Transcript Congestion Control Outline Queuing Discipline Reacting to Congestion Avoiding Congestion Quality of Service Fall 2006 CS 561

Congestion Control
Outline
Queuing Discipline
Reacting to Congestion
Avoiding Congestion
Quality of Service
Fall 2006
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Issues
• Two sides of the same coin
– pre-allocate resources so at to avoid congestion
– control congestion if (and when) is occurs
Router
1.5-Mbps T1 link
Destination
Source
2
• Two points of implementation
– hosts at the edges of the network (transport protocol)
– routers inside the network (queuing discipline)
• Underlying service model
– best-effort
– multiple qualities of service (QoS)
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Framework
• Connectionless flows
– sequence of packets sent between source/destination pair
– maintain soft state at the routers
Source
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Router
Destination
1
Router
Source
2
Router
Destination
2
Source
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• Taxonomy
– router-centric versus host-centric
– reservation-based versus feedback-based
– window-based versus rate-based
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Evaluation
Throughput/delay
• Fairness
• Power (ratio of throughput to delay)
Optimal
load
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Load
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Queuing Discipline
• First-In-First-Out (FIFO)
– does not discriminate between traffic sources
– drop policy (tail-drop, random early drop)
• Fair Queuing (FQ)
– explicitly segregates traffic based on flows
– ensures no flow captures more than its share of capacity
– variation: weighted fair queuing (WFQ)
• Problem?
Flow 1
Flow 2
Round-robin
service
Flow 3
Flow 4
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FQ Algorithm
•
•
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Suppose clock ticks each time a bit is transmitted
Let Pi denote the length of packet i
Let Si denote the time when start to transmit packet i
Let Fi denote the time when finish transmitting packet i
Fi = Si + Pi
When does router start transmitting packet i?
– if before router finished packet i - 1 from this flow, then
immediately after last bit of i - 1 (Fi-1)
– if no current packets for this flow, then start
transmitting when arrives (call this Ai)
• Thus: Fi = MAX (Fi - 1, Ai) + Pi
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FQ Algorithm (cont)
• For multiple flows
– calculate Fi for each packet that arrives on each flow
– treat all Fi’s as timestamps
– next packet to transmit is one with lowest timestamp
• Not perfect: can’t preempt current packet
• Example
Flow 1
F=8
F=5
Flow 2
Flow 1
(arriving)
Output
F = 10
Output
F = 10
F=2
(a)
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Flow 2
(transmitting)
(b)
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TCP Congestion Control
• Idea
– assumes best-effort network (FIFO or FQ routers) each
source determines network capacity for itself
– uses implicit feedback
– ACKs pace transmission (self-clocking)
• Challenge
– determining the available capacity in the first place
– adjusting to changes in the available capacity
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Additive Increase/Multiplicative
Decrease
• Objective: adjust to changes in the available capacity
• New state variable per connection: CongestionWindow
– limits how much data source has in transit
MaxWin = MIN(CongestionWindow,
AdvertisedWindow)
EffWin = MaxWin - (LastByteSent LastByteAcked)
• Idea:
– increase CongestionWindow when congestion goes down
– decrease CongestionWindow when congestion goes up
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AIMD (cont)
• Question: how does the source determine whether
or not the network is congested?
• Answer: a timeout occurs
– timeout signals that a packet was lost
– packets are seldom lost due to transmission error
– lost packet implies congestion
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AIMD (cont)
Source
Destination
• Algorithm
…
– increment CongestionWindow by
one packet per RTT (linear increase)
– divide CongestionWindow by two
whenever a timeout occurs
(multiplicative decrease)
• In practice: increment a little for each ACK
Increment = (MSS * MSS)/CongestionWindow
CongestionWindow += Increment
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AIMD (cont)
KB
• Trace: sawtooth behavior
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Time (seconds)
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Slow Start
Source
Destination
• Objective: determine the available
capacity in the first place
• Idea:
…
– begin with CongestionWindow = 1
packet
– double CongestionWindow each RTT
(increment by 1 packet for each ACK)
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Slow Start (cont)
• Exponential growth, but slower than all at once
• Used…
– when first starting connection
– when connection goes dead waiting for timeout
KB
• Trace
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1.0
2.0
3.0
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9.0
• Problem: lose up to half a CongestionWindow’s
worth of data
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Fast Retransmit and Fast Recovery
• Problem: coarse-grain
TCP timeouts lead to idle
periods
• Fast retransmit: use
duplicate ACKs to trigger
retransmission
Sender
Receiver
Packet 1
Packet 2
Packet 3
ACK 1
Packet 4
ACK 2
Packet 5
ACK 2
Packet 6
ACK 2
ACK 2
Retransmit
packet 3
ACK 6
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KB
Results
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• Fast recovery
– skip the slow start phase
– go directly to half the last successful
CongestionWindow (ssthresh)
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Congestion Avoidance
• TCP’s strategy
– control congestion once it happens
– repeatedly increase load in an effort to find the point at which
congestion occurs, and then back off
• Alternative strategy
– predict when congestion is about to happen
– reduce rate before packets start being discarded
– call this congestion avoidance, instead of congestion control
• Two possibilities
– router-centric: DECbit and RED Gateways
– host-centric: TCP Vegas
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DECbit
• Add binary congestion bit to each packet header
• Router
– monitors average queue length over last busy+idle cycle
Queue length
Current
time
Previous
cycle
Averaging
interval
Current
cycle
Time
– set congestion bit if average queue length > 1
– attempts to balance throughout against delay
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DECbit (cont)
• Destination echoes bit back to source
• Source records how many packets resulted in set bit
• If less than 50% of last window’s worth had bit set
– increase CongestionWindow by 1 packet
• If 50% or more of last window’s worth had bit set
– decrease CongestionWindow by 0.875 times
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Random Early Detection (RED)
• Notification is implicit
– just drop the packet (TCP will timeout)
– could make explicit by marking the packet
• Early random drop
– rather than wait for queue to become full, drop each
arriving packet with some drop probability whenever
the queue length exceeds some drop level
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RED Details
• Compute average queue length
AvgLen = (1 - Weight) * AvgLen +
Weight * SampleLen
0 < Weight < 1 (usually 0.002)
SampleLen is queue length each time a packet arrives
MaxThreshold
MinThreshold
AvgLen
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RED Details (cont)
• Two queue length thresholds
if AvgLen <= MinThreshold then
enqueue the packet
if MinThreshold < AvgLen < MaxThreshold then
calculate probability P
drop arriving packet with probability P
if MaxThreshold <= AvgLen then
drop arriving packet
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RED Details (cont)
• Computing probability P
TempP = MaxP * (AvgLen - MinThreshold)/
(MaxThreshold - MinThreshold)
P = TempP/(1 - count * TempP)
• Drop Probability Curve
P(drop)
1.0
MaxP
AvgLen
MinThresh
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MaxThresh
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Tuning RED
• Probability of dropping a particular flow’s packet(s) is
roughly proportional to the share of the bandwidth that flow
is currently getting
• MaxP is typically set to 0.02, meaning that when the average
queue size is halfway between the two thresholds, the
gateway drops roughly one out of 50 packets.
• If traffic id bursty, then MinThreshold should be
sufficiently large to allow link utilization to be maintained at
an acceptably high level
• Difference between two thresholds should be larger than the
typical increase in the calculated average queue length in one
RTT; setting MaxThreshold to twice MinThreshold is
reasonable for traffic on today’s Internet
• Penalty Box for Offenders
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TCP Vegas
• Idea: source watches for some sign that router’s queue is
building up and congestion will happen too; e.g.,
– sending rate flattens
KB
– RTT grows
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Time (seconds)
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Time (seconds)
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Queue size in router
Sending KBps
1100
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Algorithm
• Let BaseRTT be the minimum of all measured RTTs
(commonly the RTT of the first packet)
• If not overflowing the connection, then
ExpectRate = CongestionWindow/BaseRTT
• Source calculates sending rate (ActualRate) once per RTT
• Source compares ActualRate with ExpectRate
Diff = ExpectedRate - ActualRate
if Diff < a
increase CongestionWindow linearly
else if Diff > b
decrease CongestionWindow linearly
else
leave CongestionWindow unchanged
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Algorithm (cont)
 a = 1 packet
 b = 3 packets
KB
• Parameters
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Time (seconds)
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Time (seconds)
• Even faster retransmit
– keep fine-grained timestamps for each packet
– check for timeout on first duplicate ACK
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Realtime Applications
• Require “deliver on time” assurances
– must come from inside the network
Microphone
Sampler,
A D
converter
Buffer,
D A
Speaker
• Example application (audio)
–
–
–
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sample voice once every 125us
each sample has a playback time
packets experience variable delay in network
add constant factor to playback time: playback point
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Playback Buffer
Sequence number
Packet
arrival
Packet
generation
Playback
Network
delay
Buffer
Time
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Example Distribution of Delays
90% 97% 98%
Packets (%)
3
99%
2
1
50
100
150
200
Delay (milliseconds)
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Integrated Services
• Service Classes
– guaranteed
– controlled-load
• Mechanisms
–
–
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–
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signalling protocol
admission control
policing
packet scheduling
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Flowspec
• Rspec: describes service requested from network
– controlled-load: none
– guaranteed: delay target
• Tspec: describes flow’s traffic characteristics
–
–
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–
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–
–
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average bandwidth + burstiness: token bucket filter
token rate r
bucket depth B
must have a token to send a byte
must have n tokens to send n bytes
start with no tokens
accumulate tokens at rate of r per second
can accumulate no more than B tokens
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Differentiated Services
• Problem with IntServ: scalability
• Idea: segregate packets into a small number of classes
– e.g., premium vs best-effort
• Packets marked according to class at edge of network
• Core routers implement some per-hop-behavior (PHB)
• Example: Expedited Forwarding (EF)
– rate-limit EF packets at the edges
– PHB implemented with class-based priority queues or WFQ
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DiffServ (cont)
• Assured Forwarding (AF)
– customers sign service
agreements with ISPs
– edge routers mark packets
as being “in” or “out” of
profile
– core routers run RIO: RED
with in/out
P(drop)
1.0
MaxP
AvgLen
Min out
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Min in Max out
Maxin
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