eecs 122: introduction to computer networks congestion control
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EECS 122: Introduction to Computer Networks Congestion Control. Computer Science Division Department of Electrical Engineering and Computer Sciences University of California, Berkeley Berkeley, CA 94720-1776. What We Know. We know: How to process packets in a switch - PowerPoint PPT PresentationTRANSCRIPT
Katz, Stoica F04
EECS 122: Introduction to Computer Networks
Congestion Control
Computer Science Division
Department of Electrical Engineering and Computer Sciences
University of California, Berkeley
Berkeley, CA 94720-1776
2Katz, Stoica F04
What We Know
We know: How to process packets in a switch How to route packets in the network How to send packets reliably
We don’t know: How fast to send
"As we know, there are known knowns. There are things we know we know. We also know there are known unknowns. That is to say, we know there are some things we do not know. But there are also unknown unknowns, the ones we don't know we don't know." The Zen of Donald Rumsfeld.
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Implications
Send too slow: link is not fully utilized- Wastes time
Send too fast: link is fully utilized but....- Queue builds up in router buffer (delay)
- Overflow buffers in routers
- Overflow buffers in receiving host (ignore)
Why are buffer overflows a problem?- Packet drops (mine and others)
- Interesting history....(Van Jacobson rides to the rescue)
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Abstract View
Ignore internal structure of router and model it as having a single queue for a particular input-output pair
Sending Host Buffer in Router Receiving Host
A B
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Three Congestion Control Problems
Adjusting to bottleneck bandwidth
Adjusting to variations in bandwidth
Sharing bandwidth between flows
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Single Flow, Fixed Bandwidth
Adjust rate to match bottleneck bandwidth- Without any a priori knowledge
- Could be gigabit link, could be a modem
A B100 Mbps
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Single Flow, Varying Bandwidth
Adjust rate to match instantaneous bandwidth- Assuming you have rough idea of bandwidth
A BBW(t)
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Multiple Flows
Two Issues: Adjust total sending rate to match bandwidth Allocation of bandwidth between flows
A2 B2100 Mbps
A1
A3 B3
B1
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Reality
Congestion control is a resource allocation problem involving many flows, many links, and complicated global dynamics
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What’s Really Happening?View from a Single Flow
Knee – point after which - Throughput increases very slow
- Delay increases fast
Cliff – point after which- Throughput starts to decrease
very fast to zero (congestion collapse)
- Delay approaches infinity
Note (in an M/M/1 queue)- Delay = 1/(1 – utilization)
Load
Load
Th
rou
ghp
ut
De
lay
knee cliff
congestioncollapse
packetloss
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General Approaches
Send without care- Many packet drops- Not as stupid as it seems
Reservations- Pre-arrange bandwidth allocations- Requires negotiation before sending packets- Low utilization
Pricing- Don’t drop packets for the high-bidders- Requires payment model
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General Approaches (cont’d)
Dynamic Adjustment- Probe network to test level of congestion
- Speed up when no congestion
- Slow down when congestion
- Suboptimal, messy dynamics, simple to implement
All three techniques have their place- But for generic Internet usage, dynamic adjustment is
the most appropriate
- Due to pricing structure, traffic characteristics, and good citizenship
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TCP Congestion Control
TCP connection has window- Controls number of unacknowledged packets
Sending rate: ~Window/RTT
Vary window size to control sending rate
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Congestion Window (cwnd)
Limits how much data can be in transit Implemented as # of bytes Described as # packets in this lecture
EffectiveWindow = MaxWindow – (LastByteSent – LastByteAcked)
MaxWindow = min(cwnd, AdvertisedWindow)
LastByteAckedLastByteSent
sequence number increases
MaxWindow
EffectiveWindow
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Two Basic Components
Detecting congestion
Rate adjustment algorithm- Depends on congestion or not
- Three subproblems within adjustment problem
• Finding fixed bandwidth
• Adjusting to bandwidth variations
• Sharing bandwidth
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Detecting Congestion
Packet dropping is best sign of congestion- Delay-based methods are hard and risky
How do you detect packet drops? ACKs- TCP uses ACKs to signal receipt of data- ACK denotes last contiguous byte received
• Actually, ACKs indicate next segment expected
Two signs of packet drops- No ACK after certain time interval: time-out- Several duplicate ACKs (ignore for now)
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Rate Adjustment
Basic structure:- Upon receipt of ACK (of new data): increase rate
- Upon detection of loss: decrease rate
But what increase/decrease functions should we use?
- Depends on what problem we are solving
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Problem #1: Single Flow, Fixed BW
Want to get a first-order estimate of the available bandwidth
- Assume bandwidth is fixed- Ignore presence of other flows
Want to start slow, but rapidly increase rate until packet drop occurs (“slow-start”)
Adjustment: - cwnd initially set to 1- cwnd++ upon receipt of ACK
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Slow-Start
cwnd increases exponentially: cwnd doubles every time a full cwnd of packets has been sent
- Each ACK releases two packets
- Slow-start is called “slow” because of starting pointsegment 1cwnd = 1
cwnd = 2 segment 2segment 3
cwnd = 4 segment 4
segment 5segment 6segment 7
cwnd = 8
cwnd = 3
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Problems with Slow-Start
Slow-start can result in many losses- Roughly the size of cwnd ~ BW*RTT
Example:- At some point, cwnd is enough to fill “pipe”
- After another RTT, cwnd is double its previous value
- All the excess packets are dropped!
Need a more gentle adjustment algorithm once have rough estimate of bandwidth
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Problem #2: Single Flow, Varying BW
Want to be able to track available bandwidth, oscillating around its current value
Possible variations: (in terms of RTTs)- Multiplicative increase or decrease: cwnd a*cwnd- Additive increase or decrease: cwnd cwnd + b
Four alternatives:- AIAD: gentle increase, gentle decrease- AIMD: gentle increase, drastic decrease- MIAD: drastic increase, gentle decrease (too many losses)- MIMD: drastic increase and decrease
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Problem #3: Multiple Flows
Want steady state to be “fair”
Many notions of fairness, but here all we require is that two identical flows end up with the same bandwidth
This eliminates MIMD and AIAD
AIMD is the only remaining solution!
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Buffer and Window Dynamics
No congestion x increases by one packet/RTT every RTT Congestion decrease x by factor 2
A BC = 50 pkts/RTT
0
10
20
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50
60
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Backlog in router (pkts)Congested if > 20
Rate (pkts/RTT)
x
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AIMD Sharing Dynamics
A Bx
D E
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No congestion rate increases by one packet/RTT every RTT Congestion decrease rate by factor 2
Rates equalize fair share
y
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AIAD Sharing Dynamics
A Bx
D E No congestion x increases by one packet/RTT every RTT Congestion decrease x by 1
0
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y
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Efficient Allocation
Too slow- Fail to take advantage of
available bandwidth underload
Too fast- Overshoot knee overload,
high delay, loss Everyone’s doing it
- May all under/over shoot large oscillations
Optimal:
xi=Xgoal Efficiency = 1 - distance from
efficiency line
User 1: x1U
ser
2: x
2
Efficiencyline
2 user example
overload
underload
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AIMD
C
x
y
A Bx
C
D Ey
Limit rates:x = y
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Implementing AIMD
After each ACK- Increment cwnd by 1/cwnd (cwnd += 1/cwnd)
- As a result, cwnd is increased by one only if all segments in a cwnd have been acknowledged
But need to decide when to leave slow-start and enter AIMD Use ssthresh variable
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Slow Start/AIMD Pseudocode
Initially:cwnd = 1;ssthresh = infinite;
New ack received:if (cwnd < ssthresh) /* Slow Start*/ cwnd = cwnd + 1;else /* Congestion Avoidance */ cwnd = cwnd + 1/cwnd;
Timeout:/* Multiplicative decrease */ssthresh = cwnd/2;cwnd = 1;
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The big picture (with timeouts)
Time
cwnd
Timeout
SlowStart
AIMD
ssthresh
Timeout
SlowStart
SlowStart
AIMD
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Congestion Detection Revisited
Wait for Retransmission Time Out (RTO)- RTO kills throughput
In BSD TCP implementations, RTO is usually more than 500ms
- The granularity of RTT estimate is 500 ms
- Retransmission timeout is RTT + 4 * mean_deviation
Solution: Don’t wait for RTO to expire
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Fast Retransmits
Resend a segment after 3 duplicate ACKs
- Duplicate ACK means that an out-of sequence segment was received
Notes:- ACKs are for next
expected packet - Packet reordering can
cause duplicate ACKs- Window may be too small
to get enough duplicate ACKs
ACK 2
segment 1cwnd = 1
cwnd = 2 segment 2segment 3
ACK 4cwnd = 4 segment 4
segment 5segment 6segment 7
ACK 3
3 duplicateACKs
ACK 4
ACK 4
ACK 4
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Fast Recovery: After a Fast Retransmit
ssthresh = cwnd / 2 cwnd = ssthresh
- instead of setting cwnd to 1, cut cwnd in half (multiplicative decrease)
For each dup ack arrival- dupack++- MaxWindow = min(cwnd + dupack, AdvWin) - indicates packet left network, so we may be able to send more
Receive ack for new data (beyond initial dup ack)- dupack = 0- exit fast recovery
But when RTO expires still do cwnd = 1
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Fast Retransmit and Fast Recovery
Retransmit after 3 duplicated acks- Prevent expensive timeouts
Reduce slow starts At steady state, cwnd oscillates around the
optimal window size
Time
cwnd
Slow Start
AI/MD
Fast retransmit
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TCP Congestion Control Summary
Measure available bandwidth- Slow start: fast, hard on network- AIMD: slow, gentle on network
Detecting congestion- Timeout based on RTT
• robust, causes low throughput- Fast Retransmit: avoids timeouts when few packets lost
• can be fooled, maintains high throughput
Recovering from loss- Fast recovery: don’t set cwnd=1 with fast retransmits