self-organizing power control
TRANSCRIPT
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Self-Organizing Fractional Power Control for
Interference Coordination in OFDMA Networks
Richard Combes,Zwi Altman and Eitan Altman
France Telecom Research and Development
38/40 rue du General Leclerc,92794 Issy-les-Moulineaux
Email:{richard.combes,zwi.altman}@orange-ftgroup.comINRIA Sophia Antipolis
06902 Sophia Antipolis, France
Email:[email protected]
AbstractThis paper shows a Self-organizing networks (SON)algorithm for interference coordination in downlink OrthogonalFrequency-Division Multiple Access (OFDMA) networks. A dis-tributed algorithm is introduced with a proof of convergence fora static user population. The algorithm uses closed-form formulasfor the transmit powers update, and is therefore computationally
light. The proposed algorithm is applied to a 39 cells dynamicnetwork simulator with an File Transfer Protocol (FTP) service,showing significant performance gains over a Reuse 1. TheQuality of Service (QoS) of cell-edge users improves withoutdegrading the QoS of other users. The trade-off between BlockCall Rate (BCR), which is the proportion of users rejectedby admission control, and cell-edge user throughput is shown,and a simple method for the network operator to manage it isprovided.1
Index TermsWireless networks, Self-Optimizing Networks,OFDMA Networks, Interference Coordination, DistributedPower Control
I. INTRODUCTION
In multiuser communication networks, interference man-agement is often a central issue for increasing the system
performance and has been the subject of much research in both
wired and wireless networks. Different techniques have been
suggested: optimization of a static power allocation ([1], [2]),
dynamic power control ([3]), inter-cell scheduling ([4], [5]),
load balancing ([6]) and dynamic beam-forming ([7]) to name
but a few. Interference is particularly harmful for cell-edge
users i.e users with low Signal to Interference plus Noise Ratio
(SINR) and can cause considerable degradation of experienced
QoS. Strict requirements for cell-edge user throughput have
been defined by [8].
Two issues have not, to our knowledge, been addressed by
previous work: the first is the fact that interference coordi-
nation can possibly increase the BCR of some Base Station
(BS) and how to control it, and the second is how to find
closed-form formulas for the power update, so that the power
control algorithm is computationally light. We address both
these problems in this paper, and show that the signaling load
of the algorithm is minimal.
1This work has been partially supported by the Agence Nationale de laRecherche within the project ANR-09-VERS0: ECOSCELLS.
The first contribution of this paper is a distributed dynamic
interference coordination algorithm for downlink OFDMA net-
works which uses information available from neighboring cells
through the X2 interface (a link between neighboring BSs).
The BSs update their transmit powers every 1s using closed-
form formulas which incorporate the effects of fast-fadingand opportunistic scheduling. The computing power required
is hence minimal. The second contribution of this paper is
to show the trade-off between cell-edge user throughput and
BCR, and to provide the network operator with a simple
way to manage this trade-off by adjusting a parameter of our
algorithm.
This paper is organized as follows: Section II states the
dynamic power control problem in an OFDMA network and
gives a general distributed algorithm to solve it. Section III
describes the system model of a downlink OFDMA network
we are considering, and provides the closed-form formulas that
are necessary for the power control algorithm. An analysis
of the signaling load of the algorithm is given. In SectionIV we simulate the proposed algorithm in a 39 BSs dynamicnetwork simulator, and demonstrate the important resulting
gains. A method for managing the trade-off between cell-edge
user throughput and BCR is also given. Section V concludes
the paper.
I I . PROBLEM STATEMENT AND PROPOSED ALGORITHM
A. Optimization Problem
We consider a downlink OFDMA network and an FTP
service with NBS BS. The bandwidth allocated to each cell
is divided into Np Physical Resource Block (PRB). For more
generality, PRBs are grouped in Nb sub-bands, and the powertransmitted by a BS on two PRBs of the same sub-band is the
same. We introduce the following quantities: P(b)s is the power
emitted by BS s on a PRB of band b, Pmax the maximum
transmit power on a PRB, and Us is the utility observed by s,
to be defined in the next section. The total network utility is
then U =
1sNBSUs. For a given distribution of users in
the network, the BSs have to solve the optimization problem
described in (1), where gl , 1 l Nl are convex functionswhich represents constraints and will be addressed later. We
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assume that we do not control the scheduling strategy.
maximize U (1)
subject to 0 P(b)s Pmax , 1 s NBS , 1 b Nb
and gl((P(b)s )1bNb) 0 , 1 s NBS , 1 l Nl
Let us denote by P the subset of (R)NbNBS which satisfiesthe constraints in (1), and Ps the subset ofRNb which satisfiesthe constraints relative to BS s. It is noted that P = P1 ... PNBS is a product of convex sets, hence convex.
B. Requirements on the algorithm
We first impose the choice of a distributed algorithm which
fits the flat architecture of future radio access networks. At
each step of the algorithm, BS s observes its utility Us,
exchanges some information with its neighbors and modifies
its transmit powers (P(b)s )1bNb accordingly. Furthermore,
it is noted that finding the global optimum in (1) is NP-
hard ([9]) in most cases, hence we are simply concerned with
finding a local maximum ofU in a few iterations with minimal
computing effort.
C. Basic Algorithm
We use the approach introduced in [10] for solving a
constrained optimization problem in a distributed fashion. Let
(t) RNbNBS , t N denote the power allocation of thenetwork at time t, and (0) P. We can then apply thefollowing gradient descent algorithm:
(0) P , (t + 1) =
(t) + U((t))+
(2)
where [.]+ denotes the projection on P with respect to theeuclidean norm, and a constant step size. It is noted that the
projection is well defined since P is convex.Furthermore, since P is a product of convex sets, we have
that (2) can be implemented in a distributed way. Let s(t) RNb , t N denote the power allocation of BS s, at time t,we then obtain the following algorithm, for 1 s NBS:
s(0) Ps , s(t + 1) =
s(t) + sU(s(t))+
(3)
where s is the gradient with respect to (P(b)s )1bNb .
Furthermore, [10](Proposition 3.8, Page 219) gives the
following convergence theorem:
Theorem 1. If we assume thatP is a product of convex sets,thatU is bounded below and that U is Lipschitz continuous,
then there exists 0 such that if0 < 0 then (3) convergesto a local maximum of U in P.
III. MULTI-CELL OFDMA SYSTEM MODEL
A. SINR
We consider a multi cell OFDMA network, and an FTP ser-
vice. Users arrive randomly according to a Poisson process of
rate , with a file of a given size, and leave the network when
they have completed the transfer. It is noted that some users
might be rejected because of admission control mechanisms.
Let us consider a user i and a BS s. The signal from s received
by i is proportional to the power emitted by s, and we define
hs,i the proportionality coefficient, which is the product of
path loss and shadowing:
hs,i =A
(ds,i)s,i (4)
where ds,i is the distance between i and s, s,i = 101+220 with
1 and 2 are two independent normally distributed random
variables with mean 0 and variance and A and are twoconstants that depend on the environment.
Let s be the serving BS for user i and Ns the neighboringBSs of s. The mean SINR on a PRB in band b S
(b)s,i is
then calculated by summing the interference from neighboring
cells:
S(b)s,i =
hs,iP(b)s
N20 +
sNshs,iP
(b)s
(5)
with N20 the thermal noise.
B. Proportional Fair (PF) scheduler
We will use the following notations: let r(p)i,tm denote theinstantaneous bitrate of user i at time tm on PRB p, and ri,tmthe average allocated bitrate to user i during [t0, tm]. Let
denote a small constant averaging parameter. We write T(p)tm
=i if user i was scheduled for transmission on PRB p at time
tm. The average bitrate is then calculated by the following
low-pass filter:
ri,tm+1 = (1 )ri,tm +
Npp=1
i,T
(p)tm+1
r(p)i,tm+1
(6)
where is Kroneckers delta.The PF scheduler chooses the user for transmission on PRB
p at time tm+1 according to the following rule:
T(p)tm+1
= arg maxi
r(p)i,tm+1
ri,tm(7)
We denote by ri the limit of ri,tm when tm + , 0+ if it exists. For a proof of convergence of the PF scheduler,the reader can refer to [11], and to [12] for the more general
case of the -fair scheduler.
C. Scheduling gain
We assume a Raleigh fading model: r(p)i,tm
= (S(p)i
(p)i,tm
)
where (p)i,tm
is an exponentially distributed random variable of
mean 1, with (p)i,tm
(p)i,tm
, p = p, (p)i,tm
(p)i,tm
, i = i and
(p)i,tm (p)i,tm
, m = m. is a quality table which links achannel state to the corresponding instantaneous bitrate and is
obtained by link-level simulation.
We first define which associates the SINR of a user on aPRB of band b with his throughput on this band when he is
alone in the cell:
(S(b)s,i ) =
Np
Nb
+0
(xS(b)s,i )e
xdx =Np
NbS(b)s,i
L
1
S(b)s,i
(8)
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with L the Laplace transform of. We can then calculate themean allocated throughput by the Round Robin (RR) scheduler
for user i:
ri,RR =1
Nu(s)
Nbb=1
S(b)s,i
(9)
where Nu(s) is the number of users present in s.
For the PF, the mean throughput can also be calculated inclosed form, see [13]:
ri,PF =
Nbb=1
Nu(s)1k=0
Nu(s) 1
k
(1)k
k + 1
S(b)s,i
k + 1
(10)
One must be careful however, since (10) is only exact when
the mean SINR of a user is the same on all PRBs, that is
S(b)s,i = S
(b)s,i , (b, b
, s , i), and becomes a lower bound forri,PF in other cases. A formal justification for this is given in
[14].
D. Form of utility and gradient calculation
We choose an -fair form of utility ([15]), with R+,
d > 0 a small constant, and f(x) =(x+d)11
1 if = 1and f1(x) = log(x + d) :
Us =
Nu(s)i=1
f(ri) (11)
We can now calculate the gradient of the network utility
with respect to the BSs power levels for both RR and PF
schedulers.
1) RR scheduler: We first consider the derivative with
respect to the BSs own power level:
Us
P(b)s
=1
Nu(s)
Nu(s)i=1
1
(ri,RR + d)
Nbb=1
S(b)s,i
P(b)s,i
S(b)s,i
(12)
Now we consider the neighbors power level, if s1 Ns:
Us
P(b)s1
=1
Nu(s)
Nu(s)i=1
1
(ri,RR + d)Nbb=1
hs1,i(S
(b)s,i )
2
hs,iP(b)s
S(b)s,i
(13)
2) PF scheduler: For a PF scheduler, the same type of
formulas can be obtained:
Us
P(b)s
=
Nu(s)i=1
1
(ri,PF + d)
Nb
b=1
Nu(s)1k=0
Nu(s) 1
k
(1)kS(b)s,i
(k + 1)2P(b)s,i
S(b)s,i
k + 1
(14)
Us
P(b)s1
=
Nu(s)i=1
1
(ri,PF + d)
Nb
b=1
Nu(s)1k=0
Nu(s) 1
k
(1)k+1hs1,i(S(b)s,i )
2
(k + 1)2hs,iP(b)s
S(b)s,i
k + 1
(15)
E. Constraints
We define constraints on the maximal and minimal totaltransmit power: g1((P
(b)s )1bNb) =
NpNb
Nbb=1 P
(b)s Ptot
and g2((P(b)s )1bNb) = Ptot
NpNb
Nbb=1 P
(b)s where Ptot
is the maximum total transmit power and (0, 1] - theminimum proportion of total transmit power. It is noted that
those functions are linear hence convex.
The constraint on the minimal transmit power has two
interests: first, it prevents a numerical instability near 0 when > 0, since the utility gradient becomes very large if a BStransmits a total power of zero. The second interest is that
for close to 0, the unconstrained algorithm could result incertain BSs transmitting very low power, causing a dramatic
increase in their load and BCR.
It is noted that fixing a value of is akin to giving alower bound on the worst-case BCR. The justification is the
following: consider the case in which BS s transmits a total
power of Ptot, and all its neighbors transmit at full power.
Then the BCR observed in BS s in this situation is an upper
bound for the BCR that could be observed in other situations
in BS s. Therefore, taking the maximum of this value on all
BSs gives an upper bound for the BCR observable on the
network.
Furthermore, increasing reduces the size of the constraints
set, reducing the maximum possible gains achievable by a
power control algorithm. This is why controls a trade-off
between BCR and Inter-Cell Interference Coordination (ICIC)
gains.
F. Implementation and signaling load
Every 1s, BS s calculates and forwards UsP
(b)s1
, 1 b Nb
to s1 if s1 is a neighbor of s. Hence, assuming Nb = 3 bands,6 neighbors for each BS and that each derivative is stored asa 32-bits floating point number, the signaling load is of 576
bits/s per station, which is extremely small compared with the
expected capacity available on the X2 interface. Furthermore
the delay requirement of 1s is also easily satisfied, as a delaybetween 20ms and 50ms is expected on the X2 interface.
IV. SIMULATION
A. Network Simulator
The algorithm is implemented in a large scale network
simulator with 39 BSs. The throughput allocated by thescheduler is calculated in closed-form using equations (9) and
(10). Every 1s, the transmit power of each BS is adjustedaccording to the power control algorithm described above. The
algorithm has been simulated for Nb = 3. Three algorithmsare compared, using the following nomenclature:
Reuse 1 where all stations transmit at full power
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Soft Reuse which is a static power allocation described
in [16]
FFR which is the proposed dynamic algorithm
We choose = 2 since it implies maximizing the harmonicthroughput of BSs, which is a natural metric of capacity for
elastic traffic (see for example [17]) and gives good practical
results.
Because of the finite size of the network, we only calculatethe Key Performance Indicators (KPIs) on the subset of inner
BSs to minimize truncation effects, and the transient period
at the beginning of the simulation is not counted to calculate
KPIs. Simulation parameters are described in Table I.
Simulator parameters
Spatial resolution 25m 25mTotal simulated area 8km 8kmTime resolution 1sSimulation time 3000sUser speed 5km/hFile size 10MbytesNumber of sub-bands 3Number of PRBs 9Size of a PRB 180kHzNumber of stations 39Cell layout 13 eNBs 3 sectors 5% 2Maximum BS transmit power 30WService Type FTPScheduler Type Proportional FairThermal noise 174dBm/HzPath loss 128 + 37.6log10(d) dB, d in kmShadowing standard deviation 6dB
TABLE IMODEL PARAMETERS
B. Simulation results
All results are given for = 2, unless specified. Figures1, 2 and 3 compare the BCR, mean file transfer time and
mean network throughput respectively for the three scenarios,
and we can see a clear improvement for the three KPIs.
The most notable is the BCR improvement from 5.5% to2.3% in high traffic, demonstrating that the proposed algorithmeffectively reduces congestion in the network. Figure 4 shows
the cumulative distribution function (c.d.f) of the file transfer
time in the network for = 9, and we can see that all users
benefit from the reduced congestion, the ones benefitting themost being cell-edge users, namely users with long transfer
times. Figure 5 shows the power allocated to each band
through time by the algorithm. Figure 6 shows the BCR and
the proportion of users whose File Transfer Time (FTT) is
longer than 10s as a function of , for = 0. It illustrates thetrade-off between the FTT reduction and increase in BCR.
Is allows the network operator to set the parameter in
order to enforce some policy, for example to obtain the best
performance while keeping the BCR under a certain threshold.
9 9.5 10 10.5 11 11.5 120
1
2
3
4
5
6
Arrival Rate (mobiles/s)
BlockCa
llRate(%)
Reuse 1
Soft ReuseFFR
Fig. 1. BCR of the network, = 2
9 9.5 10 10.5 11 11.5 1210
12
14
16
18
20
22
Arrival Rate (mobiles/s)
Meantransfertime(s)
Reuse 1
Soft Reuse
FFR
Fig. 2. Mean FTT in the network, = 2
9 9.5 10 10.5 11 11.5 120.95
1
1.05
1.1
1.15
1.2
1.25x 10
5
Arrival Rate (mobiles/s)
Meannetwork
throughput(kbps)
Reuse 1Soft ReuseFFR
Fig. 3. Mean network throughput, = 2
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0 20 40 60 80 1000
0.1
0.2
0.3
0.4
0.5
0.6
0.7
0.8
0.9
1
Time (s)
Filetransfertimec.d.f
Reuse 1
Soft Reuse
FFR
Fig. 4. c.d.f of FTT of all users in the network, = 2
0 200 400 600 800 1000
0
0.5
1
1.5
2
2.5
3
3.5
4
Time (s)
BSpower(W)
Band 1
Band 2Band 3
Fig. 5. Transmit power of a BS, = 2
10 20 30 40 50 60 70 80 90 1000
5
10
15
20
25
30
35
40
45
Gamma(%)
BCR
andFTT(%)
BCR
FTT > 10
target BCR
Fig. 6. Trade-off between FTT and BCR for = 0
V. CONCLUSION
This work has presented a distributed SON algorithm for
interference coordination in OFDMA networks. The algorithm
uses information available from neighboring cells and closed
form formulas, making it both computationally light and
suitable for practical implementation. It has been applied
to a large-scale network simulator, showing important gains
over a full power allocation, for cell-edge users, while notdegrading other KPIs. The trade-off between gains for cell-
edge users and increase in the BCR has been shown, and a
straightforward method for the network operator to manage it
has been provided.
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