Reti di calcolatori e Sicurezza
-- Transport Layer ---
Part of these slides are adapted from the slides of the book:
Computer Networking: A Top Down Approach Featuring the Internet, 2nd edition.
Jim Kurose, Keith Ross Addison-Wesley, July 2002.
(copyright 1996-2002
J.F Kurose and K.W. Ross, All Rights Reserved)
Chapter 3: Transport Layer
Our goals:
understand principles behind transport
layer services:
multiplexing/demultipl exing
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
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
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 transport
network data link
physical
application transport
network data link
physical network
data link physical
network data link physical network
data link physical network data link physical network
data link physical
logica
l end-e
nd tran sport
Transport vs. network layer
network layer: logical communication
between hosts
transport layer: logical communication
between processes
relies on, enhances, network layer services
Household analogy:
12 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
Internet transport-layer protocols
reliable, in-order delivery (TCP)
congestion control
flow control
connection setup
unreliable, unordered delivery: UDP
no-frills extension of
“best-effort” IP
services not available:
delay guarantees
bandwidth guarantees
application transport
network data link
physical
application transport
network data link
physical network
data link physical
network data link physical network
data link physical network data link physical network
data link physical
logica
l end-e
nd tran sport
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
Un primo servizio
Network = trasferimento di dati tra host della rete
Host identificato in modo univoco da un indirizzo IP
Come si fa a traferire i dati ricevuti ai processi che li hanno richiesti?
Multiplexing -- demultiplexing
Porte e processi
Porta identifica in modo univoco un processo in esecuzione su di un host
Porte di “sistema”: 0 – 1023
FTP – 21, HTTP – 80,
RFC 1700
Applicazioni di rete
Porte maggiori di 1024
application transport
network
M P2
application transport
network
Multiplexing/demultiplexing
segment – unità di
trasferimento di dati delle entità coinvolte al livello del trasporto
TPDU: transport protocol
data unit
receiverHt Hn
Demultiplexing: invio dei
segmenti ricevuti ai processi
segment
segment M application transport
network
P1
M
M M
P3 P4
segment header
application-layer data
Multiplexing/demultiplexing
application transport network link
physical
P1 application
transport network link physical application
transport network
link physical
P3 P1 P2 P4
host 1 host 2 host 3
= process
= socket
Inviare i msg ricevuti al socket corretto
Demultiplexing (host recezione):
Raccogliere i dati, Inviarli in rete
con l’indirizzo corretto
Multiplexing (host invio):
Demultiplexing: modalità di funzionamento
host riceve un msg IP (datagrams)
Ogni datagram è caratterizzato da una coppia di indirizzi IP (mittente, destinatario)
ogni datagram come paylod ha un msg di trasporto
Msg del trasporto ha le informazioni dulle porte del mittente e del
destinatario
Indirizzi IP & porte sono utilizzate per inviare il msg al socket corretto
source port # dest port # 32 bits
application data (message)
other header fields
TCP/UDP segment format
Connectionless demultiplexing
Creazione del socket (in un qualche modo)
Socket UDP sono identificati da:
(
dest IP address, dest port number) Alla recezione del segmento UDP:
Si contralla la porta di destinazione
Invia il segmento al socket in ascolto su quella porta
datagrams con IP e porta del mittente diverse
possono essere inviati
allo stesso socket.
Connectionless demux
DatagramSocket serverSocket = new DatagramSocket(6428);
Client
IP:B P3
client IP: A
P3 P1P1
server IP: C
SP: 6428 DP: 9157 SP: 9157
DP: 6428
SP: 6428 DP: 5775
SP: 5775 DP: 6428
Connection-oriented demux
TCP socket sono identificati
source IP address
source port number
dest IP address
dest port number
Host in recezione
utilizza queste quattro informazioni per inviare il msg a destinazione
Server puo’ operare in modalità multithreading (pertanto sono attivi
diversi socket)
Ogni socket attivo è
identificato in modo
univoco da quadrupla di
valori
Connection-oriented demux (cont)
Client
IP:B P3
client IP: A
P1P1 P3
server IP: C
SP: 80 DP: 9157 SP: 9157
DP: 80
SP: 80 DP: 5775
SP: 5775 DP: 80 P4
Multiplexing/demultiplexing
host A
source port: xserver B
dest. port: 23
source port:23 dest. port: x
telnet app
Web client host A
server B Web Web client
host C
Source IP: C Dest IP: B source port: x
dest. port: 80 Source IP: C
Dest IP: B source port: y dest. port: 80
Web server
Source IP: A Dest IP: B source port: x dest. port: 80
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
UDP: User Datagram Protocol [RFC 768]
Protocollo di trasporto essenziale
Servizio di tipo “best effort”
Segmenti UDP :
perdere
senza ordine
connectionless:
no handshaking
Ogni segmento UDP è gestito in modo
totalmente independente dagli altri segmenti
Quando è necessario utilizzare UDP?
Non c’è la necessità di stabilire una connessione
Applicazioni semplici: non abbiamo bisogno di
informazioni di stato
Header dei segmenti piccoli
Nessun controllo per
evitare i problemi di
congestione
UDP
Multimedia
Possono permettersi una perdita di
informazione
Chi utilizza UDP
DNS
Aggiungere un meccanismo di affidabilità ad UDP
error recover al livello delle applicazioni
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:
Segmenti sono visti come sequenze di interi di 16- bit
checksum: complemento ad 1 della somma di tutti gli interi che compongono il segmento
Checksum-value viene inserito nel campo del segmento denominato checksum
Receiver:
Calcola il valore di checksum del segmento
Controlla se il valore calcolato corrisponde al valore
memorizzato nel campo checksum del segmento:
NO - error detected
YES - no error detected.
Potrebbero essere presenti altri errori
Obiettivo: scoprire eventuali errori di trasmissione
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
Trasferimento affidabilke
Punto importante nei livelli app., transport, link.
Una delle problematiche piu’ importanti del networking
Reliable data transfer: RDT
send side receive
side
rdt_send(): invocata dal livello delle applicazioni
udt_send(): trasferire pacchetti su di un canale non
affidabile rdt_rcv(): chiamata al momento
della recezione dei pacchetti deliver_data(): invia i
dati ai livelli superiori
Automi e trasferimento affidabile
Trasferimento di dati (unidirezionale)
Ma con meccanismi di controllo del flusso.
Sender e receiver sono specificati da automi a stati finiti.
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
Il canale di trasmissione è affidabile
no bit erros
no loss of packets
Sender e receiver (fanno le ovvie cose!!)
Wait for call from
above packet = make_pkt(data) udt_send(packet)
rdt_send(data)
extract (packet,data) deliver_data(data) Wait for
call from below
rdt_rcv(packet)
sender receiver
Rdt2.0: channel with bit errors
Il canale puo’ modificare il valore dei bit presenti nei pacchetti
UDP checksum
Come vengono determinati questi errori di trasmissione :
acknowledgements (ACKs): receiver invia al sender un messaggio di recezione (senza errori) del pacchetto
negative acknowledgements (NAKs): receiver invia al sender un messaggio di errore
Sender trasmette nuovamente il pacchetto quando riceve un messaggio NAK
Novità (protocolli ARQ)
error detection
receiver feedback (ACK,NAK)
Ritrasmissione
rdt2.0: la specifica (FSM)
Wait for call from
above
snkpkt = make_pkt(data, checksum) udt_send(sndpkt)
extract(rcvpkt,data) deliver_data(data) 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: assenza di errori
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) 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 rdt_send(data)
rdt2.0: Scenario con errore
Wait for call from
above
snkpkt = make_pkt(data, checksum) udt_send(sndpkt)
extract(rcvpkt,data) deliver_data(data) 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 rdt_send(data)
Anche detti protocolli Stop-and-Wait
rdt2.0 ha un fatal flaw!
Cosa succede quando I messaggi ACK/NAK sono corrotti?
sender non è in grado di sapere cosa è successo al receiver
Si possono duplicare i messaggi trasmessi
Come rimediare?
sender ACKs/NAKs e
receiver’s ACK/NAK? Cosa accade in caso di perdita del sender ACK/NAK?
Gestione dei messaggi duplicati:
sender aggiunge ad ogni pacchetto il sequence number
receiver non trasmette alle applicazioni i pacchetti
duplicati
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) )
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)
Duplicato!!!!
rdt2.1
Sender:
Pacchetti con numero di sequenza (basta un solo bit di
informazione)
Stati:
In ogni stato si deve ricordare il numero di sequenz (0 o 1)
Receiver:
Deve controllare se il pacchetto è duplicato
Ogni stato mantiene
informazione su quale
numero di sequenza si
attende
rdt2.2: Protocollo NAK-free
Come rdt 2.1 ma ...
Invece di inviare un msg NAK, il receiver invia un msg di ACK per l’ultimo pacchetto ricevuto correttamente
Informazioni di stato
“receiver must explicitly include seq # of pkt being ACKed”
ACK duplicato (lato sender) = NAK: ristrasmissione del pkt
corrente
rdt2.2: sender e receiver (in pillole)
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
sender FSM
0fragment
Wait for 0 from
below
rdt_rcv(rcvpkt) && notcorrupt(rcvpkt) && has_seq0(rcvpkt)
extract(rcvpkt,data) rdt_rcv(rcvpkt) &&
(corrupt(rcvpkt) ||
has_seq1(rcvpkt))
sndpkt = make_pkt(ACK1, chksum)
udt_send(sndpkt)
receiver FSM fragment
rdt3.0: Canali con errori e perdita di pacchetti
Ipotesi aggiuntive: Il canale di trasmissione puo’ perdere pacchetti (dati o ACK)
checksum, seq. #, ACK, sono sufficienti?
Come si gestisce la perdita di pacchetti?
sender attende un certo periodo di tempo prima di trasmettere nuovamente l’informazione
Una possibile soluzione: sender rimane in attesa per un
periodo di tempo ragionevole
I pkt vengono trasmessi
nuovamente se non viene ricevuto un ACK in questo periodo di
tempo
Se la consegna del pkt (ACK) è solo ritardata (non avviene perdita)
Duplicazione: gestita tramite il # di sequenza
receiver specifica il # di sequenza del pkt ricevuto
countdown 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
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) ||
rdt_rcv(rcvpkt)
&& notcorrupt(rcvpkt)
&& isACK(rcvpkt,1)
stop_timer 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)
rdt3.0: esempio
rdt3.0: esempio
rdt3.0
rdt3.0 funziona correttamente ma esibisce dei problemi di
efficienza relativi all’uso della banda di trasmissione
rdt3.0: stop-and-wait
first packet bit transmitted, t = 0
sender receiver
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
U
sender= .
00830.008
=
0.00027microsec
L / R
RTT + L / R =
Pipeline
Pipelining: il mittente invia un certo numero di pacchetti senza attendere il relativo ACK
Operare correttamente con i # di sequenza
Buffer (mittente e destinatario)
Due tipi di protocolli: go-Back-N, selective repeat
Pipelining: increased utilization
first packet bit transmitted, t = 0
sender receiver
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 2nd packet arrives, send ACK last bit of 3rd packet arrives, send ACK
U
sender= .
02430.008
=
0.0008microsecon
3 * L / R RTT + L / R =
Increase utilization
by a factor of 3!
Protocolli “sliding window”
Go-Back-N
Sender:
Header; k-bit per memorizzare i numeri di sequenza dei pkt.
Si permette di avere una “finestra fino ad N”, di pkt consecutivi in cui non è stato ricevuto il relativo ack
ACK(n): ACK cumulativo dei pkt con # minore di n
timer per i pkt in trasmissione
timeout(n): trasmettere il pkt n e tutti i pkt nella parte superiore della finestra di trasmissione
GBN: lato sender
Wait start_timer
udt_send(sndpkt[base]) udt_send(sndpkt[base+1])
…
udt_send(sndpkt[nextseqnum- 1])
timeout rdt_send(data)
if (nextseqnum < base+N) {
sndpkt[nextseqnum] = make_pkt(nextseqnum,data,chksum) udt_send(sndpkt[nextseqnum])
if (base == nextseqnum) start_timer
nextseqnum++
} else
refuse_data(data)
base = getacknum(rcvpkt)+1 If (base == nextseqnum) stop_timer
else
rdt_rcv(rcvpkt) &&
notcorrupt(rcvpkt) base=1
nextseqnum=1
rdt_rcv(rcvpkt) && corrupt(rcvpkt)
GBN: lato receiver
ACK viene inviato per i pkt corretti aventi il piu’ slto numero seq #
ACK duplicati
Variabile di stato: expectedseqnum
out-of-order pkt:
discard -> no buffering!
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
Selective Repeat
receiver invia ACK di tutti i pkt ricevuti correttamente.
Buffer per gestire l’ordine dei pacchetti
Sender invia nuovamente i pkt senza ACK
Sender attiva timer per ogni pkt senza ACK
La finestra del sender:
N # di sequenza consecutivi
Limite superiore alla dimensione della finestra
Selective repeat: sender, receiver windows
Selective repeat
data from above :
if next available seq # in window, send pkt
timeout(n):
resend pkt n, restart timer
ACK(n) in
[sendbase,sendbase+N]:
mark pkt n as received
if n smallest unACKed pkt, advance window base to next unACKed seq #
sender
pkt 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-N,rcvbase-1]
ACK(n)
otherwise:
ignore
receiver
Selective repeat
Selective repeat
seq #’s: 0, 1, 2, 3
window size=3
receiver non riesce a discriminare i due comportamenti
Window di dimensione
inferiore allo spazio
dei numeri di sequenza
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
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) init’s sender, receiver state before data exchange
flow controlled:
sender will not
point-to-point:
one sender, one receiver
reliable, in-order byte stream:
no “message boundaries”
pipelined:
TCP congestion and flow control set window size
send & receive buffers
s o c k e t s o c k e t
a p p l i c a t io n
w r i t e s d a t a a p p l ic a t io n
r e a d s d a t a
TCP segment structure
source port # dest port #
32 bits
application data
(variable length) sequence number
acknowledgement number
Receive window Urg data pnter checksum
F S P R A
head U
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)
# bytes rcvr willing to accept counting by bytes of data
(not segments!)
Internet checksum (as in UDP)
Il segment TCP
Connessione:
(SrcPort, SrcIPAddr, DsrPort, DstIPAddr)
window + flow control
acknowledgment, SequenceNum, RcvdWinow
Flags
SYN, FIN, RESET, PUSH, URG, ACK
Checksum
pseudo header + TCP header + data
Sender
Data (SequenceNum)
Acknowledgment + RcvdWindow
Receiver
TCP seq. #’s and ACKs
Seq. #’s:
byte stream “number”
of first byte in segment’s data ACKs:
seq # of next byte expected from other side
cumulative ACK Q: how receiver handles
out-of-order segments
A: TCP spec doesn’t say, - up to
implementor
Host A Host B
Seq=42, AC
K=79, data = ‘C’
Seq=79, ACK=43, data = ‘C’
Seq=43, ACK=80
typesUser
‘C’
host ACKs receipt of echoed
‘C’
host ACKs receipt of
‘C’, echoes back ‘C’
simple telnet scenario time
TCP Round Trip Time and Timeout
Q: 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
Q: how to estimate RTT?
SampleRTT: measured time from segment transmission until ACK receipt
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
Exponential weighted moving average
influence of past sample decreases exponentially fast
typical value: = 0.125
Example RTT estimation:
TCP Round Trip Time and Timeout
Setting the timeout
EstimtedRTT plus “safety margin”
large variation in EstimatedRTT -> larger safety margin
first estimate of how much SampleRTT deviates from EstimatedRTT:
TimeoutInterval = EstimatedRTT + 4*DevRTT DevRTT = (1-)*DevRTT +
*|SampleRTT-EstimatedRTT|
(typically, = 0.25)
Then set timeout interval:
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
TCP:
Sender
00 sendbase = initial_sequence number 01 nextseqnum = initial_sequence number 02
03 loop (forever) { 04 switch(event)
05 event: data received from application above
06 create TCP segment with sequence number nextseqnum 07 start timer for segment nextseqnum
08 pass segment to IP
09 nextseqnum = nextseqnum + length(data)
10 event: timer timeout for segment with sequence number y 11 retransmit segment with sequence number y
12 compute new timeout interval for segment y 13 restart timer for sequence number y
14 event: ACK received, with ACK field value of y
15 if (y > sendbase) { /* cumulative ACK of all data up to y */
16 cancel all timers for segments with sequence numbers < y 17 sendbase = y
18 }
19 else { /* a duplicate ACK for already ACKed segment */
20 increment number of duplicate ACKs received for y 21 if (number of duplicate ACKS received for y == 3) { 22 /* TCP fast retransmit */
23 resend segment with sequence number y 24 restart timer for segment y
25 }
26 } /* end of loop forever */
Pseudo Codice
TCP reliable data transfer
TCP creates rdt
service on top of IP’s unreliable service
Pipelined segments
Cumulative acks
TCP uses single
retransmission timer
Retransmissions are triggered by:
timeout events
duplicate acks
Initially consider
simplified TCP sender:
ignore duplicate acks
ignore flow control,
congestion control
TCP sender events:
data 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
Se scade un timer, lo rifaccio ripartire con valore di time-out doppio.
Se ok, risettato al valore ottenuto con
estimatedRTT e devRTT
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 > SendBase) {
SendBase = y
if (there are currently not-yet-acknowledged segments) start timer
Comment:
• SendBase-1: last cumulatively
ack’ed byte Example:
• SendBase-1 = 71;
y= 73, so the rcvr wants 73+ ;
y > SendBase, so that new data is acked
TCP: retransmission scenarios
Host A
Seq=100, 20 bytes data ACK=100
time premature timeout
Host B
Seq=92, 8 bytes data ACK=120 Seq=92, 8 bytes data
Seq=92 timeout
ACK=120
Host A
Seq=92, 8 bytes data
ACK=100
timeout loss
Host B
X
Seq=92, 8 bytes data ACK=100
time
Seq=92 timeout
SendBase
= 100
SendBase
= 120
SendBase
= 120 Sendbase
= 100
TCP retransmission scenarios (more)
Host A
Seq=92, 8 bytes data ACK=100
timeout loss
Host B
X
Seq=100, 2
0 bytes data
ACK=120
time
SendBase
= 120
TCP ACK generation [RFC 1122, RFC 2581]
Event at Receiver
Arrival of in-order segment with expected seq #. All data up to expected seq # already ACKed Arrival of in-order segment with expected seq #. One other segment has ACK pending Arrival of out-of-order segment higher-than-expect seq. # . Gap detected
Arrival of segment that
partially or completely fills gap
TCP Receiver action
Delayed ACK. Wait up to 500ms
for next segment. If no next segment, send 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 that segment startsat lower end of gap
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
event: ACK received, with ACK field value of y if (y > 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 retransmit
Commenti
ACK comulativi
Sender
Sendbase = piu’ piccolo numero di sequenza dei segmenti trasmessi ma di cui non si è ancora ricevuto ACK
Nextseqnum = numero di sequenza del prossimo
dato da inviare
TCP vs GBN
Sender invia i segmenti 1, 2, …, N.
Assumiamo che i segmenti arrivino correttamente al destinatario.
ACK(n) viene perduto (unico ACK perduto)
GBN trasmette nuovamente i segmenti ??
TCP trasmette nuovamente i segmenti ??
TCP vs GBN
Sender invia i segmenti 1, 2, …, N.
Assumiamo che i segmenti arrivino correttamente al destinatario.
ACK(n) viene perduto (unico ACK perduto)
GBN trasmette nuovamente i segmenti n, n+1 , …, N
TCP trasmette nuovamente al piu’ il
segmento n (se il timeout di n scatta prima
dell’arrivo di ACK(n+1))
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
TCP Flow Control
receive side of TCP connection has a
receive buffer:
speed-matching
service: matching the send rate to the
receiving app’s drain
app process may be rate slow at reading from buffer
sender won’t overflow receiver’s buffer by
transmitting too much,
too fast
flow control
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 doesn’t overflow
Sliding Window
Sending side
LastByteAcked < = LastByteSent
LastByteSent < = LastByteWritten
buffer bytes between LastByteAcked and LastByteWritten
Sending application
LastByteWritten TCP
LastByteSent LastByteAcked
Receiving application
LastByteRead TCP
LastByteRcvd NextByteExpected
Receiving side
LastByteRead <
NextByteExpected
NextByteExpected < = LastByteRcvd +1
buffer bytes between
NextByteRead and
TCP Flow Control: variabili di stato
Send buffer size: MaxSendBuffer
Receive buffer size: MaxRcvBuffer
Receiving side
LastByteRcvd - LastByteRead < = MaxRcvBuffer
AdvertisedWindow = MaxRcvBuffer - (NextByteExpected - NextByteRead)
Sending side
LastByteSent - LastByteAcked < = AdvertisedWindow
EffectiveWindow = AdvertisedWindow - (LastByteSent - LastByteAcked)
LastByteWritten - LastByteAcked < = MaxSendBuffer
block sender if (LastByteWritten - LastByteAcked) + y >
MaxSenderBuffer
TCP Controllo del flusso: azioni
Inviare ACK all’arrivo di segmenti
Se ho finito di spedire e ho AdvertisedWindow = 0?
Problema: il ricevente non sapra’ mai se ho di nuovo spazio nel buffer
il ricevente se ha AdvertisedWindow = 0 continua a spedire ack fino a che si libera il
buffer
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
TCP Connection Management
Recall: TCP sender, receiver establish “connection” before exchanging data segments
initialize TCP variables:
seq. #s
buffers, flow control info (e.g. RcvWindow)
client: connection initiator
Socket clientSocket = new Socket("hostname","port number");
server: contacted by client
Socket connectionSocket = welcomeSocket.accept();
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 SYNACK segment
server allocates buffers
specifies server initial seq.
#
Step 3: client receives SYNACK,
replies with ACK segment,
which may contain data
TCP Connection Management (cont.)
Closing a connection:
client closes socket:
clientSocket.close();
Step 1:
client end system sends TCP FIN control segment to serverStep 2:
server receives FIN, replies with ACK. Closes connection, sends FIN.client
FIN
server
ACK
ACK FIN
close
close
closedtimed wait
TCP Connection Management (cont.)
Step 3:
client receives FIN, replies with ACK. Enters “timed wait” - 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
closedtimed wait
closed
TCP Connection Management (cont)
TCP client lifecycle
TCP server
lifecycle
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
Principles of Congestion Control
Congestion:
informally: “too many sources sending too much data too fast for network to handle”
different from flow control!
manifestations:
lost packets (buffer overflow at routers)
long delays (queueing in router buffers)
a top-10 problem!
Le caratteristiche del problema
Risorse allocate per evitare la congestione
Controllo della congestione se (e quando) si manifesta
Implementazione
Host (protocolli del livello di trasporto)
Router (politiche per la gestione delle code)
Quale modello di servizio
best-effort (Internet)
QoS quality of service (Futuro)
Destination 1.5-Mbps T1 link
Router
Source 2 Source
1
100-Mbps FDDI 10-Mbp
s Ethernet
Contesto
Sequenze di pacchetti che viaggiono nella rete
Router hanno poca informazione sullo stato della rete
Router
Source 2 Source
1
Source 3
Router
Router
Destination 2 Destination
1
Causes/costs of congestion: scenario 1
two senders, two receivers
one router,
infinite buffers
no retransmission
large delays
when congested
maximum achievable
unlimited shared output link buffers Host A
in : original data
Host B
out
Troughput per la connessione
Throughput per la connessione = numero di byte al secondo al receiver in funzione della velocità di spedizione
Grandi ritardi quando la velocità dei
pacchetti in arrivo è prossima alla capacità
del router
Causes/costs 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
Congestione
La velocità del sender è uguale al carico offerto dalla rete
Sender deve ristramettere pacchetti per compensare le perdite
Costo della congestione:
Maggiore carico per la trasmissione dei pacchetti
Cause della Congestione
Quattro sender
multihop
Timeout + ritrasmissione
Cosa succede quando aumenta il carico offerto dalle rete?
Quando il carico offerto a B è elevato
il troughput della connessione A-C
risulta zero:
il buffer in R2 è sempre pieno
Costo della Congestione
Quando un pacchetto è perso lungo un
percorso la capacità di trasmissione dei
router lungo il percorso è sprecata!!
Causes/costs of congestion: scenario 3
Another “cost” of congestion:
when packet dropped, any “upstream transmission capacity used for that packet was wasted!
H o s t A
H o s t B
o u t
Politiche di gestione delle code
First-In-First-Out (FIFO)
Non abbiamo alcuna politica di gestione che dipende dalle caratteristiche dei pacchetti
Fair Queuing (FQ)
Meccanismi di strutturazione del flusso dei pacchetti
Un pacchetto non puo’ mai superare la capacità del router
Code con priorità (WFQ)
Flow 1
Flow 2
Flow 3
Flow 4
Round-robin service
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, TCP/IP ECN, ATM)
explicit rate sender should send at
Two broad approaches towards congestion control:
Chapter 3 outline
3.1 Transport-layer services
3.2 Multiplexing and demultiplexing
3.3 Connectionless transport: UDP
3.4 Principles of
reliable data transfer
3.5 Connection-oriented transport: TCP
segment structure
reliable data transfer
flow control
connection management
3.6 Principles of congestion control
3.7 TCP congestion
control
TCP: Controllo della Congestione
Idea di base: si controlla la velocità di trasmissione controllando il numero dei segmenti trasmessi ma di cui non si è ancora ricevuto ACK: W
Maggiore è il valore di W maggiore è il throughput della connessione.
Quando si verifica una perdita di segmento
allora si diminuisce il valore W
TCP Controllo della congestione
Due fasi
slow start (partenza lenta)
congestion avoidance (annullamento della congestione)
Valori da considerare:
Congwin