
physical
application
transport
network
link
physical
P2P3 P4P1
host 1 host 2 host 3
= process= socket
delivering received segmentsto correct socket
Demultiplexing at rcv hostgathering data from multiplesockets enveloping data with header (later used for demultiplexing)
Multiplexing at send host
FTP telnet
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-4
Transport vs network layer network layer
logical communication between hosts
transport layer logical communication between processes relies on enhances
network layer services
Household analogy12 kids sending
letters to 12 kids processes = kids app messages =
letters in envelopes hosts = houses transport protocol
= Ann and Bill network-layer
protocol = postal service
Another analogy1 Post office -gt network layer2 My wife -gt transport layer
3-5
Internet transport-layer protocols reliable in-order
delivery (TCP) congestion control
(distributed control) flow control connection setup
unreliable unordered delivery UDP no-frills extension of
ldquobest-effortrdquo IP
services not available delay guarantees bandwidth guarantees
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
Research issues
3-6
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-7
Multiplexingdemultiplexing
application
transport
network
link
physical
P1 application
transport
network
link
physical
application
transport
network
link
physical
P2P3 P4P1
host 1 host 2 host 3
= process= socket
delivering received segmentsto correct socket
Demultiplexing at rcv hostgathering data from multiplesockets enveloping data with header (later used for demultiplexing)
Multiplexing at send host
FTP telnet
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-5
Internet transport-layer protocols reliable in-order
delivery (TCP) congestion control
(distributed control) flow control connection setup
unreliable unordered delivery UDP no-frills extension of
ldquobest-effortrdquo IP
services not available delay guarantees bandwidth guarantees
application
transportnetworkdata linkphysical
application
transportnetworkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysical
networkdata linkphysicalnetwork
data linkphysical
logical end-end transport
Research issues
3-6
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-7
Multiplexingdemultiplexing
application
transport
network
link
physical
P1 application
transport
network
link
physical
application
transport
network
link
physical
P2P3 P4P1
host 1 host 2 host 3
= process= socket
delivering received segmentsto correct socket
Demultiplexing at rcv hostgathering data from multiplesockets enveloping data with header (later used for demultiplexing)
Multiplexing at send host
FTP telnet
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-6
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-7
Multiplexingdemultiplexing
application
transport
network
link
physical
P1 application
transport
network
link
physical
application
transport
network
link
physical
P2P3 P4P1
host 1 host 2 host 3
= process= socket
delivering received segmentsto correct socket
Demultiplexing at rcv hostgathering data from multiplesockets enveloping data with header (later used for demultiplexing)
Multiplexing at send host
FTP telnet
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-7
Multiplexingdemultiplexing
application
transport
network
link
physical
P1 application
transport
network
link
physical
application
transport
network
link
physical
P2P3 P4P1
host 1 host 2 host 3
= process= socket
delivering received segmentsto correct socket
Demultiplexing at rcv hostgathering data from multiplesockets enveloping data with header (later used for demultiplexing)
Multiplexing at send host
FTP telnet
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-8
How demultiplexing works host receives IP datagrams
each datagram has source IP address destination IP address
each datagram carries 1 transport-layer segment
each segment has source destination port number (recall well-known port numbers for specific applications)
host uses IP addresses amp port numbers to direct segment to appropriate socket
source port dest port
32 bits
applicationdata
(message)
other header fields
TCPUDP segment format
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-9
Connectionless demultiplexing
Create sockets with port numbers
DatagramSocket mySocket1 = new DatagramSocket(99111)
DatagramSocket mySocket2 = new DatagramSocket(99222)
UDP socket identified by two-tuple
(dest IP address dest port number)
When host receives UDP segment checks destination port
number in segment directs UDP segment to
socket with that port number
IP datagrams with different source IP addresses andor source port numbers directed to same socket (this is how a system can serve multiple requests)
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-10
Connectionless demux (cont)
DatagramSocket serverSocket = new DatagramSocket(6428)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 6428
DP 9157
SP 9157
DP 6428
SP 6428
DP 5775
SP 5775
DP 6428
SP provides ldquoreturn addressrdquo
Source IP and port can be spoofed
Based on destination IP and
port
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-11
Connection-oriented demux
TCP socket identified by 4-tuple source IP address source port number dest IP address dest port number
recv host uses all four values to direct segment to appropriate socket
Server host may support many simultaneous TCP sockets each socket identified
by its own 4-tuple
Web servers have different sockets for each connecting client non-persistent HTTP
will have different socket for each request
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-12
Connection-oriented demux (cont)
ClientIPB
P3
client IP A
P1P1P3
serverIP C
SP 80
DP 9157
SP 9157
DP 80
SP 80
DP 5775
SP 5775
DP 80
P4
(S-IPSP D-IP DP)
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-13
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-14
UDP User Datagram Protocol [RFC 768]
ldquono frillsrdquo ldquobare bonesrdquo Internet transport protocol
ldquobest effortrdquo service UDP segments may be lost delivered out of order
to app connectionless
no handshaking between UDP sender receiver
each UDP segment handled independently of others
Why is there a UDP no connection
establishment (which can add delay)
simple no connection state at sender receiver
small segment header no congestion control
UDP can blast away as fast as desired
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-15
UDP more
often used for streaming multimedia apps loss tolerant rate sensitive
other UDP uses DNS SNMP
reliable transfer over UDP add reliability at application layer application-specific
error recovery (eg FTP based on UDP but with recovery)
source port dest port
32 bits
Applicationdata
(message)
UDP segment format
length checksumLength in
bytes of UDPsegmentincluding
headerWhen the network is stressed you PRAY
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-16
UDP checksum
Sender treat segment
contents as sequence of 16-bit integers
checksum addition (1rsquos complement sum) of segment contents
sender puts checksum value into UDP checksum field
Receiver compute checksum of
received segment check if computed
checksum equals checksum field value NO - error detected YES - no error detected
But maybe errors nonetheless More later hellip
Goal detect ldquoerrorsrdquo (eg flipped bits) in transmitted segment
eg 1+2+3 = 6 So is 0+3+3=6
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-17
Internet Checksum Example Note
When adding numbers a carryout from the most significant bit needs to be added to the result
Example add two 16-bit integers
1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 01 1 1 0 1 0 1 0 1 0 1 0 1 0 1 0 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 0 1 1
1 1 0 1 1 1 0 1 1 1 0 1 1 1 1 0 01 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1
wraparound
sumchecksum
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-18
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-19
Principles of Reliable data transfer important in app transport link layers top-10 list of important networking topics
characteristics of unreliable channel will determine complexity of reliable data transfer protocol (rdt)
abstractionThis picture sets the scenario
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-20
Reliable data transfer getting started
sendside
receiveside
rdt_send() called from above (eg by app)
Passed data to deliver to receiver upper
layer
udt_send() called by rdtto transfer packet over
unreliable channel to receiver
rdt_rcv() called when packet arrives on rcv-side of
channel
deliver_data() called by rdt to deliver data
to upper
Let us now look at the gut of these modules Any question
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-21
Reliable data transfer getting startedWersquoll incrementally develop sender receiver
sides of reliable data transfer protocol (rdt)
consider only unidirectional data transfer but control info will flow on both directions
use finite state machines (FSM) to specify sender receiver
state1
state2
event causing state transitionactions taken on state transition
state when in this ldquostaterdquo next
state uniquely determined by
next eventeventactions
(DONrsquoT FALL ASLEEP)
Event timer receives message hellipetcAction executes a program send message hellipetc
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-22
Rdt10 reliable transfer over a reliable channel
underlying channel perfectly reliable no bit errors no loss of packets
separate FSMs for sender receiver sender sends data into underlying channel receiver reads data from underlying channel
Wait for call from
above packet = make_pkt(data)udt_send(packet)
rdt_send(data)
extract (packetdata)deliver_data(data)
Wait for call from
below
rdt_rcv(packet)
sender receiver
In reality this is an unrealistic assumption but
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-23
Rdt20 channel with bit errors
underlying channel may flip bits in packet recall UDP checksum to detect bit errors
the question how to recover from errors acknowledgements (ACKs) receiver explicitly tells
sender that pkt received OK negative acknowledgements (NAKs) receiver
explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK human scenarios using ACKs NAKs
new mechanisms in rdt20 (beyond rdt10) error detection receiver feedback control msgs (ACKNAK) rcvr-
gtsender
Ack I love u I love u 2Nak I love u I donrsquot love u
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-24
rdt20 FSM specification
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
belowsender
receiverrdt_send(data)
Buffer is needed to store data from application layer or to block call
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-25
rdt20 operation with no errors
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-26
rdt20 error scenario
Wait for call from above
snkpkt = make_pkt(data checksum)udt_send(sndpkt)
extract(rcvpktdata)deliver_data(data)udt_send(ACK)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
rdt_rcv(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp isNAK(rcvpkt)
udt_send(NAK)
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Wait for ACK or
NAK
Wait for call from
below
rdt_send(data)
GOT IT
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-27
rdt20 has a fatal flaw
What happens if ACKNAK corrupted
sender doesnrsquot know what happened at receiver
canrsquot just retransmit possible duplicate
What to do sender ACKsNAKs
receiverrsquos ACKNAK What if sender ACKNAK lost
retransmit but this might cause retransmission of correctly received pkt
Handling duplicates sender adds sequence
number to each pkt sender retransmits
current pkt if ACKNAK garbled
receiver discards (doesnrsquot deliver up) duplicate pkt
Sender sends one packet then waits for receiver response
stop and wait protocol
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-28
rdt21 sender handles garbled ACKNAKs
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
Wait for ACK or NAK 0 udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isNAK(rcvpkt) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt)
Wait for call 1 from
above
Wait for ACK or NAK 1
THE FSM GETS MESSY
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-29
rdt21 receiver handles garbled ACKNAKs
Wait for 0 from below
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq0(rcvpkt)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
Wait for 1 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq0(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp not corrupt(rcvpkt) ampamp has_seq1(rcvpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt)
sndpkt = make_pkt(ACK chksum)udt_send(sndpkt)
sndpkt = make_pkt(NAK chksum)udt_send(sndpkt)
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-30
rdt21 discussion
Sender seq added to pkt two seq rsquos (01)
will suffice Why must check if
received ACKNAK corrupted
twice as many states state must
ldquorememberrdquo whether ldquocurrentrdquo pkt has 0 or 1 seq
Receiver must check if
received packet is duplicate state indicates
whether 0 or 1 is expected pkt seq
note receiver can not know if its last ACKNAK received OK at sender
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-31
rdt22 a NAK-free protocol
same functionality as rdt21 using ACKs only
instead of NAK receiver sends ACK for last pkt received OK receiver must explicitly include seq of pkt being
ACKed
duplicate ACK at sender results in same action as NAK retransmit current pkt
This is important because TCP uses this approach (NO NAC)
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-32
rdt22 sender receiver fragments
Wait for call 0 from
above
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)
rdt_send(data)
udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) || isACK(rcvpkt1) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
Wait for ACK
0
sender FSMfragment
Wait for 0 from below
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp has_seq1(rcvpkt)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(ACK1 chksum)udt_send(sndpkt)
rdt_rcv(rcvpkt) ampamp (corrupt(rcvpkt) || has_seq1(rcvpkt))
udt_send(sndpkt)
receiver FSMfragment
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-33
rdt30 channels with errors and loss
New assumption underlying channel can also lose packets (data or ACKs) checksum seq
ACKs retransmissions will be of help but not enough
Q how to deal with loss sender waits until
certain data or ACK lost then retransmits
yuck drawbacks
Approach sender waits ldquoreasonablerdquo amount of time for ACK
retransmits if no ACK received in this time
if pkt (or ACK) just delayed (not lost) retransmission will be
duplicate but use of seq rsquos already handles this
receiver must specify seq of pkt being ACKed
requires countdown timer
What is the ldquoright valuerdquo for timer It depends on the flow and network condition
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-34
rdt30 sender
sndpkt = make_pkt(0 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
Wait for
ACK0
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt1) )
Wait for call 1 from
above
sndpkt = make_pkt(1 data checksum)udt_send(sndpkt)start_timer
rdt_send(data)
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt0)
rdt_rcv(rcvpkt) ampamp ( corrupt(rcvpkt) ||isACK(rcvpkt0) )
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt) ampamp isACK(rcvpkt1)
stop_timerstop_timer
udt_send(sndpkt)start_timer
timeout
udt_send(sndpkt)start_timer
timeout
rdt_rcv(rcvpkt)
Wait for call 0from
above
Wait for
ACK1
rdt_rcv(rcvpkt)
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-35
rdt30 in action
Timer ticktickhellip
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-36
rdt30 in action
Is it necessary to send Ack1 again
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-37
Performance of rdt30
rdt30 works but performance stinks example 1 Gbps link 15 ms e-e prop delay 1KB packet
Ttransmi
t
= 8kbpkt109 bsec
= 8 microsec
U sender utilization ndash fraction of time sender busy sending
1KB pkt every 30 msec -gt 33kBsec thruput over 1 Gbps link
network protocol limits use of physical resources
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
L (packet length in bits)R (transmission rate bps)
=
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-38
rdt30 stop-and-wait operation
first packet bit transmitted t = 0
sender receiver
RTT
last packet bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
U sender
= 008
30008 = 000027
microseconds
L R
RTT + L R =
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-39
Pipelined protocols
Pipelining sender allows multiple ldquoin-flightrdquo yet-to-be-acknowledged pkts range of sequence numbers must be
increased buffering at sender andor receiver
Two generic forms of pipelined protocols go-Back-N selective repeat
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-40
Pipelining increased utilization
first packet bit transmitted t = 0
sender receiver
RTT
last bit transmitted t = L R
first packet bit arriveslast packet bit arrives send ACK
ACK arrives send next packet t = RTT + L R
last bit of 2nd packet arrives send ACKlast bit of 3rd packet arrives send ACK
U sender
= 024
30008 = 00008
microseconds
3 L R
RTT + L R =
Increase utilizationby a factor of 3
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-41
Go-Back-N (sliding window protocol)
Sender k-bit seq in pkt header ldquowindowrdquo of up to N consecutive unackrsquoed pkts allowed
ACK(n) ACKs all pkts up to including seq n - ldquocumulative ACKrdquo Sender may receive duplicate ACKs (see receiver)
timer for each in-flight pkt timeout(n) retransmit pkt n and all higher seq pkts in
window
(For now treat seq as unlimited)
Q what happen when a receiver is totally disconnectedMAX RETRY
DONrsquoT FALL ASLEEP
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-42
GBN sender extended FSM
Wait start_timerudt_send(sndpkt[base])udt_send(sndpkt[base+1])hellipudt_send(sndpkt[nextseqnum-1])
timeout
rdt_send(data)
if (nextseqnum lt base+N) sndpkt[nextseqnum] = make_pkt(nextseqnumdatachksum) udt_send(sndpkt[nextseqnum]) if (base == nextseqnum) start_timer nextseqnum++ else refuse_data(data)
base = getacknum(rcvpkt)+1If (base == nextseqnum) stop_timer else start_timer
rdt_rcv(rcvpkt) ampamp notcorrupt(rcvpkt)
base=1nextseqnum=1
rdt_rcv(rcvpkt) ampamp corrupt(rcvpkt)
Buffer data or block higher app
No pkt in pipe
Reset timer
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-43
GBN receiver extended FSM
ACK-only always send ACK for correctly-received pkt with highest in-order seq may generate duplicate ACKs need only remember expectedseqnum
out-of-order pkt discard (donrsquot buffer) -gt no receiver buffering Re-ACK pkt with highest in-order seq
Wait
udt_send(sndpkt)
default
rdt_rcv(rcvpkt) ampamp notcurrupt(rcvpkt) ampamp hasseqnum(rcvpktexpectedseqnum)
extract(rcvpktdata)deliver_data(data)sndpkt = make_pkt(expectedseqnumACKchksum)udt_send(sndpkt)expectedseqnum++
expectedseqnum=1sndpkt = make_pkt(expectedseqnumACKchksum)
If in order pkt is received deliver to app and ack Else just drop it
We donrsquot even
need timer at th
e
receiver Simply
rely on the retx by
the sender
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-44
GBN in action
What determine the size of window
1 RTT2 Buffer at the
receiver(flow control)
3 Network congestion
Q GBN has poor performance HowSender sends pkt 123456789 pkt 1 got lost receiver got pkt 2345hellip but will discard them
Window size=N=4
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-45
Selective Repeat (improvement of the GBN Protocol) receiver individually acknowledges all
correctly received pkts buffers pkts as needed for eventual in-order
delivery to upper layer Eg sender pkt 1234hellip10 receiver got
246810 Sender resends 13579
sender only resends pkts for which ACK not received sender timer for EACH unACKed pkt
sender window N consecutive seq rsquos again limits seq s of sent unACKed pkts
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-46
Selective repeat sender receiver windows
Q why we have this
Ack is lost or ack is on its way
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-47
Selective repeat
data from above if next available seq in
window send pkt
timeout(n) for pkt n resend pkt n restart
timer
ACK(n) in [sendbasesendbase+N]
mark pkt n as received if n smallest unACKed
pkt advance window base to next unACKed seq
senderpkt n in [rcvbase
rcvbase+N-1]
send ACK(n) out-of-order buffer in-order deliver (also
deliver buffered in-order pkts) advance window to next not-yet-received pkt
pkt n in [rcvbase-Nrcvbase-1]
ACK(n)
otherwise ignore
receiver
(slide the window)
Q why we need this
The ack got lost Sender may timeout resend pkt we need to ack
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-48
Selective repeat in action (N=4)
Under GBN this pkt will be dropped
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-49
Selective repeat dilemma
Example seq rsquos 0 1 2 3 window size (N)=3
receiver sees no difference in two scenarios
incorrectly passes duplicate data as new in (a)
Q what relationship between seq size and window size
N lt= 2^k2
In real life we use k-bits to implement seq Practical issue
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-50
Why bother study reliable data transfer
We know it is provided by TCP so why bother to study
Sometimes we may need to implement ldquosome formrdquo of reliable transfer without the heavy duty TCP
A good example is multimedia streaming Even though the application is loss tolerant but if too many packets got lost it affects the visual quality So we may want to implement some for of reliable transfer
At the very least appreciate the ldquogood servicesrdquo provided by some Internet gurus
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-51
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-52
TCP Overview RFCs 793 1122 1323 2018 2581
full duplex data bi-directional data flow
in same connection MSS maximum
segment size connection-oriented
handshaking (exchange of control msgs) initrsquos sender receiver state (eg buffer size) before data exchange
flow controlled sender will not
overwhelm receiver
point-to-point one sender one
receiver (not multicast) reliable in-order byte
steam no ldquomessage
boundariesrdquo In App layer we need
delimiters pipelined
TCP congestion and flow control set window size
send amp receive bufferssocketdoor
T C Psend buffer
T C Preceive buffer
socketdoor
segm ent
applicationwrites data
applicationreads data
(The 800 lbs gorilla in the transport stack PAY ATTENTION)
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-53
TCP segment structure
source port dest port
32 bits
applicationdata
(variable length)
sequence number
acknowledgement numberReceive window
Urg data pnterchecksum
FSRPAUheadlen
notused
Options (variable length)
URG urgent data (generally not used)
ACK ACK valid
PSH push data now(generally not used)
RST SYN FINconnection estab(setup teardown
commands)
bytes rcvr willingto accept
countingby ldquobytesrdquo of data(not segments)
Internetchecksum
(as in UDP)
Due to this field we have a variable length header
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-54
TCP seq rsquos and ACKsSeq rsquos
byte stream ldquonumberrdquo of first byte in segmentrsquos data
ACKs seq of next byte
expected from other side
cumulative ACKQ how receiver
handles out-of-order segments A TCP spec
doesnrsquot say - up to implementor
Host A Host B
Seq=42 ACK=79 data = lsquoCrsquo
Seq=79 ACK=43 data = lsquoCrsquo
Seq=43 ACK=80
Usertypes
lsquoCrsquo
host ACKsreceipt
of echoedlsquoCrsquo
host ACKsreceipt of
lsquoCrsquo echoesback lsquoCrsquo
timesimple telnet scenario
Negotiate during 3-way handshake
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-55
TCP Round Trip Time and TimeoutQ how to set TCP
timeout value longer than RTT
but RTT varies too short premature
timeout unnecessary
retransmissions too long slow reaction
to segment loss poor performance
Q how to estimate RTT SampleRTT measured time
from segment transmission until ACK receipt ignore retransmissions
SampleRTT will vary want estimated RTT ldquosmootherrdquo average several recent
measurements not just current SampleRTT
tx
retx
ack
Estimated RTT
tx
retx
ack
Estimated RTT
Too long
Too short
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-56
TCP Round Trip Time and TimeoutEstimatedRTT = (1- )EstimatedRTT + SampleRTT
Exponential weighted moving average influence of past sample decreases
exponentially fast typical value = 0125
ERTT(0) = 0
ERTT(1) = (1- )ERTT(0) + SRTT(1)= SRTT(1)
ERTT(2) =(1- ) SRTT(1) + SRTT(2)
ERTT(3) = (1- )(1- ) SRTT(1) + (1- ) SRTT(2) + SRTT(3)
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-57
Example RTT estimationRTT gaiacsumassedu to fantasiaeurecomfr
100
150
200
250
300
350
1 8 15 22 29 36 43 50 57 64 71 78 85 92 99 106
time (seconnds)
RTT
(mill
isec
onds
)
SampleRTT Estimated RTT
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-58
TCP Round Trip Time and TimeoutSetting the timeout (by JacobsonKarel) EstimtedRTT plus ldquosafety marginrdquo
large variation in EstimatedRTT -gt larger safety margin first estimate of how much SampleRTT deviates from
EstimatedRTT
TimeoutInterval = EstimatedRTT + 4DevRTT
DevRTT = (1-)DevRTT + |SampleRTT-EstimatedRTT|
(typically = 025)
Then set timeout interval
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-59
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-60
TCP reliable data transfer
TCP creates rdt service on top of IPrsquos unreliable service
Pipelined segments (for performance)
Cumulative acks TCP uses single
retransmission timer
Retransmissions are triggered by timeout events duplicate ack ( for
performance reason)
Initially consider simplified TCP sender ignore duplicate
acks ignore flow control
congestion control
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-61
TCP sender eventsdata rcvd from app Create segment with
seq seq is byte-stream
number of first data byte in segment
start timer if not already running (think of timer as for oldest unacked segment)
expiration interval TimeOutInterval
timeout retransmit segment
that caused timeout restart timer Ack rcvd If acknowledges
previously unacked segments update what is
known to be acked start timer if there
are outstanding segments
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-62
TCP sender(simplified)
NextSeqNum = InitialSeqNum SendBase = InitialSeqNum
loop (forever) switch(event)
event data received from application above create TCP segment with sequence number NextSeqNum if (timer currently not running) start timer pass segment to IP NextSeqNum = NextSeqNum + length(data)
event timer timeout retransmit not-yet-acknowledged segment with smallest sequence number start timer
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer
end of loop forever
Commentbull SendBase-1 last cumulatively ackrsquoed byteExamplebull SendBase-1 = 71y= 73 so the rcvrwants 73+ y gt SendBase sothat new data is acked
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-63
TCP retransmission scenarios
Host A
Seq=100 20 bytes data
ACK=100
timepremature timeout
Host B
Seq=92 8 bytes data
ACK=120
Seq=92 8 bytes data
Seq=
92
tim
eout
ACK=120
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
lost ACK scenario
Host B
X
Seq=92 8 bytes data
ACK=100
time
Seq=
92
tim
eout
SendBase= 100
SendBase= 120
SendBase= 120
Sendbase= 100
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-64
TCP retransmission scenarios (more)
Host A
Seq=92 8 bytes data
ACK=100
loss
tim
eout
Cumulative ACK scenario
Host B
X
Seq=100 20 bytes data
ACK=120
time
SendBase= 120
Room for improvement
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-65
TCP ACK generation [RFC 1122 RFC 2581]
Event at Receiver
Arrival of in-order segment withexpected seq All data up toexpected seq already ACKed
Arrival of in-order segment withexpected seq One other segment has ACK pending
Arrival of out-of-order segmenthigher-than-expect seq Gap detected
Arrival of segment that partially or completely fills gap
TCP Receiver action
Delayed ACK Wait up to 500msfor next segment If no next segmentsend ACK
Immediately send single cumulative ACK ACKing both in-order segments
Immediately send duplicate ACK indicating seq of next expected byte
Immediate send ACK provided thatsegment startsat lower end of gap
Ack the ldquolargest in-order byterdquo seq
REDUCE FEEDBACK TRAFFIC BY HALF
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-66
Fast Retransmit
Time-out period often relatively long long delay before
resending lost packet
Detect lost segments via duplicate ACKs Sender often sends
many segments back-to-back
If segment is lost there will likely be many duplicate ACKs
If sender receives 3 ACKs for the same data it supposes that segment after ACKed data was lost fast retransmit
resend segment before timer expires
timeout
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-67
event ACK received with ACK field value of y if (y gt SendBase) SendBase = y if (there are currently not-yet-acknowledged segments) start timer else increment count of dup ACKs received for y if (count of dup ACKs received for y = 3) resend segment with sequence number y
Fast retransmit algorithm
a duplicate ACK for already ACKed segment
fast retransmitQ why resend pkt
with seq y
A That is what the receiver expect
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-68
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-69
TCP Flow Control
receive side of TCP connection has a receive buffer
speed-matching service matching the send rate to the receiving apprsquos drain rate app process may
be slow at reading from buffer
sender wonrsquot overflow
receiverrsquos buffer bytransmitting too
much too fast
flow control
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-70
TCP Flow control how it works
(Suppose TCP receiver discards out-of-order segments)
spare room in buffer= RcvWindow
= RcvBuffer-[LastByteRcvd - LastByteRead]
Rcvr advertises spare room by including value of RcvWindow in segments
Sender limits unACKed data to RcvWindow guarantees receive
buffer doesnrsquot overflow
This goes to show that the design process of header is important
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-71
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-72
TCP Connection Management
Recall TCP sender receiver establish ldquoconnectionrdquo before exchanging data segments
initialize TCP variables seq s buffers flow control info
(eg RcvWindow) client connection initiator Socket clientSocket = new
Socket(hostnameport
number) server contacted by client Socket connectionSocket =
welcomeSocketaccept()
Three way handshake
Step 1 client host sends TCP SYN segment to server specifies initial seq no data
Step 2 server host receives SYN replies with SYN-ACK segment
server allocates buffers specifies server initial seq
Step 3 client receives SYN-ACK
replies with ACK segment which may contain data
IMPORTANT SYN FLOODING
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-73
TCP three-way handshake
Connection
request Connection granted
SYN=1 seq=client_isn
SYN=1 seq=server_isn
Ack=client_isn+1
Syn=0 seq=client_isn+1
Ack=server_isn+1
ACK
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-74
TCP Connection Management (cont)
Closing a connection
client closes socket clientSocketclose()
Step 1 client end system sends TCP FIN control segment to server
Step 2 server receives FIN replies with ACK Closes connection sends FIN
client
FIN
server
ACK
ACK
FIN
close
close
closed
tim
ed w
ait
Q why donrsquot we combine ACK and FIN
Sender may have some data in the pipeline
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-75
TCP Connection Management (cont)
Step 3 client receives FIN replies with ACK
Enters ldquotimed waitrdquo - will respond with ACK to received FINs
Step 4 server receives ACK Connection closed
Note with small modification can handle simultaneous FINs
client
FIN
server
ACK
ACK
FIN
closing
closing
closed
tim
ed w
ait
closed
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-76
TCP Connection Management (cont)
TCP clientlifecycle
TCP serverlifecycle
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-77
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-78
Principles of Congestion Control
Congestion informally ldquotoo many sources sending
too much data too fast for network to handlerdquo
different from flow control manifestations
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
another top-10 problem
TCP provides one of the MANY WAYS to perform CC
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-79
Causescosts of congestion scenario 1
two senders two receivers (homogeneous)
one router infinite buffers capacity C
no retransmission
large delays when congested
maximum achievable throughput
unlimited shared output link buffers
Host Ain original data
Host B
out
From application To application
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-80
Causescosts of congestion scenario 2
one router finite buffers sender retransmission of lost
packet
finite shared output link buffers
Host A in original data
Host B
out
in original data plus retransmitted data
Due to transport layer
Pkt got dropped
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-81
Causescosts of congestion scenario 2 always (goodput)
ldquoperfectrdquo retransmission only when loss
retransmission of delayed (not lost) packet makes
larger (than perfect case) for same
in
out
=
in
out
gt
in
out
ldquocostsrdquo of congestion more work (retrans) for given ldquogoodputrdquo unneeded retransmissions link carries multiple copies of
pkt
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-82
Causescosts of congestion scenario 3 four senders multihop paths timeoutretransmit
in
Q what happens as and increase
in
finite shared output link buffers
Host Ain original data
Host B
out
in original data plus retransmitted data
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-83
Causescosts of congestion scenario 3
Another ldquocostrdquo of congestion when packet dropped any ldquoupstream
transmission capacity used for that packet was wasted
Host A
Host B
o
u
t
System collapses (eg students)
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-84
Approaches towards congestion control
End-end congestion control
no explicit feedback from network
congestion inferred from end-system observed loss delay
approach taken by TCP
Network-assisted congestion control
routers provide feedback to end systems single bit indicating
congestion (SNA DECbit TCPIP ECN ATM)
explicit rate sender should send at
Two broad approaches towards congestion control
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-85
Case study ATM ABR congestion control
ABR available bit rate
ldquoelastic servicerdquo if senderrsquos path
ldquounderloadedrdquo sender should use
available bandwidth if senderrsquos path
congested sender throttled to
minimum guaranteed rate
RM (resource management) cells
sent by sender interspersed with data cells
bits in RM cell set by switches (ldquonetwork-assistedrdquo) NI bit no increase in rate
(mild congestion) CI bit congestion indication
RM cells returned to sender by receiver with bits intact
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-86
Case study ATM ABR congestion control
two-byte ER (explicit rate) field in RM cell congested switch may lower ER value in cell senderrsquo send rate thus minimum supportable rate on path
EFCI (explicit forward congestion indication) bit in cells set to 1 in congested switch if data cell preceding RM cell has EFCI set receiver sets CI
bit in returned RM cell
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-87
Chapter 3 outline
31 Transport-layer services
32 Multiplexing and demultiplexing
33 Connectionless transport UDP
34 Principles of reliable data transfer
35 Connection-oriented transport TCP segment structure reliable data transfer flow control connection
management
36 Principles of congestion control
37 TCP congestion control
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-88
TCP Congestion Control
end-end control (no network assistance)
sender limits transmission LastByteSent-LastByteAcked
CongWin Roughly
CongWin is dynamic function of perceived network congestion
How does sender perceive congestion
loss event = timeout or 3 duplicate acks
TCP sender reduces rate (CongWin) after loss event
three mechanisms AIMD slow start conservative after
timeout events
rate = CongWin
RTT Bytessec
Note CC must be efficient to make use of available BW
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-89
TCP AIMD
8 Kbytes
16 Kbytes
24 Kbytes
time
congestionwindow
multiplicative decrease cut CongWin in half after loss event
additive increase increase CongWin by 1 MSS every RTT in the absence of loss events probing
Long-lived TCP connection
Role of ACK1 An indication of
loss2 Ack is self
clocking if delay is large the rate of congestion window will be reduced
Human analogy HK government or CUHK
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-90
TCP Slow Start
When connection begins CongWin = 1 MSS Example MSS = 500
bytes amp RTT = 200 msec
initial rate = 20 kbps
available bandwidth may be gtgt MSSRTT desirable to quickly
ramp up to respectable rate
When connection begins increase rate exponentially fast until first loss event
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-91
TCP Slow Start (more)
When connection begins increase rate exponentially until first loss event double CongWin every
RTT done by incrementing CongWin for every ACK received
Summary initial rate is slow but ramps up exponentially fast
Host A
one segment
RTT
Host B
time
two segments
four segments
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-92
Refinement After 3 dup ACKs
CongWin is cut in half window then grows linearly This is known as ldquofast-recoveryrdquo
phase Implemented in new TCP-Reno
But after timeout event CongWin instead set to 1 MSS window then grows exponentially
threshold then grows linearly
bull 3 dup ACKs indicates network capable of delivering some segmentsbull timeout before 3 dup ACKs is ldquomore alarmingrdquo
Philosophy
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-93
Refinement (more)Q When should the
exponential increase switch to linear
A When CongWin gets to 12 of its value before timeout
Implementation Variable Threshold At loss event Threshold
is set to 12 of CongWin just before loss event
0
2
4
6
8
10
12
14
1 2 3 4 5 6 7 8 9 10 11 12 13 14 15
Transmission round
con
ge
stio
n w
ind
ow
siz
e
(se
gm
en
ts)
threshold
TCP Tahoe
TCP Reno
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-94
Summary TCP Congestion Control When CongWin is below Threshold sender
in slow-start phase window grows exponentially
When CongWin is above Threshold sender is in congestion-avoidance phase window grows linearly
When a triple duplicate ACK occurs Threshold set to CongWin2 and CongWin set to Threshold
When timeout occurs Threshold set to CongWin2 and CongWin is set to 1 MSS
READ THE BOOK on TCP-Vegas instead of react to a loss anticipate amp prepare for a loss
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-95
TCP sender congestion control
Event State TCP Sender Action Commentary
ACK receipt for previously unacked data
Slow Start (SS)
CongWin = CongWin + MSS If (CongWin gt Threshold) set state to ldquoCongestion Avoidancerdquo
Resulting in a doubling of CongWin every RTT
ACK receipt for previously unacked data
CongestionAvoidance (CA)
CongWin = CongWin+MSS (MSSCongWin)
Additive increase resulting in increase of CongWin by 1 MSS every RTT
Loss event detected by triple duplicate ACK
SS or CA Threshold = CongWin2 CongWin = ThresholdSet state to ldquoCongestion Avoidancerdquo
Fast recovery implementing multiplicative decrease CongWin will not drop below 1 MSS
Timeout SS or CA Threshold = CongWin2 CongWin = 1 MSSSet state to ldquoSlow Startrdquo
Enter slow start
Duplicate ACK
SS or CA Increment duplicate ACK count for segment being acked
CongWin and Threshold not changed
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-96
TCP throughput
Whatrsquos the average throughout ot TCP as a function of window size and RTT Ignore slow start
Let W be the window size when loss occurs
When window is W throughput is WRTT
Just after loss window drops to W2 throughput to W2RTT
Average throughout 75 WRTT
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-97
TCP Futures
Example 1500 byte segments 100ms RTT want 10 Gbps throughput
Requires window size W = 83333 in-flight segments
Throughput in terms of loss rate
L = 210-10 Wow New versions of TCP for high-speed
needed
LRTT
MSS221
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-98
Fairness goal if K TCP sessions share same bottleneck link of bandwidth R each should have average rate of RK
TCP connection 1
bottleneckrouter
capacity R
TCP connection 2
TCP Fairness
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-99
Why is TCP fair
Two competing homogeneous sessions (eg similar propagation delayetc)
Additive increase gives slope of 1 as throughout increases
multiplicative decrease decreases throughput proportionally
R
R
equal bandwidth share
Connection 1 throughputCon
necti
on
2 t
hro
ug
hp
ut
congestion avoidance additive increase
loss decrease window by factor of 2congestion avoidance additive
increase
loss decrease window by factor of 2
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-100
Fairness (more)
Fairness and UDP Multimedia apps
often do not use TCP do not want rate
throttled by congestion control
Instead use UDP pump audiovideo
at constant rate tolerate packet loss
Research area TCP friendly
Fairness and parallel TCP connections
nothing prevents app from opening parallel cnctions between 2 hosts
Web browsers do this Example link of rate R
supporting 9 connections new app asks for 1 TCP
gets rate R10 new app asks for 11 TCPs
gets around R2
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-101
Delay modeling
Q How long does it take to receive an object from a Web server after sending a request
Delay is influenced by TCP connection
establishment data transmission delay slow start Senderrsquos congestion
window
Notation assumptions Assume one link between client and
server of rate R S MSS (bits) O object size (bits) no retransmissions (no loss no
corruption) Protocolrsquos overhead is negligible
Window size First assume fixed congestion
window W segments Then dynamic window modeling
slow start
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-102
Fixed congestion window (1) assume no congestion window constratint
First caseWSR gt RTT + SR ACK
for first segment in window returns before windowrsquos worth of data sent
delay = 2RTT + OR
Object request is
piggybacked
This is the ldquolower boundrdquo of latency
Let W denote a lsquofixedrsquo congestion window size (a positive integer)
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-103
Fixed (or static) congestion window (2)
Second case WSR lt RTT + SR
wait for ACK after sending windowrsquos worth of data sent
delay = 2RTT + OR+ (K-1)[SR + RTT - WSR]
Where K be the of windows of data that cover the objectIf O is the ldquosizerdquo of the object we have K = OWS (round to an integer)
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-104
TCP Delay Modeling Slow Start (1)
Now suppose window grows according to slow start
Will show that the delay for one object is
R
S
R
SRTTP
R
ORTTLatency P )12(2
where P is the number of times TCP idles at server
1min KQP
- where Q is the number of times the server idles if the object were of infinite size
- and K is the number of windows that cover the object
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-105
TCP Delay Modeling Slow Start (2)
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Examplebull OS = 15 segmentsbull K = 4 windowsbull Q = 2bull P = minK-1Q = 2
Server idles P=2 times
Delay componentsbull 2 RTT for connection establishment and requestbull OR to transmit objectbull time server idles due to slow start
Server idles P = minK-1Q times
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-106
TCP Delay Modeling (3)
R
S
R
SRTTPRTT
R
O
R
SRTT
R
SRTT
R
O
idleTimeRTTR
O
P
kP
k
P
pp
)12(][2
]2[2
2delay
1
1
1
th window after the timeidle 2 1 kR
SRTT
R
S k
ementacknowledg receivesserver until
segment send tostartsserver whenfrom time RTTR
S
window kth the transmit totime2 1
R
Sk
RTT
initia te TCPconnection
requestobject
first w indow= S R
second w indow= 2S R
third w indow= 4S R
fourth w indow= 8S R
com pletetransm issionobject
delivered
tim e atc lient
tim e atserver
Where k=12hellipK
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-107
TCP Delay Modeling (4)
)1(log
)1(logmin
12min
222min
222min
2
2
110
110
S
OS
Okk
S
Ok
SOk
OSSSkK
k
k
k
Calculation of Q number of idles for infinite-size objectis similar (see HW)
Recall K = number of windows that cover object
How do we calculate K
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-108
Experiment A
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 286 sec 1 288 sec 289 sec
100 kbps 80 sec 2 82 sec 84 sec
1 Mbps 800 msec 5 10 sec 15 sec
10 Mbps 80 msec 7 028 sec 098 sec
S= 536 bytes RTT=100 msec O=100 kbytes (relatively large)
1 Slow start adds appreciable delay only when R is high If R is low ACK comes back quickly and TCP quickly ramps up to its maximum rate
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-109
Experiment B
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 1 163 sec 173 sec
100 kbps 04 sec 2 06 sec 076 sec
1 Mbps 40 msec 3 024 sec 052 sec
10 Mbps 4 msec 3 020 sec 050 sec
S= 536 bytes RTT=100 msec O = 5 kbytes (relatively small)
1 Slow start adds appreciable delay when R is high and for a relatively small object
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-110
Experiment C
R OR P Min latencyOR+2 RTT
Latency withSlow start
28 kbps 143 sec 3 34 sec 58 sec
100 kbps 04 sec 3 24 sec 52 sec
1 Mbps 40 msec 3 20 sec 50 sec
10 Mbps 4 msec 3 20 sec 50 sec
S= 536 bytes RTT=1 sec O = 5 kbytes (relatively small)
1 Slow start can significantly increase the latency when the object size is relatively small and the RTT is relatively large
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-111
HTTP Modeling Assume Web page consists of
1 base HTML page (of size O bits) M images (each of size O bits)
Non-persistent HTTP M+1 TCP connections in series Response time = (M+1)OR + (M+1)2RTT + sum of
idle times Persistent HTTP
2 RTT to request and receive base HTML file 1 RTT to request and receive M images Response time = (M+1)OR + 3RTT + sum of idle
times Non-persistent HTTP with X parallel connections
Suppose MX integer 1 TCP connection for base file MX sets of parallel connections for images Response time = (M+1)OR + (MX + 1)2RTT + sum of
idle times
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-112
02468
101214161820
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT = 100 msec O = 5 Kbytes M=10 and X=5
For low bandwidth connection amp response time dominated by transmission time
Persistent connections only give minor improvement over parallel connections
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-113
0
10
20
30
40
50
60
70
28Kbps
100Kbps
1Mbps
10Mbps
non-persistent
persistent
parallel non-persistent
HTTP Response time (in seconds)RTT =1 sec O = 5 Kbytes M=10 and
X=5
For larger RTT response time dominated by TCP establishment amp slow start delays Persistent connections now give important improvement particularly in high delaybandwidth networks
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo
3-114
Chapter 3 Summary principles behind transport
layer services multiplexing
demultiplexing reliable data transfer flow control congestion control
instantiation and implementation in the Internet UDP TCP
Next leaving the
network ldquoedgerdquo (application transport layers)
into the network ldquocorerdquo