spring 2006cs 3321 reliable byte-stream (tcp) outline connection establishment/termination sliding...
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Spring 2006 CS 332 1
Reliable Byte-Stream (TCP)
OutlineConnection Establishment/TerminationSliding Window Revisited Flow ControlAdaptive Timeout
Spring 2006 CS 332 2
End-to-End Protocols• Underlying best-effort network
– drops messages– re-orders messages– delivers duplicate copies of a given message– limits messages to some finite size– delivers messages after an arbitrarily long delay
• Common end-to-end services– guarantee message delivery– deliver messages in the same order they are sent– deliver at most one copy of each message– support arbitrarily large messages– support synchronization (between sender and receiver)– allow the receiver to flow control the sender– support multiple application processes on each host
Spring 2006 CS 332 3
Simple Demultiplexer (UDP)• Extends host-to-host service into process-to-
process• Unreliable and unordered datagram service• Adds multiplexing• No flow control• Endpoints identified by ports (why not PID?)
– servers have well-known ports (clients don’t need this)• Often just starting point
– see /etc/services on Unix
– Implemented as message queue
Spring 2006 CS 332 4
Simple Demultiplexer (UDP)• Header format
– Note 16 bit port number (so only 64K ports)
– Process really identified via <port,host> pair
• Checksum (optional in IPv4, mandatory in IPv6)– psuedo header + UDP header + data
• Pseudo header: Protocol number Source IP Dest IP UDP length field
Why?
SrcPort DstPort
Checksum Length
Data
0 16 31
Spring 2006 CS 332 5
TCP Overview
• Connection-oriented• Byte-stream
– app writes bytes– TCP sends segments– app reads bytes
Application process
Writebytes
TCPSend buffer
Segment Segment Segment
Transmit segments
Application process
Readbytes
TCPReceive buffer
…
… …
• Full duplex• Flow control: keep sender from
overrunning receiver• Congestion control: keep sender
from overrunning network
Spring 2006 CS 332 6
Flow Control vs Congestion Control
• Flow Control– Prevent sender from overloading receiver
– End-to-end issue
• Congestion Control– Prevent too much data from being injected into network
– Concerned with how hosts and network interact
Spring 2006 CS 332 7
Data Link Reliability (text 2.5)
Wherein we look at reliability issues on a point-to-point link! Error correcting codes can’t handle all possible errors (without introducing lots of overhead--including this is not designing for normal situation), so badly garbled frames are dropped. We need a way to recover from these lost frames.
Spring 2006 CS 332 8
Acks and Timeouts• Acknowledgement (ACK)
– Small frame sent to peer indicating receipt of frame
– No data
– Piggybacking
• Timeout– If ACK not received within reasonable time, original
frame is retransmitted
• Automatic Repeat Request (ARQ)– General strategy of using ACKS and timeouts to
implement reliable delivery
Spring 2006 CS 332 11
A Subtlety…
• Consider scenarios (c) and (d) in previous slide.– Receiver receives two good frames (duplicate)
– It may deliver both to higher layer protocol (not good!)
– Solution: 1-bit sequence number in frame header
Spring 2006 CS 332 12
Stop-and-Wait
• Problem: keeping the pipe full• Example
– 1.5Mbps link x 45ms RTT = 67.5Kb (8KB)
– 1KB frames implies 1/8th link utilization (Next slide)
Sender Receiver
Spring 2006 CS 332 13
Bandwidth x Delay Product
• Sending a 1KB packet in 45ms implies sending at rate of (1024 x 8)/0.045 = 182 Kbps, or 1/8 of bandwidth.
• Bandwidth-delay: The number of bits that fits in the pipe in a single round trip. (I.e. the amount of data that could be “in transit” at any given time.)
• Goal: Want to be able to send this much data before getting first ACK. (called keeping the pipe full)
Spring 2006 CS 332 14
Sliding Window• Allow multiple outstanding (un-ACKed) frames• Upper bound on un-ACKed frames, called window
Sender Receiver
Tim
e
……
Spring 2006 CS 332 15
Sliding Window: Sender• Assign sequence number to each frame (SeqNum)• Maintain three state variables:
– send window size (SWS)– last acknowledgment received (LAR)– last frame sent (LFS)
• Maintain invariant: LFS - LAR ≤ SWS
• Advance LAR when ACK arrives • Buffer up to SWS frames (must be prepared to retransmit
frames until they are ACKed)
SWS
LAR LFS
… …
Spring 2006 CS 332 16
Sliding Window: Receiver• Maintain three state variables
– receive window size (RWS) (upper bound on # out-of-order frames)
– largest frame acceptable (LFA) (sequence # of)– last frame received (LFR)
• Maintain invariant: LFA - LFR ≤ RWS
• Frame SeqNum arrives:– if LFR < SeqNum ≤ LFA accept– if SeqNum ≤ LFR or SeqNum > LFA discard
• Send cumulative ACKs
RWS
LFR LFA
… …
Spring 2006 CS 332 17
Note:
• When packet loss occurs, pipe is no longer kept full!
• Longer it takes to notice lost packet, worst the condition becomes
• Possible solutions:– Send NACKs
– Selective acknowledgements (just ACK exactly those frames received, not highest frame received)
– Not used: too much added complexity
Spring 2006 CS 332 18
Sequence Number Space• SeqNum field is finite; sequence numbers wrap
around• Sequence number space must be larger then
number of outstanding frames (I.e. stop-and-wait had 2 # space)– I.e. if sequence number space is of size 8 (say 0..7), and
number of outstanding frames is allowed to be 10, then sender can send sequence numbers 0,1,2,3,4,5,6,7,0,1 all at once. Now if receiver sends back an ACK with sequence number 1, which packet 1 is it ACKing?
Spring 2006 CS 332 19
Sequence Number Space• Even SWS < SequenceSpaceSize is not sufficient
– suppose 3-bit SeqNum field (0..7) (so SequenceSpaceSize = 8)– Let SWS=RWS=7– sender transmit frames 0..6– Frames arrive successfully, but ACKs are lost– sender retransmits 0..6– receiver expecting 7, 0..5, but receives second incarnation of 0..5
(because the receiver has at this point updated its various pointers)
• SWS ≤ (SequenceSpaceSize+1)/2 is rule (if SWS=RWS)
• Intuitively, SeqNum “slides” between two halves of sequence number space
Spring 2006 CS 332 20
Easy to overlook…
• Relationship between window size and sequence number space depends on assumption that frames are not reordered in transit (easy to assume on point-to-point link).
Spring 2006 CS 332 22
Data Link Versus Transport• Transport potentially connects many different hosts
– need explicit connection establishment and termination
• Transport has potentially different RTT (over different routes and at different times, even on scale of minutes)– need adaptive timeout mechanism
• Transport has potentially long delay in network– need to be prepared for arrival of very old packets
• Transport has potentially different capacity at destination – need to accommodate different node capacity
• Transport has potentially different network capacity– need to be prepared for network congestion
Spring 2006 CS 332 23
The “End-to-End” Argument• Consider TCP vs X.25• TCP: Consider underlying IP network unreliable
and use sliding window to provide end-to-end in-order reliable delivery
• X.25: Use sliding window within network on hop-by-hop basis (which should guarantee end-to-end). Several problems with this:– No guarantee that added hop preserves service– In link from A to B to C, no guarantee that B behaves
perfectly (nodes known to introduce errors and mix packet order)
Spring 2006 CS 332 24
End-to-End
• “A function should not be provided in the lower levels of the system unless it can be completely and correctly implemented at that level”
• Does allow for functions to be incompletely provided at lower levels for optimization– E.g. detecting and retransmitting single corrupt packet
across one hop preferable to retransmitting entire file end-to-end.
• See reading assignment on class homework page
Spring 2006 CS 332 25
Segment Format
Options (variable)
Data
Checksum
SrcPort DstPort
HdrLen 0 Flags
UrgPtr
AdvertisedWindow
SequenceNum
Acknowledgment
0 4 10 16 31
Spring 2006 CS 332 26
Segment Format (cont)• Each connection identified with 4-tuple:
– (SrcPort, SrcIPAddr, DestPort, DestIPAddr)
• Sliding window and flow control– acknowledgment, SequenceNum, AdvertisedWindow
• Flags– SYN, FIN, RESET, PUSH, URG, ACK
• Checksum– pseudo header + TCP header + data
Sender
Data (SequenceNum)
Acknowledgment +AdvertisedWindow
Receiver
Spring 2006 CS 332 27
Connection Establishment and Termination
Active participant(client)
Passive participant(server)
SYN, SequenceNum = x
SYN + ACK, SequenceNum = y,
ACK, Acknowledgment = y + 1
Acknowledgment = x + 1
Note: SequenceNumcontains the sequencenumber of the first data byte containedin the segment. ACKfield always gives thesequence number ofthe next data byte expected. (Except forthe SYN segments)
Spring 2006 CS 332 28
State Transition DiagramCLOSED
LISTEN
SYN_RCVD SYN_SENT
ESTABLISHED
CLOSE_WAIT
LAST_ACKCLOSING
TIME_WAIT
FIN_WAIT_2
FIN_WAIT_1
Passive open Close
Send/SYNSYN/SYN + ACK
SYN + ACK/ACK
SYN/SYN + ACK
ACK
Close/FIN
FIN/ACKClose/FIN
FIN/ACKACK + FIN/ACK Timeout after two segment lifetimes
FIN/ACK
ACK
ACK
ACK
Close/FIN
Close
CLOSED
Active open/SYN
Openingconnection
Closingconnection
event/action
Spring 2006 CS 332 29
Sliding Window Revisited
• Sending side– LastByteAcked ≤ LastByteSent
– LastByteSent ≤ LastByteWritten
– buffer bytes between LastByteAcked and LastByteWritten
Sending application
LastByteWritten
TCP
LastByteSentLastByteAcked
Receiving application
LastByteRead
TCP
LastByteRcvdNextByteExpected
• Receiving side– LastByteRead < NextByteExpected
– NextByteExpected ≤ LastByteRcvd +1
– buffer bytes between LastByteRead and LastByteRcvd
Spring 2006 CS 332 30
Flow Control
• Send buffer size: MaxSendBuffer• Receive buffer size: MaxRcvBuffer• Receiving side
– LastByteRcvd - LastByteRead ≤ MaxRcvBuffer– AdvertisedWindow = MaxRcvBuffer - (LastByteRcvd - LastByteRead)
• Sending side– LastByteSent - LastByteAcked ≤ AdvertisedWindow– EffectiveWindow = AdvertisedWindow - (LastByteSent - LastByteAcked)
– LastByteWritten - LastByteAcked ≤ MaxSendBuffer– block sender if (LastByteWritten - LastByteAcked) + y > MaxSenderBuffer
Spring 2006 CS 332 31
Flow Control
• Always send ACK in response to arriving data segment– This response contains latest Acknowledge and AdvertisedWindow fields even if they haven’t changed
• Problem: How does the sending side know when the advertised window is no longer 0?– It can’t get this info, since receiver only sends window advertisements
in response to received packets, and sender can’t send anything because it believes the window size is zero.
• Solution: Persist when AdvertisedWindow = 0– Periodically send a probe segment with one byte of data. Although
most won’t be accepted, they trigger responses, and eventually one will come back with a nonzero advertised window.
Spring 2006 CS 332 32
Protection Against Wrap Around
• 32-bit SequenceNum
Bandwidth Time Until Wrap AroundT1 (1.5 Mbps) 6.4 hoursEthernet (10 Mbps) 57 minutesT3 (45 Mbps) 13 minutesFDDI (100 Mbps) 6 minutesSTS-3 (155 Mbps) 4 minutesSTS-12 (622 Mbps) 55 secondsSTS-24 (1.2 Gbps) 28 seconds
Spring 2006 CS 332 33
Keeping the Pipe Full
• 16-bit AdvertisedWindow
Bandwidth Delay x Bandwidth ProductT1 (1.5 Mbps) 18KBEthernet (10 Mbps) 122KBT3 (45 Mbps) 549KBFDDI (100 Mbps) 1.2MBSTS-3 (155 Mbps) 1.8MBSTS-12 (622 Mbps) 7.4MBSTS-24 (1.2 Gbps) 14.8MB
Results below assumeRTT of 100 ms, typical for cross-country link
Spring 2006 CS 332 34
TCP Extensions
• Implemented as header options• Store timestamp in outgoing segments• Extend sequence space with 32-bit timestamp:
PAWS (Protection Against Wrapped Sequence Numbers)
• Shift (scale) advertised window
Spring 2006 CS 332 35
Adaptive Retransmission(Original Algorithm)
• Measure SampleRTT for each segment/ACK pair
• Compute weighted average of RTT
between 0.8 and 0.9 (recommended value 0.9)– Note in this range has a strong smoothing effect
• Set timeout based on EstRTT– TimeOut = 2 x EstRTT (rather conservative)
SampleRTT)1(EstRTTEstRTT ×−+×=
Spring 2006 CS 332 36
Karn/Partridge Algorithm
• Problem: ACK doesn’t acknowledge a transmission (it acks a receive)• Do not sample RTT when retransmitting • Double timeout after each retransmission (exponential backoff)
Sender Receiver
Original transmission
ACK
Sam
pleR
TT
Retransmission
Sender Receiver
Original transmission
ACK
Sam
pleR
TT
Retransmission
Why?
Spring 2006 CS 332 37
A Problem
• Problem with both these approaches: they can’t keep up with wide RTT fluctuations, thus causing unnecessary retransmissions
• When the network is already loaded, unnecessary retransmissions add to the network load (as Stevens notes, “It is the network equivalent of pouring gasoline on a fire”)
• What’s needed: keep track of the variance in RTT measurements AND use smooth RTT estimator.
Spring 2006 CS 332 38
Jacobson/ Karels Algorithm• New Calculations for average RTT • Diff = sampleRTT - EstRTT• EstRTT = EstRTT + ( g x Diff)
– Recommended value for g is 0.125– EstRTT is just the smoothed RTT as before
• Dev = Dev + h ( |Diff| - Dev)– Recommended value for h is 0.25– Dev is the smoothed mean deviation (easier to compute mean that
standard deviation, which requires a square root)• TimeOut = EstRTT + x Dev
– Larger gain for the deviation makes the TimeOut value increase faster when the RTT changes.
• Notes– algorithm only as good as granularity of clock (500ms on Unix)– accurate timeout mechanism important to congestion control (later)
Note thesevalues?
Spring 2006 CS 332 39
TCP Interactive Data Flow
• Material here is from TCP/IP Illustrated, Vol. 1• Study by Caceres, et. al. (1991) :
– On a packet count basis, about half of all TCP segments contain bulk data (ftp, email, Usenet news)
– Half contain interactive data (telnet, rlogin)
– On byte count basis, ratio is around 90% bulk transfer, 10% interactive.
– Bulk data tends to be full size (normally 512 bytes of data), interactive is much smaller (90% of telnet and rlogin packets carry less than 10 bytes of data).
Spring 2006 CS 332 40
Rlogin and Telnet
• Surprisingly, each interactive keystroke typically generates a packet (as opposed to a line generating a packet).
• Moreover, a single rlogin keystroke can generate 4 segments (though usually 3)
i. Interactive keystroke from clientii. ACK of keystroke from server (typically piggybacked
in echo of data byte) see next slideiii. Echo of data byte from serveriv. ACK of echoed byte from client
Spring 2006 CS 332 41
Delayed ACKs
• Normally, TCP does not send an ACK the instant it receives data. Instead, it delays the ACK, hoping to have data going in other direction on which it can piggyback the ACK.
• Most implementations use a 200ms delay (delays ACK up to 200ms before sending the ACK by itself)
• This is why in previous slide, ACK would normally piggyback with the echoed character
Spring 2006 CS 332 42
Nagle Algorithm
• 1 byte data segment generates 41 byte packets (20 for IP header + 20 for TCP header).
• Small packets are called tinygrams– On LANs, usually not an issue, but on WANs, this can be
a problem (it adds congestion)
• Solution: Nagle Algorithm (RFC 896, Nagle, 1984): When a TCP connection has outstanding data that has not yet been Acked, small segments cannot be sent until the outstanding data is acknowledged.
Spring 2006 CS 332 43
Nagle Algorithm (continued)
• Nagle is self-clocking: the faster the ACKs come back, the faster the data is sent. But on slow WAN, where tinygrams can be a problem, fewer segments are sent.– Ex. On LAN, time for single byte to be sent, ACKed
and echoed is around 16ms. To generate data at this rate, you need to be typing around 60 characters per second (so on LAN you don’t kick in Nagle)
– On WAN, you’ll often kick in Nagle
Spring 2006 CS 332 44
Disabling the Nagle Algorithm• Why would you want to?
– X Window system: small messages (mouse movements) need to be delivered without delay
– Typing one of the terminals special function keys during interactive login
• Function keys normally generate multiple bytes of data, beginning with ASCII escape character. If TCP gets data a byte at a time, it can potentially send first byte and then hold the rest of the characters. The server wouldn’t generate the ACK until it received the rest of the command, so Nagle would kick in, meaning rest of bytes not sent for 200ms, which can be a noticeable delay.
• With sockets API, the TCP_NODELAY option disables Nagle
• Host Requirements RFCs (1122, 1123) specify that there must be a way for an app to disable Nagle on an individual TCP connection.