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Abstract—Group multicast is a generalized multicast pattern such
that there exist multiple traffic sources in a multicast group. This
paper studies efficient QoS-guaranteed Group Multicast RWA
solutions, where the transmission delay from any source to any
destination within a multicast group is within a given bound.
Index Terms— group multicast, QoS, traffic grooming
I. INTRODUCTION
ulticast Routing and Wavelength Assignment
(MC-RWA) in optical WDM networks has been
investigated extensively in recent years [1]-[6].
MC-RWA problem deals with a special multicast pattern,
where each multicast session has only one member acting as
the traffic source. In a more generalized multicast pattern, any
subset of the member nodes in a multicast group is allowed to
send traffic with various rates to all other members within the
group. In this paper, we call this multicast pattern “group
multicast”, while calling the single-source multicast pattern as
“single multicast”. A typical example of group multicast is
bandwidth-demanding collaborative application, where
high-volume real-time data from more than one sites need to be
delivered concurrently to all members across a wide area.
Group multicast problem has been studied in IP networks
[12], where the lower bound of the total tree-cost is derived
using Lagrangean Relaxation and compared with the
performances of two IP group multicast heuristics. Both of
these two heuristics build one IP multicast tree for each traffic
source in a multicast group and resolve the over-saturated links
by rerouting some tree branches. Note that these IP group
This work was supported by the National Science Foundation (NSF) under
Grant Number SCI-0225642 and SCI-0123399, and was partly supported by
the Office of Science in the United States Department of Energy (DoE).
The authors are with the Department of ECE, University of Illinois at
Chicago, Chicago IL 60607, USA (email: [email protected], [email protected] ).
multicast heuristics cannot be directly applied to WDM
networks due to the different network architectures of
packet-switched IP networks and wavelength-routed WDM
networks. Therefore, to implement group multicast on WDM
networks, efficient Group Multicast Routing and Wavelength
Assignment (GMC-RWA) solutions are required. The solution
of GMC-RWA on all-optical transparent WDM networks is to
create separate light-trees (or light-forests) for each traffic
source in a multicast session. This approach is likely to give
very inefficient optical resource utilization, because traffic
sources in a multicast group may have various bandwidth
requirements, with some of them are far less than the
bandwidth of the wavelength channel (10-40Gbps), while at
the same time, the granularity of all-optical switch is fixed at
the whole wavelength level. Allocating the whole bandwidth
of a wavelength channel to each traffic stream wastes the
bandwidth resource especially for group multicast, where
traffic sources in a multicast group share most of the common
destinations.
Traffic aggregation on optical layer can be implemented by
traffic grooming, where multiple lower-rate traffic streams are
aggregated to a single higher-rate traffic stream using
wavelength-routed switch equipped with traffic-grooming
functionality [9]. The most popular approach to realize traffic
grooming in optical networks is converting optical signals to
electronic counterparts, which are multiplexed using Time
Division Multiplexer (TDM). The aggregated electronic signal
is then converted back to optical signal to transport in optical
channels. Traffic grooming has been studied in unicast case on
both ring and mesh optical networks [7]-[9]. Traffic grooming
for multicast has also begun to receive research attention [10],
where traffic streams from different single multicast sessions
can be groomed to improve wavelength bandwidth utilization.
Since TDM-based traffic grooming includes O-E-O
operation, additional processing delay is needed, which might
be considerably larger than transparent optical layer operation
(optical amplifier, optical splitter, etc.). To guarantee the
QoS-Guaranteed Routing and Wavelength
Assignment for Group Multicast in Optical
WDM Networks
Yuan Cao and Oliver Yu
M
0-7803-8956-5/05/$20.00 ©2005 IEEE. 175
end-to-end transport delay, it is required that the maximum
number of grooming operations from any traffic source to any
other member in the group is limited to a specified value. In
this paper, we consider the grooming delay as the major metric
of the end-to-end transport delay.
We formulate the QoS-guaranteed GMC-RWA problem as
an in-group traffic grooming and multicasting problem, where
traffic streams from members of the same group are groomed
in an effective way before being delivered to their common
destinations, subject to the following optical layer constraints.
First, the bandwidth summation of the traffic streams to be
aggregated should not exceed the bandwidth of a wavelength
channel. Second, we assume that there is no optical-layer
wavelength converter, which means that except at a switch
node where grooming operation is performed, wavelength
continuity constraint should be maintained. Beside these, the
maximum number of grooming operations along any route
should be constrained to provide QoS guaranteed services.
The rest of the paper is organized as follows. Section II
presents the problem statement mathematically. In section III,
heuristic solutions are proposed and their complexities and
performance bounds are analyzed. Section IV presents the
simulation results and analysis. Section V concludes the paper.
II. PROBLEM STATEMENT
We model a WDM mesh network as a directed graph
),( EVG , where V is the set of network nodes and E is the
set of directed edges. We assume every link in the physical
network is bidirectional (the study can be easily extended to
cases where asymmetric directed graph is assumed.). Denote
W as the number of wavelength channels in each directed
edge, and C as the bandwidth of each wavelength channel.
Each node Vn represents a wavelength-routed switch with
optical signal splitting and grooming capability (Fig.1). Fig.1
is an general architecture of optical switch capable of traffic
grooming. The actual architecture of the grooming module can
be based on either MPLS or SONET ADM (add-drop
multiplexer)[9]. Fig.1 also shows an example that incoming
traffic from port 1 is groomed with local traffic before being
outputted to port 2 (through port 8, OEC, GRM and port 6),
and incoming traffic from port 2 is groomed with local traffic
before being outputted to port 1 (through port 6, OEC, GRM
and port 8). Incoming traffic streams from port 1, port 2 and
local traffic stream are groomed and converted to optica signal
(through GRM, OEC, and port 9) before being fed into the
splitter (SPL) where the optical signal is split into two channels
outputting to port 3 and 5, respectively.
The QoS-guaranteed GMC-RWA problem is to find a
routing and wavelength assignment scheme for a given group
multicast session such that traffic stream from each source
node is delivered to all other member node in the group along a
route that contains no more than the specified number of
grooming operations. The objective can be the minimization of
the total number of wavelength channels, or the minimization
of the maximum number of wavelength per link, etc.
Fig.2 presents an illustrative example. In Fig.2, station
(node) 1-5 are the members of a group multicast, node 1-3 are
the traffic sources, which have traffic streams 1
t ,2
t , and 3
t ,
respectively. Directed edges stand for the wavelength
channels. The label above each edge shows the traffic streams
that are carried in the wavelength channel. Suppose the
summation of traffic rates of the three traffic streams does not
exceed the bandwidth of the wavelength channel. Fig.2 shows
that traffic 2t and 3
t are groomed at node 2 and delivered to
node 1; traffic 1
t and 2
t are groomed at node 2 and delivered
to node 3; traffic 1
t ,2
t and 3
t are groomed at node 2 and
delivered to node 4 and node 5. The scenario showed in Fig.1
illustrates the traffic flows for the station 2 in Fig.2,
considering port 1, 2, 3 and 5 of the switch node 2 are the
interfaces with switch nodes 1, 3, 4 and 5, respectively.
OXC
6
8
7
9
1
2
3
5
S
P
L
O
E
C
O
E
C
G
R
M
G
R
M
G
R
M
Local
Station
O
E
C
4
1
0
Fig. 1 Switch Architecture
Notations: OEC: Optical/Electrical Converter;
GRM: Grooming module; SPL: Optical Splitter
176
t1, t2, t3
t1
t1, t2
,t3
t1,t2
,t3
t2,t3
t1
t1,t3
t2
t1,t2
t3
t2, t3 t1, t2
t3
t1, t2, t3
Station 1 Station 2 Station 3
Station 4 Station 5
Fig. 2 Illustrative Example
Following is the mathematical formulation of the
QoS-guaranteed GMC-RWA problem, taking the
minimization of the total number of wavelength channels as the
objective. For a given multicast session, let VM represent
the set of all members in this multicast session.
Let MsssS S }...,,,{ 21 represent the set of all traffic
sources in this session. For each traffic source Ssi , the set of
destination nodes of this traffic stream is isM .
Let the traffic stream from is be named as )( ist , and denote
)( iR st as its rate. Note that )( iR st is a predefined constant, and
we assume SsCst iiR )( .
Define nmP , as the edge indicator, which is equal to 1 if there
exists a directed edge from m to n in G , 0,nmP otherwise.
Denote )}(,1),(:{)( GVnmnnmN as the set of
neighborhood of node m ;
Denote ),( inD as the grooming hops from source is to
member node n , for isMn . Denote )(max nD as the
maximum allowable grooming hops from any source to
member node n . We assume in this paper that all nodes have
the same QoS requirement, thus maxmax )( DnD for
Vn . maxD is predefined QoS specification.
Other variables are:
wavelength channel traffic usage indicator )(),( wLinm : equals
1 if )( ist uses wavelength w on link ),( nm ; 0 otherwise;
wavelength channel overall usage indicator )(),( wL nm : equals
1 if wavelength w on link ),( nm is used for any
Ssst ii )( ; 0 otherwise.
node traffic presenting indicator i
mV : equals 1 if traffic )( ist
is present at node m ; 0 otherwise.
commodity-flow value i
nmF ),( : an integer value, which is
defined as the number of units of commodity flowing on the
link ),( nm (number of destinations reached through this link)
for traffic )( ist [13].
We assume a non-blocking model and investigate efficient
ways to implement group multicast such that the wavelength
channel utilization is minimized.
A. Objective
)( )(),( )(Minimize
GVn nNm wnm wL (1)
B. Constraints
,1i
nV ],,1[ Si Mn (2)
nmi
nm PwL ,),( )( ],,1[ Si nm, (3)
i
inmiR CwLst )()( ),( ],1[ Ww (4)
iq
n
iq
imn
n
imn
n
inm
smM
sMmF
MmF
F
,1
,1
,
),(
),(
),( ],1[ Si
(5)
,0),(
n
isn i
F ],,1[ Si (6)
,),( maxDinD ],1[, SiMn (7)
(2)-(7) give the brief description of the problem constraints.
Equation (2) guarantees that traffic )( ist is present at every
member node of the multicast group. Equation (3) gives the
physical topology constraint. Equation (4) presents the
bandwidth constraint. Equation (5) - (6) presents the
commodity-flow conservation constraints. Equation (7) limits
the number of grooming hops along the route between each
source-destination pair.
QoS-guaranteed GMC-RWA problem is NP-complete ,
because if we relax the grooming hops constraint
177
InfinityDmax and consider the simplest cast with 1S ,
the problem is equivalent to the well-known Steiner Problem in
Networks [11], which is NP-complete. Therefore, efficient
heuristics are required, which are proposed in next section.
III. PROPOSED HEURISTICS
In this section, we propose heuristic algorithms to solve the
QoS-guaranteed GMC-RWA problem. The main idea is to
construct a source grooming core where traffic streams from
multiple sources in the multicast group are aggregated where
applicable, before being delivered to all other destinations that
are not already included in the core. The routing part of these
heuristics includes two serial steps: source grooming core
formation, and “merged” forest extension, as explained in the
following.
A. Introduction
In the first step, the source grooming core is constructed.
The backbone structure of the grooming core is a set of trees,
namely Source Grooming Trees (SGT). Each tree includes a
subset of the source nodes in the multicast group, and may
include destination-only member nodes and non-member
nodes if applicable. Traffic streams from the source nodes on
each SGT are groomed at the non-leaf source nodes of the
SGT. Traffic streams from different SGTs are not groomed.
The physical structure of the grooming core is based on the set
of SGTs in such a way that links on each SGT represent
bidirectional link pairs, this is due to the problem definition of
GMC-RWA where each source node is also a destination node
of all other traffic streams within the multicast group. In the
illustrative example in Fig.2, source node 1, 2 and 3, together
with the bi-directional links connecting them, form the SGT in
that example.
In the next step, the grooming core is extended to a
“merged” forest such that groomed traffic on each SGT will be
delivered to all other members that are not on this SGT. This
step can be done by considering each SGT as a “single” traffic
source node and performing normal multicast tree construction
to cover all other members that are not on this SGT.
For each node that performs grooming on a SGT,
wavelength continuity is not compulsory; wavelength
continuity should be kept elsewhere, because no optical layer
wavelength converter is assumed. First-fit algorithm is adopted
in the wavelength assignment. The self-explanatory pseudo
code is given in the following part.
B. Pseudo Code
The pseudo code for the proposed algorithm includes 4
steps: Initiation, Grooming Core Formulation, Merged Forest
Extension and Wavelength Assignment, listed in Table I, II, IV
and V, the subprogram of )(_ DistCalculate in Grooming
Core Formulation is listed in Table III.
TABLE I
NOTATION AND INITIATION
setR : set of source nodes not on any SGT , SsetR ;
r : number of already constructed SGTs, 0r ;
jSGT_ : the j-th SGT;
v : initial node of current SGT;
setU : set of source nodes that can not be added to the current
SGT, setU ;
nodeToAdd : node to be added to the SGT or extended forest;
accessPnt : access point of the node nodeToAdd to the SGT or
extended forest;
mDist : minimum distance from any member node
currently outside the SGT or extended forest to
any node currently on the SGT or extended forest;
),( nmdist : shortest distance between node m and node n ;
),_SGT( njdist : shortest distance between node n and any
source node on jSGT_ ;
)(i
sRt : traffic rate of source i
s ;
)_SGT( jRt : traffic rate summation of all source nodes on
jSGT_ .
),( nmD : number of grooming hops from node m to node n .
TABLE II
GROOMING CORE FORMATION
while ( etRs ) {
Choose node v which requires the highest bandwidth;
}{vsetRsetR and ;1rr
while ( etRs ) {
;NULLnodeToAdd ;NULLaccessPnt ;mDist
DistCalculate_ ( rSGT_ , setR , setU );
if ( ;!mDist ) {
add nodeToAdd to rSGT_ through accessPnt ;
for each node n in r_SGT :
update ),( nodeToAddnD and )_SGT( rt ;
}
}
;s setUetR ;setU
}
178
TABLE III
Calculate_Distance ( ) SUBPROGRAM
DistCalculate _ ( rSGT_ , setR , setU ):
for ( setRi
sall ) {
),_SGT(i
srdist ;
if ( CrRiR tst )_SGT()( )
move is from setR to setU
else {
for ( rk SGT_all ) {
if (max
),( DnkD for rn SGT_all and
),_SGT(),(ii
srdistskdist ){
)sk,(dist)sSGT_r,(distii
;
istempNode 1_ ;
ktempNode 2_ ;
}
}
if ( ),_SGT(i
srdist )
move is from setR to setU
else if ( mDistsrdisti),_SGT( ) {
),_SGT(i
srdistmDist ;
1_tempNodenodeToAdd ;
2_tempNodeaccessPnt ;
}
}
}
TABLE IV
MERGED FOREST EXTENSION
for (each jSGT_ generated above) {
let }SGT_jonnodes{_ MjsetD ;
while ( jetD _s ){
;NULLnodeToAdd
;NULLaccessPnt
;mDist
for ( jSGT_n and jetD_sm ) {
if ( mDistmndistandDnD ),(max)(max ){
;mnodeToAdd
;naccessPnt
);,( mndistmDist
}
}
add nodeToAdd to rSGT_ through accessPnt ;
}
}
C. Complexity
The complexity of step 1 is )(4
SO , and the complexity of
step2 is )(2
MSO . The complexity of wave-length assignment is
)( MEWO , thus the overall complexity is
)(3
MEWMSO .
TABLE V
WAVELENGTH ASSIGNMENT
for (each jSGT_ plus its extended branches) {
Partition all the directed links into categories
according to the grooming nodes on this SGT.
Assign each category with the first available
wavelength.
}
D. Number of SGTs per Session
Since the summation of the traffic streams in a group
multicast session may exceed the bandwidth of the wavelength
channel, multiple SGTs may need to be constructed. Let sgn
be the number of SGTs required by the multicast session in the
heuristic. CtR / gives the lower bound of this quantity. The
ratioCt
sg
R
n
/
is close to 1 from experimental results (refer to section
IV).
E. Comparison with Optimal Solution
Let OPTcost be the cost of the optimal solution to GMC-RWA;
Heucost be the cost of the heuristic solution;
Steinercost be the cost of Steiner tree that connects all the
member nodes of the multicast group;
MPHcost be the cost of Minimum Path Heuristic (MPH)[4] to
construct the multicast tree that connects all the members.
Denote jET_ as the extension of jSGT_ that reaches other
member nodes which are not on jSGT_ .
Assume InfinityDmax .
Since MPH is 2-approximation, SteinerMPH cost2cost .
sgsg n
j
j_j
n
j
j_jHeu
1
_ET2SGT
1
_ETSGT )(ostc)(costcost
SteinersgMPHsg nn cost4cost2 (8)
SteinerCtOPT R costcost / , (9)
thus we have
OPTCt
sg
HeuR
ncost4cost
/
(10)
F. Lower Bound Analysis
179
Assume the uniform cost of all wavelength channels. Let
wln be the number of wavelength channels used, and j
sgS be the set
of member nodes on jSGT_ .
wlwlHeu nccost
sgn
j
jsg
jsgwl SMSc
1
)()1(2
sgn
j
jsgwl SMc
1
2
SMnc sgwl )2(
SMc Ctwl R )2(/ (11)
G. Improvement to the heuristic
A possible improvement to the above algorithm is
considering physical distance between source nodes as a
metric in construction the grooming core. The idea is trying
to subdivide the source node sets such that nodes with
shorter distance are more likely to join in the same SGT, thus
keep the grooming delay (number of grooming hops along a
route) as small as possible.
In step 1, the improved algorithm selects node 1v and 2v from
setR , such that distance between 1v and 2v is the largest,
then pick the one with larger rate as the initial node v of the
new SGT: rSGT_ , remove v from setR . Simulation results
show that this can lower the average grooming hops while keeping
the resource utilization performance.
IV. SIMULATION RESULTS
Simulations are performed in two type of topologies: the first
is a typical mid-sized network (14-node NSFNET, see Fig.3),
and the second is random large-sized networks (100-node
random topology based on Doar and Leslie’s random graph
model [15]). All the following simulation results are the
running average of 100 simulations. We only present the
results of the original algorithm wherever the results of the two
algorithms are similar, and highlight their difference with
regard to the delay improvement.
A. Simulation Scenario 1: 14-node NSFnet
In the first experiment scenario, a 14-node NSFnet (Fig.3) is
used. Two experiment settings are simulated in this scenario,
with traffic patterns being randomly generated in each setting.
In the first setting, the member size M is set to be 10, and
the traffic source member size S is set to be 6. In this simulation
setting, we study the performance of the heuristic with various delay
constraints (grooming hops) while the average traffic rate increases
from C01.0 to C . Fig.4(a) shows the total number of
wavelength channels used per traffic session versus the
average traffic rate. We can see that when maxD ( maximum
allowable number of grooming hops) is unlimited, the number of
wavelength channels needed can be reduced up to 70%
compared with no traffic grooming ( when maxD is 0), and by
allowing the maximum grooming hop constraint 2maxD ,
very similar performance to InfinityDmax case can be
achieved. That is to say, allowing maximum number of
grooming hops no less than 1 gives satisfying network resource
utilization, while at the same time, guarantees the end-to-end
traffic delay. In this figure, we also present the optimization
result using the optimization tool CPLEX[16] to solve the
ILP(Integer Linear Programming) model presented in section
II. for unlimited maxD (This is done by relaxing the last
constraint, thus giving the lower bound of wavelength resource
utilization by numerical solution. From Fig.4(a) we notice that
our theoretical analysis lower bound roughly coincides with
this numerical solution lower bound). Due to the high
complexity of optimization operation, we only run 10 times
(with random traffic patterns) for each entry and present the
lowest optimization result. From the result, we can see that the
optimization curve roughly coincides with our theoretical
lower bound, and that our heuristic is very close to these two
benchmarks.
Fig.4(b) shows the maximum number of wavelength used
per link when average traffic rate varies from C01.0 to C , and
the result proves the similar argument above. Fig.4(c) presents
the average number of SGTs generated by the heuristic for
each traffic session ( sgn in section III ).
1
2
3
4
57
89
11
12
13
14
106
Fig. 3 14-node NSFnet topology
180
We use CtR / as the lower bound of sgn for comparison. We
can see that when 2maxD , the ratio Ct
sg
R
n
/
is very close to 1
(less than 1.2 for all traffic rate choices simulated).
From Fig.4, we can see that when the average traffic rate falls
between C3.0 and C7.0 , the performance of the heuristic under
different maxD constraints are similar (except the one with
0maxD , which does not allow grooming, thus gives the
constant performance disregarding the varying average traffic
rate). The reason is that in this traffic bandwidth range, most
likely only 2 traffic source members are allowed on each SGT,
thus the grooming hop number is most likely to be 1, so
different cases with 1maxD give similar results. When the
average traffic rate is less than C3.0 , cases with 2maxD
perform well better than the case with cases with 1maxD .
When the average traffic rate is bigger than C7.0 , most likely no
traffic source can be groomed with another one, thus results of all
cases converge.
In the second setting of simulation scenario 1, the traffic
source member size S is set to be half of the member size M ,
and the average source traffic rate is set to be C2.0 . In this setting,
we study the performance of the heuristic with various delay
constraints (grooming hops) while the member size increases from 2
to 14. Fig.5(a) shows the total number of wavelength channels
used per traffic session versus the member size. We can see
that when maxD ( maximum allowable number of grooming hops)
is unlimited, the number of wavelength channels needed can be
reduced up to more than 60% compared with no traffic
grooming ( when maxD is 0), and by allowing the maximum
grooming hop constraint 2maxD , again very similar
performance to unlimited grooming distance case can be
achieved. Fig.5(b) shows the maximum number of wavelength
used per link when the member size increases from 2 to 14. and the
result proves the similar argument that 2maxD gives both
constrained end-to-end delay and efficient resource utilization.
Fig.5(c) presents the average number of SGTs generated by the
heuristic for each traffic session. We can see that when
2maxD , the ratio Ct
sg
R
n
/
is very always almost to 1 (at most
1.01 for all member size cases simulated).
From Fig.5, we can see that when we set 2maxD , the heuristic
gives very similar results, thus 2maxD is enough for
achieving efficient resource utilization while guaranteeing the
end-to-end delay QoS. We can also find that when the member
size and traffic source size of a group multicast session are sufficiently
large, cases with 2maxD perform well better than the case
with cases with 1maxD (at most one grooming hop allowed)
and 0maxD (no grooming hop allowed). When member size
is small, especially when 12/MS , the five QoS cases (
with maxD being 0, 1, 2, 3, and infinity) perform exactly the
same, because this is the case of “single multicast” where the
heuristic is equivalent to MPH of MC-RWA problem.
0 0.1 0.2 0.3 0.4 0.5 0.6 0.7 0.8 0.9 110
20
30
40
50
60
70
average rate (C)
tota
l w
avele
ngth
channels
used
Dmax
= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= 4
Dmax
= Inf
Analysis Lower Bound
CPLEX Optimization
(a)
0 0.1 0.2 0.3 0.4 0.5 0.6 0.7 0.8 0.9 11
1.5
2
2.5
3
3.5
4
4.5
5
5.5
average rate (C)
maxim
um
wavele
ngth
per
link
Dmax
= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= 4
Dmax
= Inf
(b)
181
0 0.1 0.2 0.3 0.4 0.5 0.6 0.7 0.8 0.9 10
1
2
3
4
5
6
average rate (C)
avera
ge n
um
er
of
SG
Ts
per
sessio
n
Dmax
= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= 4
Dmax
= Inf
Analysis Lower Bound
(c)
Fig.4 Simulation Results on NSF network in setting 1
(a) total number of wavelength versus traffic rate
(b) maximum number of wavelength per link versus traffic rate
(c) number of SGTs per session versus traffic rate
2 4 6 8 10 12 140
10
20
30
40
50
60
70
80
90
100
member size
tota
l w
avele
ngth
channels
used
Dmax
= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= Inf
Analysis Lower Bound
(a)
2 4 6 8 10 12 141
2
3
4
5
6
7
member size
maxim
um
wavele
ngth
per
link
Dmax
= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= Inf
(b)
2 4 6 8 10 12 141
2
3
4
5
6
7
member size
avera
ge n
um
ber
of
SG
Ts
per
sessio
n
Dmax
= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= Inf
Analysis Lower Bound
(c)
Fig.5 Simulation Results on NSF network in setting 2
(a) total number of wavelength versus member size
(b) maximum number of wavelength per link versus member size
(c) number of SGTs per session versus member size
B. Simulation Scenario 2: 100-node random topology
In the second simulation scenario, a relatively large-sized
(with 100 nodes) random topology is adopted. The random
topology generation is based on Doar and Leslie’s random
graph model, which is modified from Waxman’s random
topology model [14], where the random topology is generated
by randomly placing n nodes at locations with integer coordinates in
a Cartesian coordinate grid. The edge between any possible nodal
pairs ),( vu is added to the graph by considering the Euclidean
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distance between the pair of nodes and some given topology
parameters. Doar and Leslie modified Waxman’s model by scaling
down the edge-adding probability by a factor of n , so that the
average nodal degree will not be affected by network size.
In our simulation below, we choose 100n , and randomly
placing 100 nodes in a 100100 rectangular grid. To make sure
the generated graph is connected, we first construct a random
spanning tree across the 100 nodes, and then apply the
Doar-Leslie’s model to randomly add edges using the
following edge adding probability:
]),(
exp[),(L
vud
nvuPe (12)
where ),( vud is the Euclidean distance of nodal pair ),( vu , L is
the maximum distance between any two nodes. Parameter and
are in the range of ]1,0( , and they both decide the characteristic of
the generated topology: larger value of gives more connections
with long distances, while larger value of produces larger average
nodal degree. In our simulation, wavelength links are assumed to have
uniform cost disregarding the length (distance of the nodal pair), thus
we fix the parameter and focus on studying the performance of the
heuristic in random topologies with different average nodal degree
(by varying the value of parameter ). Table VI shows the
corresponding average nodal degree of generated topology with
different values of used in our experiment.
TABLE VI NOTATION AND INITIATION
Random topology characteristic ( 2.0 )
0.1 0.2 0.3 0.4 0.5
average nodal
degree
2.32 2.64 2.82 3.0 3.84
We choose group size to be 30, where 15 member nodes act
as traffic sources. Group members are randomly selected
among all 100 nodes, and source nodes are randomly selected
among the group member nodes. The traffic rate is randomly
chosen from ]6.0,0( C , with the average rate C3.0 .
Fig.6(a) shows the number of wavelength channels used
versus average nodal degree. We can see that the number of
wavelength channels needed for the group multicast decreases
about 20% when average nodal degree increases from 2.32 to
3.84, because a more densely connected network gives better
opportunity for traffic grooming. Fig.6(b) shows the maximum
number of wavelength used per link when the average nodal
degree increases from 2.32 to 3.84. Again, 2maxD gives both
constrained end-to-end delay and efficient resource utilization,
this proves again that the QoS-related constraint 2maxD
will not burden the network resource usage even for
large-sized randomly generated various network topologies.
Fig. 6(c) presents the comparison of the original algorithm and
the improved algorithm with regard to the maximum grooming
delay, the value is the average over all SGTs in all 100
simulations. We can see that the lower the value of maxD , the
smaller the grooming hop delay in the outcome, and the
improved algorithm always gives smaller grooming delay
compared with the original one with the same maxD
constraint.
0.1 0.15 0.2 0.25 0.3 0.35 0.4 0.45 0.5
102.5
102.6
102.7
102.8
102.9
parameter beta
tota
l w
avele
ngth
channels
used D
max= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= Inf
(a)
0.1 0.15 0.2 0.25 0.3 0.35 0.4 0.45 0.56
7
8
9
10
11
12
13
14
15
16
parameter beta
maxim
um
wavele
ngth
per
link D
max= 0
Dmax
= 1
Dmax
= 2
Dmax
= 3
Dmax
= Inf
(b)
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0.1 0.15 0.2 0.25 0.3 0.35 0.4 0.45 0.51
1.1
1.2
1.3
1.4
1.5
1.6
1.7
1.8
1.9
2
parameter beta
maxim
um
gro
om
ing h
ops (
avera
ge o
ver
all S
GT
s)
Dmax
= Inf, Original
Dmax
= Inf, Improved
Dmax
= 3, Original
Dmax
= 3, Improved
Dmax
= 2, Original
Dmax
= 2, Improved
(c)
Fig. 6 Simulation Results on 100-node random topologies
(a) total number of wavelength versus parameter
(b) maximum number of wavelength per link versus
parameter
(c) average maximum grooming hops versus parameter
V. CONCLUSION
In this paper, we study the problem of group multicast in
WDM mesh networks under end-to-end delay QoS constraint.
We mathematically formulate the problem and propose
heuristic algorithms to efficiently solve it. Simulations on both
a typical mid-sized network and large-sized random topology
networks show that the proposed heuristic can achieve efficient
resource utilization with end-to-end grooming hops as small as
two.
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