transport layer our goals: r understand principles behind transport layer services: m...

Transport Layer Our goals: r understand principles behind transport layer services: m multiplexing/demultipl exing m reliable data transfer m flow control m congestion control r learn about transport layer protocols in the Internet: m UDP: connectionless transport m TCP: connection-oriented transport m TCP congestion control

Transport Layer Topics r Review: multiplexing, connection and connectionless transport, services provided by a transport layer r UDP r Reliable transport m Tools for reliable transport layer Error detection, ACK/NACK, ARQ m Approaches to reliable transport Go-Back-N Selective repeat m TCP Services TCP: Connection setup, acks and seq num, timeout and triple-dup ack, slow-start, congestion avoidance.

Transport Layer application transport network link physical application transport network link physical application transport network link physical application transport network link physical application transport network link physical application transport network link physical Web Browser App Google Server App Transport Key transport layer service: Send messages between Apps Just specify the destination and the message and thats it messages Network Key service the transport layer requires: Network should attempt to deliver segements.

Transport layer r Transfers messages between application in hosts m For ftp you exchange files and directory information. m For http you exchange requests and replies/files m For smtp messages are exchanged r Services possibly provided m Reliability m Error detection/correction m Flow/congestion control m Multiplexing (support several messages being transported simultaneously)

Connection oriented / connectionless r TCP supports the idea of a connection m Once listen and connect complete, there is a logical connection between the hosts. m One can determine if the message was sent r UDP is connectionless m Packets are just sent. There is no concept (supported by the transport layer) of a connection m But the application can make a connection over UDP. So the application is each host will support the hand-shaking and monitoring the state of the connection. r There are other transport layer protocols such as SCTP besides TCP and UDP, but TCP and UDP are the most popular

TCP vs. UDP r Connection oriented m Connections must be set up m The state of the connection can be determined r Flow/congestion control m Limits congestion in the network and end hosts m Control how fast data can be sent r Larger Packet header r Automatically retransmits lost packets and reports if the message was not successfully transmitted r Check sum for error detection r Connectionless m Connections do not need to be set-up m No feedback provided as to whether packets were successfully delivered r No flow/congestion control m Could cause excessive congestion and unfair usage m Data can be sent exactly when it needs to be r Low overhead r Check sum for error detection

Applications and Transport Protocols ApplicationTCP or UDP? SMTP Telnet HTTP FTP Multimedia streaming via youtude VoIP via Skype DNSUDP TCP NFSTCP or UDP

Multiplexing with ports Client IP:B P1 client IP: A P1P2P4 server IP: C SP: 9157 DP: 80 SP: 9157 DP: 80 P5P6P3 D-IP:C S-IP: A D-IP:C S-IP: B SP: 5775 DP: 80 D-IP:C S-IP: B Transport layer packet headers always contain source and destination port IP headers have source and destination IPs When a message is sent, the destination port must be known. However, the source port could be selected by the OS. App Transport Network TCP

About multiplexing HTTP usually has port 80 as the destination, but you can make a web server listen on any port that is not already used by another application ICANN registered ports (0-1024) HTTP: 80 HTTP over SSL: 443 FTP: 21 Telnet: 23 DNS: 53 Microsoft server: 3389 Typically, only one application can listen on a port at a time (tools such as PCAP can be used to listen on ports that are already in use. Wireshark uses PCAP) For TCP, you cannot control the source port; the OS sets it. For UDP, you can set the source port. A connection is defined as a 5 tuple: source IP, source port, destination IP, and destination port, and transport protocol. NATs make use to these five pieces of information. NATs are discussed in detail in Chapter 4, but they are dependent on transport layer Since connections are defined by ports and addresses, there cross layer dependencies (the transport layer cannot demultiplex without knowledge of the IP addresses, with is a concept of a different layer.)

Chapter 3 outline r 3.1 Transport-layer services r 3.2 Multiplexing and demultiplexing r 3.3 Connectionless transport: UDP r 3.4 Principles of reliable data transfer r 3.5 Connection-oriented transport: TCP m segment structure m reliable data transfer m flow control m connection management r 3.6 Principles of congestion control r 3.7 TCP congestion control

UDP: User Datagram Protocol [RFC 768] r no frills, bare bones Internet transport protocol r best effort service, UDP segments may be: m lost m delivered out of order to app r connectionless: m no handshaking between UDP sender, receiver m each UDP segment handled independently of others Why is there a UDP? r no connection establishment (which can add delay) r simple: no connection state at sender, receiver r small segment header r no congestion control: UDP can blast away as fast as desired

UDP: more r often used for streaming multimedia apps m loss tolerant m rate sensitive r other UDP uses m DNS m SNMP r reliable transfer over UDP: add reliability at application layer m application-specific error recovery! source port #dest port # 32 bits Application data (message) UDP segment format length checksum Length, in bytes of UDP segment, including header

UDP checksum Sender: r treat segment contents as sequence of 16-bit integers r checksum: addition (1s complement sum) of segment contents r sender puts checksum value into UDP checksum field Receiver: r compute checksum of received segment r check if computed checksum equals checksum field value: m NO - error detected m YES - no error detected. But maybe errors nonetheless? More later . Goal: detect errors (e.g., flipped bits) in transmitted segment

Internet Checksum Example r Note m When adding numbers, a carryout from the most significant bit needs to be added to the result r Example: add two 16-bit integers 1 1 1 1 0 0 1 1 0 0 1 1 0 0 1 1 0 1 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 0 1 0 1 0 0 0 1 0 0 0 1 0 0 0 0 1 1 wraparound sum checksum

Principles of reliable data transfer

Principles of Reliable data transfer

Principles of reliable data transfer

Reliable data transfer: getting started send side receive side rdt_send(): called from above, (e.g., by app.). Passed data to deliver to receiver upper layer udt_send(): called by rdt, to 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

Application implemented reliable data transfer Main App UDP communication Application Main App communication Application UDP reliable channel unreliable channel Application Layer Transport Layer Pros and cons of implementing a reliable transport protocol in the application Cons -It is already done by the OS, why reinvent the wheel. -The OS might have higher priority than the application. Pros -The OSs TCP is designed to work in every scenario, but your app might only exist in specific scenarios -Network storage device -Mobile phone -Cloud app

Reliable data transfer: getting started Well: r incrementally develop sender, receiver sides of reliable data transfer protocol (rdt) r consider only unidirectional data transfer m but control info will flow on both directions! r use finite state machines (FSM) to specify sender, receiver state 1 state 2 event causing state transition actions taken on state transition state: when in this state next state uniquely determined by next event event actions

Rdt1.0: reliable transfer over a reliable channel r Assume that the underlying channel is perfectly reliable m no bit errors m no loss of packets r Make separate FSMs for sender, receiver: m sender sends data into underlying channel m receiver read data from underlying channel segment = make_pkt(data) udt_send(segment) Wait for call from above rdt_send(data) sender data = extract (segment) deliver_data(data) Wait for call from below rdt_rcv(segment) receiver

Rdt2.0: channel with bit errors r underlying channel may flip bits in packets m checksum to detect bit errors r the question: how to recover from errors: m negative acknowledgements (NAKs): receiver explicitly tells sender that pkt had errors sender retransmits pkt on receipt of NAK m acknowledgements (ACKs): receiver explicitly tells sender that pkt received OK new mechanisms in rdt2.0 (beyond rdt1.0 ): m error detection m receiver feedback: control msgs (ACK,NAK) rcvr->sender

rdt2.0: FSM specification Wait for call from above snkpkt = make_pkt(data, checksum) udt_send(sndpkt) extract(rcvpkt,data) deliver_data(data) udt_send(ACK) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) Wait for ACK or NAK Wait for call from below sender receiver rdt_send(data)

rdt2.0: FSM specification Wait for call from above snkpkt = make_pkt(data, checksum) udt_send(sndpkt) data = extract(rcvpkt) deliver_data(data) udt_send(ACK) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) rdt_rcv(rcvpkt) && isACK(rcvpkt) Wait for ACK or NAK Wait for call from below sender receiver rdt_send(data)

rdt2.0: FSM specification Wait for call from above snkpkt = make_pkt(data, checksum) udt_send(sndpkt) data = extract(rcvpkt) deliver_data(data) udt_send(ACK) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) rdt_rcv(rcvpkt) && isACK(rcvpkt) udt_send(sndpkt) rdt_rcv(rcvpkt) && isNAK(rcvpkt) udt_send(NAK) rdt_rcv(rcvpkt) && corrupt(rcvpkt) Wait for ACK or NAK Wait for call from below sender receiver rdt_send(data)

rdt2.0 has a fatal flaw! What happens if ACK/NAK corrupted? r sender doesnt know what happened at receiver! r cant just retransmit: possible duplicate Handling duplicates: r sender retransmits current pkt if ACK/NAK garbled r sender adds sequence number to each pkt r receiver discards (doesnt deliver up) duplicate pkt Sender sends one packet, then waits for receiver response stop and wait

rdt2.1: sender, handles garbled ACK/NAKs 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) && (corrupt(rcvpkt) || isNAK(rcvpkt) ) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt) Wait for call 1 from above sndpkt = make_pkt(1, data, checksum) udt_send(sndpkt) rdt_send(data) udt_send(sndpkt) rdt_rcv(rcvpkt) && ( corrupt(rcvpkt) || isNAK(rcvpkt) ) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt) Wait for ACK or NAK 1

extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) rdt2.1: receiver, handles garbled ACK/NAKs Wait for 0 from below Wait for 1 from below rdt_rcv(rcvpkt) && !corrupt(rcvpkt) && has_seq0(rcvpkt)

sndpkt = make_pkt(NAK, chksum) udt_send(sndpkt) extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) rdt2.1: receiver, handles garbled ACK/NAKs Wait for 0 from below Wait for 1 from below rdt_rcv(rcvpkt) && !corrupt(rcvpkt) && has_seq0(rcvpkt) rdt_rcv(rcvpkt) && ! corrupt(rcvpkt) && seqnum(rcvpkt)==1 rdt_rcv(rcvpkt) && (corrupt(rcvpkt) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt)

sndpkt = make_pkt(NAK, chksum) udt_send(sndpkt) extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) rdt2.1: receiver, handles garbled ACK/NAKs Wait for 0 from below sndpkt = make_pkt(NAK, chksum) udt_send(sndpkt) rdt_rcv(rcvpkt) && not corrupt(rcvpkt) && has_seq0(rcvpkt) rdt_rcv(rcvpkt) && !corrupt(rcvpkt) && has_seq1(rcvpkt) extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) Wait for 1 from below rdt_rcv(rcvpkt) && !corrupt(rcvpkt) && has_seq0(rcvpkt) rdt_rcv(rcvpkt) && (corrupt(rcvpkt) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) rdt_rcv(rcvpkt) && ! corrupt(rcvpkt) && seqnum(rcvpkt)==1 rdt_rcv(rcvpkt) && (corrupt(rcvpkt) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt)

rdt2.1: sender, handles garbled ACK/NAKs 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) && ( corrupt(rcvpkt) || isNAK(rcvpkt) ) sndpkt = make_pkt(1, data, checksum) udt_send(sndpkt) rdt_send(data) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt) udt_send(sndpkt) rdt_rcv(rcvpkt) && ( corrupt(rcvpkt) || isNAK(rcvpkt) ) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt) Wait for call 1 from above Wait for ACK or NAK 1

rdt2.1: receiver, handles garbled ACK/NAKs Wait for 0 from below sndpkt = make_pkt(NAK, chksum) udt_send(sndpkt) rdt_rcv(rcvpkt) && not corrupt(rcvpkt) && has_seq0(rcvpkt) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && has_seq1(rcvpkt) extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) Wait for 1 from below rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && has_seq0(rcvpkt) extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) rdt_rcv(rcvpkt) && (corrupt(rcvpkt) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) rdt_rcv(rcvpkt) && not corrupt(rcvpkt) && has_seq1(rcvpkt) rdt_rcv(rcvpkt) && (corrupt(rcvpkt) sndpkt = make_pkt(ACK, chksum) udt_send(sndpkt) sndpkt = make_pkt(NAK, chksum) udt_send(sndpkt)

rdt2.1: discussion Sender: r seq # added to pkt r two seq. #s (0,1) will suffice. Why? r must check if received ACK/NAK corrupted r twice as many states m state must remember whether current pkt has 0 or 1 seq. # Receiver: r must check if received packet is duplicate m state indicates whether 0 or 1 is expected pkt seq # r note: receiver can not know if its last ACK/NAK received OK at sender

rdt2.2: a NAK-free protocol r same functionality as rdt2.1, using ACKs only r instead of NAK, receiver sends ACK for last pkt received OK m receiver must explicitly include seq # of pkt being ACKed r duplicate ACK at sender results in same action as NAK: retransmit current pkt

rdt2.2: 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) && ( corrupt(rcvpkt) || isACK(rcvpkt,1) ) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt,0) Wait for ACK 0 sender FSM fragment Wait for 0 from below rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && has_seq1(rcvpkt) extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(ACK1, chksum) udt_send(sndpkt) rdt_rcv(rcvpkt) && (corrupt(rcvpkt) || has_seq1(rcvpkt)) udt_send(sndpkt) receiver FSM fragment What happens if a pkt is duplicated?

rdt3.0: channels with errors and loss New assumption: underlying channel can also lose packets (data or ACKs) m checksum, seq. #, ACKs, retransmissions will be of help, but not enough Approach: sender waits reasonable amount of time for ACK r retransmits if no ACK received in this time r if pkt (or ACK) just delayed (not lost): m retransmission will be duplicate, but use of seq. #s already handles this m receiver must specify seq # of pkt being ACKed r requires countdown timer

stop_timer rdt3.0 sender sndpkt = make_pkt(0, data, checksum) udt_send(sndpkt) start_timer rdt_send(data) Wait for ACK0 rdt_rcv(rcvpkt) && ( corrupt(rcvpkt) || isACK(rcvpkt,1) ) Wait for call 1 from above rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt,0) udt_send(sndpkt) start_timer timeout Wait for call 0from above

rdt3.0 sender sndpkt = make_pkt(0, data, checksum) udt_send(sndpkt) start_timer rdt_send(data) Wait for ACK0 rdt_rcv(rcvpkt) && ( corrupt(rcvpkt) || isACK(rcvpkt,1) ) Wait for call 1 from above sndpkt = make_pkt(1, data, checksum) udt_send(sndpkt) start_timer rdt_send(data) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt,0) rdt_rcv(rcvpkt) && ( corrupt(rcvpkt) || isACK(rcvpkt,0) ) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt,1) stop_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)

resend pkt1 rdt3.0 in action sender receiver send pkt0 time rec pkt0 send ack0 send pkt1 rec ack0 rec pkt1 send ack1 rec ack1 send pkt1 rec pkt1 sender receiver send pkt0 time rec pkt0 send ack0 send pkt1 rec ack0 send pkt2 rec pkt2 TO rec pkt1 send ack1 rec ack1

rdt3.0 in action sender receiver time send pkt0 rec pkt0 send ack0 rec ack0 send pkt1 rec pkt1 send pkt1 rec pkt1 TO send ack1 send pkt2 rec ack1 send ack1 sender receiver time send pkt0 rec pkt0 send ack0 rec ack0 send pkt1 rec pkt1 send pkt1 rec pkt1 TO send ack1 send pkt? rec ack1 send ack1 send pkt2 rec pkt2 rec ack1 send no pkt (dupACK) send ack2 rec ack2 send pkt2

rdt3.0 sender sndpkt = make_pkt(0, data, checksum) udt_send(sndpkt) start_timer rdt_send(data) Wait for ACK0 rdt_rcv(rcvpkt) && ( corrupt(rcvpkt) || isACK(rcvpkt,1) ) Wait for call 1 from above sndpkt = make_pkt(1, data, checksum) udt_send(sndpkt) start_timer rdt_send(data) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt,0) rdt_rcv(rcvpkt) && ( corrupt(rcvpkt) || isACK(rcvpkt,0) ) rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && isACK(rcvpkt,1) stop_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)

Performance of rdt3.0 r rdt3.0 works, but performance stinks r ex: 1 Gbps link, 15 ms prop. delay, 8000 bit packet and 100bit ACK: m What is the total delay Data transmission delay 8000/10 9 = 8 10 -6 ACK Transmission delay 100/10 9 = 10 -7 sec Total Delay 2 15ms +.008 +.0001=30.0081ms r Utilization m Time transmitting / total time m.008 / 30.0081 = 0.00027 r This is one pkt every 30msec or 33 kB/sec over a 1 Gbps link!

rdt3.0: stop-and-wait operation first packet bit transmitted, t = 0 senderreceiver RTT last packet bit transmitted, t = L / R first packet bit arrives last packet bit arrives, send ACK ACK arrives, send next packet, t = RTT + L / R

Pipelined protocols Pipelining: sender allows multiple, in-flight, yet-to- be-acknowledged pkts m range of sequence numbers must be increased m buffering at sender and/or receiver r Two generic forms of pipelined protocols: go-Back-N, selective repeat

Pipelining: increased utilization first packet bit transmitted, t = 0 senderreceiver RTT last bit transmitted, t = L / R first packet bit arrives last packet bit arrives, send ACK ACK arrives, send next packet, t = RTT + L / R last bit of 2 nd packet arrives, send ACK last bit of 3 rd packet arrives, send ACK Increase utilization by a factor of 3!

Pipelining Protocols Go-back-N: big pic r Sender can have up to N unacked packets in pipeline r Rcvr only sends cumulative acks m Doesnt ack packet if theres a gap r Sender has timer for oldest unacked packet m If timer expires, retransmit all unacked packets Selective Repeat: big pic r Sender can have up to N unacked packets in pipeline r Rcvr acks individual packets r Sender maintains timer for each unacked packet m When timer expires, retransmit only unack packet

Go-Back-N Sender: r k-bit seq # in pkt header r window of up to N, unacked pkts allowed r ACK(n): ACKs all pkts up to, including seq # n - cumulative ACK m may receive duplicate ACKs (see receiver) r timer for each in-flight pkt r timeout(n): retransmit pkt n and all higher seq # pkts in window

Go-Back-N Pkt that could be sent unACKed pkt Unused pkt ACKed pkt send pkt window 1 unACKed pkts start window N=12 0 unACKed pkts pkts send pkts window N unACKed pkts Next pkt to be sent ACK arrives window N=12 Send pkt N unACKed pkts window N-1 unACKed pkts Sliding window State of pkts

Go-Back-N Pkt that could be sent unACKed pkt Unused pkt ACKed pkt window N unACKed pkts window N-1 unACKed pkts ACK arrives Send pkt N unACKed pkts window N unACKed pkts window No ACK arrives . timeout 0 unACKed pkts window

Go-Back-N base

GBN: sender extended FSM Wait rdt_send(data) if (nextseqnum < base+N) { sndpkt[nextseqnum] = make_pkt(nextseqnum,data,chksum) udt_send(sndpkt[nextseqnum]) startTimer(nextseqnum) nextseqnum++ } else refuse_data(data) for i = base to getacknum(rcvpkt) { stop_timer(i) } base = getacknum(rcvpkt)+1 rdt_rcv(rcvpkt) && !corrupt(rcvpkt) base=1 nextseqnum=1 start

base GBN: sender extended FSM Wait udt_send(sndpkt[base]) startTimer(base) udt_send(sndpkt[base+1]) startTimer(base+1) udt_send(sndpkt[nextseqnum-1]) startTimer(nextseqnum-1) timeout rdt_send(data) if (nextseqnum < base+N) { sndpkt[nextseqnum] = make_pkt(nextseqnum,data,chksum) udt_send(sndpkt[nextseqnum]) startTimer(nextseqnum) nextseqnum++ } else refuse_data(data) for i = base to getacknum(rcvpkt)+1 { stop_timer(i) } base = getacknum(rcvpkt)+1 rdt_rcv(rcvpkt) && !corrupt(rcvpkt) base=1 nextseqnum=1 rdt_rcv(rcvpkt) && corrupt(rcvpkt) start

GBN: receiver extended FSM CumACK-only: always send ACK for correctly-received pkt with highest in-order seq # m may generate duplicate ACKs need only remember expectedSeqNum r out-of-order pkt: m discard (dont buffer) -> no receiver buffering! m Re-ACK pkt with highest in-order seq # Wait sndpkt = make_pkt(expectedSeqNum,-1ACK,chksum) udt_send(sndpkt) rdt_rcv(rcvpkt) && (currupt(rcvpkt) || seqNum(rcvpkt)!=expectedSeqNum) rdt_rcv(rcvpkt) && !currupt(rcvpkt) && seqNum(rcvpkt)==expectedSeqNum extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(expectedSeqNum,ACK,chksum) udt_send(sndpkt) expectedSeqNum++ expectedSeqNum=1 start up expectedSeqNum Received !Received

GBN: sender extended Activity Diagram

GBN: Receiver Activity Diagram

GBN: sender extended Activity Diagram Waiting for file Set N Set NextPktToSend=0 Set LastACKed=-1 NextPktToSend LastACKed

GBN: receiver extended FSM ACK-only: always send ACK for correctly-received pkt with highest in-order seq # m may generate duplicate ACKs need only remember expectedseqnum r out-of-order pkt: m discard (dont buffer) -> no receiver buffering! m Re-ACK pkt with highest in-order seq # Wait udt_send(sndpkt) default rdt_rcv(rcvpkt) && notcurrupt(rcvpkt) && hasseqnum(rcvpkt,expectedseqnum) extract(rcvpkt,data) deliver_data(data) sndpkt = make_pkt(expectedseqnum,ACK,chksum) udt_send(sndpkt) expectedseqnum++ expectedseqnum=1 sndpkt = make_pkt(expectedseqnum,ACK,chksum)

GBN in Action sender receiver Send pkt0 Send pkt2 Send pkt3 Send pkt4 Send pkt5 Send pkt6 Send pkt7 Send pkt8 Send pkt9 TO Send pkt6 Send pkt7 Send pkt8 Send pkt9 Rec 0, give to app, and Send ACK=0 Rec 1, give to app, and Send ACK=1 Rec 2, give to app, and Send ACK=2 Rec 3, give to app, and Send ACK=3 Rec 4, give to app, and Send ACK=4 Rec 5, give to app, and Send ACK=5 Rec 7, discard, and Send ACK=5 Rec 8, discard, and Send ACK=5 Rec 9, discard, and Send ACK=5 Rec 6, give to app,. and Send ACK=6 Rec 7, give to app,. and Send ACK=7 Rec 8, give to app,. and Send ACK=8 Rec 9, give to app,. and Send ACK=9 Send pkt1

Optimal size of N in GBN (or selective repeat) sender receiver Send pkt0 Send pkt2 Send pkt3 Send pkt4 Send pkt5 Send pkt6 Send pkt7 RTT Send pkt1

Optimal size of N in GBN (or selective repeat) sender receiver Send pkt0 Send pkt2 Send pkt3 RTT Send pkt1 Q: How large should N be? A: Large enough so that the transmitter is constantly transmitting. How many pkts can be transmitted before the first ACK arrives? == How many pkts can be transmitter in one RTT? N = RTT / (L*R) This is only a first crack at the size of N: What if there are other data transfers sharing the link? What if the receiver has a slower link than the transmitter? What if some intermediate link is the slowest? senderreceiver 1Gbps1Mbps sender 1Gbps1Mbps receiver 1Gbps

Selective Repeat r receiver individually acknowledges all correctly received pkts m buffers pkts, as needed, for eventual in-order delivery to upper layer r sender only resends pkts for which ACK is not received m sender timer for each unACKed pkt r sender window m N consecutive seq #s m again limits seq #s of sent, unACKed pkts

Selective repeat in action Pkt that could be sent unACKed pkt Unused pkt ACKed pkt State of pkts Window N=6 Window N=6 Delivered to app Window N=6 Window N=6 Window N=6 Window N=6 Window N=6 Window N=6 ACKed + Buffered

Selective repeat in action Pkt that could be sent unACKed pkt Unused pkt ACKed pkt State of pkts Window N=6 Delivered to app Window N=6 Window N=6 Window N=6 Window N=6 Window N=6 Window N=6 Window N=6 ACKed + Buffered

Selective repeat in action Pkt that could be sent unACKed pkt Unused pkt ACKed pkt State of pkts Window N=6 Delivered to app Window N=6 ACKed + Buffered Window N=6 Window N=6

Selective repeat in action Pkt that could be sent unACKed pkt Unused pkt ACKed pkt State of pkts Delivered to app ACKed + Buffered Window N=6 Window N=6 TO Window N=6 Window N=6

Selective repeat data from above : r if next available seq # in window, send pkt timeout(n): r resend pkt n, restart timer ACK(n) in [sendbase,sendbase+N]: r mark pkt n as received r if n smallest unACKed pkt, advance window base to next unACKed seq # sender pkt n in [rcvbase, rcvbase+N-1] r send ACK(n) r out-of-order: buffer r in-order: deliver (also deliver buffered, in-order pkts), advance window to next not-yet-received pkt pkt n in [rcvbase-N,rcvbase-1] r ACK(n) otherwise: r ignore receiver Window N=6 Window N=6 sendbase rcvbase

Summary of transport layer tools used so far r ACK and NACK r Sequence numbers (and no NACK) r Time out r Sliding window m Optimal size = ? r Cumulative ACK m Buffer at the receiver is optional r Selective ACK m Requires buffering at the receiver

TCP: Overview RFCs: 793, 1122, 1323, 2018, 2581 r full duplex data: m bi-directional data flow in same connection m MSS: maximum segment size r connection-oriented: m handshaking (exchange of control msgs) inits sender, receiver state before data exchange r flow controlled: m sender will not overwhelm receiver r point-to-point: m one sender, one receiver r reliable, in-order byte steam: r Pipelined and time- varying window size: m TCP congestion and flow control set window size r send & receive buffers

TCP segment structure source port # dest port # 32 bits application data (variable length) sequence number acknowledgement number Receive window Urg data pnter checksum F SR PAU head len not used Options (variable length) URG: urgent data (generally not used) ACK: ACK # valid PSH: push data now (generally not used) RST, SYN, FIN: connection estab (setup, teardown commands) Internet checksum (as in UDP) # bytes rcvr willing to accept counting by bytes of data (not segments!)

TCP seq. #s and ACKs Seq. #s: m byte stream number of first byte in segments data m It can be used as a pointer for placing the received data in the receiver buffer ACKs: m seq # of next byte expected from other side m cumulative ACK Host A Host B Seq=42, ACK=79, data = C Seq=79, ACK=43, data = C Seq=43, ACK=80 User types C host ACKs receipt of echoed C host ACKs receipt of C, echoes back C time simple telnet scenario

Seq no and ACKs 110108 HELLO WORLD 101102103104105106107109111 Byte numbers Seq no: 101 ACK no: 12 Data: HEL Length: 3 Seq no: 12 ACK no: Data: Length: 0 Seq no: 104 ACK no: 12 Data: LO W Length: 4 Seq no: 12 ACK no: Data: Length: 0 104 108

Seq no and ACKs - bidirectional 110108 HELLO WORLD 101102103104105106107109111 Byte numbers GOODB UY 12131415161718 Seq no: 101 ACK no: 12 Data: HEL Length: 3 Seq no: ACK no: Data: GOOD Length: 4 Seq no: ACK no: Data: LO W Length: 4 Seq no: ACK no: Data: BU Length: 2 12 104 16 108 16

TCP Round Trip Time and Timeout Q: how to set TCP timeout value (RTO)? r If RTO is too short: premature timeout m unnecessary retransmissions r If RTO is too long: m slow reaction to segment loss r Can RTT be used? m No, RTT varies, there is no single RTT m Why does RTT varying? Because statistical multiplexing results in queuing r How about using the average RTT? m The average is too small, since half of the RTTs are larger the average Q: how to estimate RTT? SampleRTT : measured time from segment transmission until ACK receipt m ignore retransmissions SampleRTT will vary, want estimated RTT smoother average several recent measurements, not just current SampleRTT

TCP Round Trip Time and Timeout EstimatedRTT = (1- )*EstimatedRTT + *SampleRTT r Exponential weighted moving average r influence of past sample decreases exponentially fast typical value: = 0.125

Example RTT estimation:

TCP Round Trip Time and Timeout Setting the timeout (RTO) RTO = EstimtedRTT plus safety margin large variation in EstimatedRTT -> larger safety margin r first estimate of how much SampleRTT deviates from EstimatedRTT: RTO = EstimatedRTT + 4*DevRTT DevRTT = (1- )*DevRTT + *|SampleRTT-EstimatedRTT| (typically, = 0.25) Then set timeout interval:

TCP Round Trip Time and Timeout RTO = EstimatedRTT + 4*DevRTT Might not always work RTO = max(MinRTO, EstimatedRTT + 4*DevRTT) MinRTO = 250 ms for Linux 500 ms for windows 1 sec for BSD So in most cases RTO = minRTO Actually, when RTO>MinRTO, the performance is quite bad; there are many spurious timeouts. Note that RTO was computed in an ad hoc way. It is really a signal processing and queuing theory question

RTO details r When a pkt is sent, the timer is started, unless it is already running. r When a new ACK is received, the timer is restarted r Thus, the timer is for the oldest unACKed pkt m Q: if RTO=RTT+ , are there many spurious timeouts? m A: Not necessarily RTO ACK arrives, and so RTO timer is restarted RTO This shifting of the RTO means that even if RTO

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