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Utilitybased resource allocation in highspeed railway wireless networks
EURASIP Journal on Wireless Communications and Networking volumeÂ 2014, ArticleÂ number:Â 68 (2014)
Abstract
In this paper, we investigate the utilitybased resource allocation problem at a base station in highspeed railway (HSR) wireless networks, jointly taking into account the power allocation along the time and the packet allocation among services. The problem to maximize the total utility under the average power constraint is formulated as a mixedinteger nonlinear programming (MINLP) problem. Through the integer constraint relaxation, the MINLP problem can be simplified into a convex optimization problem. The detailed analysis reveals that the relaxed problem can be equivalently decomposed into power allocation problem along the time and packet allocation problem among services, which can reduce the problem size. When the optimality of the relaxed problem is achieved, the power allocation along the time and the packet allocation along the time for each service are both proportionally fair. Since the integer relaxation causes a noninteger solution not implementable in practice, a greedy algorithm is proposed to obtain a nearoptimal integer solution of the MINLP problem. Finally, the performance of the proposed algorithm is analyzed by simulations under realistic conditions for HSR wireless networks.
1 Introduction
In recent years, highspeed trains are being deployed rapidly all over the world, serving as a fast, convenient and green public transportation system. The passengers on the train have an increasingly high demand on multimedia services. Meanwhile, more and more data related with the railway controlling information needs to be transmitted between the train and the ground in order to guarantee that the train is moving safely. However, the dominant wireless communication system, GSM for railway (GSMR), is specifically designed for train control rather than passenger communications and can only support a maximum data rate of 200 kbps [1]. Therefore, it is crucial to investigate the new network architectures and transmission technologies to satisfy the needs of highspeed railway (HSR) wireless communication.
On one hand, some broadband wireless communication systems for HSR have been developed, and a review of network architectures has been presented in [2]. The relayassisted HSR network architecture proposed in [1] and [3] becomes a promising architecture for future HSR wireless communication [4] and was considered to be a better choice than direct transmission in case of large penetration loss [5]. On the other hand, there have been some recent works to improve the transmission performance in HSR wireless networks. The radiooverfiber (ROF) technology for HSR wireless networks was proposed in [6], which can reduce the number of handoffs and increase throughput effectively. Multiinput multioutput (MIMO) technology was introduced in order to improve the throughput performance of the HSR wireless networks [7]. However, further investigation is needed to improve the system performance when considering the multimedia service transmission in HSR wireless networks.
The broadband wireless communications for HSR should have the function of transmitting multimedia services and enable a variety of applications such as entertainment and safety. There are many types of HSR services with different rate requirements and priorities [8]. In particular, the HSR services are classified into four main categories [9], i.e., pure passenger internet, passenger comfort services, securityrelated applications, and costsaving applications. The provisioning of wireless data services in a moving train is a technologically demanding challenge due to the fastvarying wireless channel and heterogeneous service requirements. Since the network resources are limited in HSR wireless networks, in order to take full advantage of them, the resource allocation to the heterogeneous services should be considered. In addition, the data transmission rate is highly determined by the transmit power and the distance between the base station and the train, which makes it feasible to implement power allocation along the time in HSR wireless networks [10]. Therefore, when transmitting multiple services from the base station to the moving train, it is necessary to consider not only the power allocation along the time but also the resource allocation among the services. To the best of our knowledge, the resource allocation problem in HSR wireless networks which can jointly consider resource allocation among services and power allocation along time is still an open problem.
In this paper, we investigate the utilitybased resource allocation problem at a base station in HSR wireless networks, jointly taking into account the power allocation along time and the packet allocation among services. This optimization problem is formulated as a mixedinteger nonlinear programming (MINLP) problem with the objective to maximize the total utility at a base station under the average power constraint. The MINLP problem is in general nondeterministic polynomialtime (NP)hard [11], so the integer constraint relaxation is adopted to obtain some engineering insights to solve it effectively. Since the size of the relaxed problem is also large, to further reduce the computational complexity, we develop theoretical insights from the nature of optimal solutions and carry out the problem transformation. It is shown that the relaxed problem can be equivalently decomposed into two subproblems, i.e., power allocation problem along time and packet allocation problem among services. The former can be solved by bisection search method with low complexity and then the closedform solution of the latter can be computed by the obtained power allocation. Moreover, the optimal solution of the relaxed problem can achieve not only the proportional fair power allocation along time but also the proportional fair packet allocation along the time for each service. Since the integer relaxation causes a noninteger solution not implementable in practice, a greedy algorithm is proposed to obtain a nearoptimal integer solution of the MINLP problem. Finally, we present the analysis of the proposed algorithm performance by simulations under realistic conditions for HSR wireless networks.
The rest of the paper is organized as follows. In Section 2, we review previous works in the literature which are the most relevant to our work. Section 3 describes the system model. The problem formulation is provided in Section 4. The problem transformation and a bisection search method are presented in Section 5. In Section 6, a greedy algorithm is proposed to obtain the integer solution. Some numerical results and discussions are shown in Section 7. Finally, conclusions are drawn in Section 8.
2 Related work
Resource allocation, as a critical part of radio resource management, plays an important role in improving the throughput and ensuring service fairness in HSR wireless networks. Among the works related to resource allocation in HSR wireless networks, [12] proposed a scheduling and resource allocation mechanism in HSR networks with a cell array architecture, which can maximize the service rate based on periodical signal quality changes. Considering the intermittent network connectivity in a cellular/infostation integrated HSR network, [13] and [14] investigated the resource allocation problem for transmitting multiple services from the ground to the train. Different algorithms were proposed since they involved different optimization objectives, while the transmit power was assumed to be constant along time. In a relayassisted HSR network, [15] studied delayaware fair resource allocation problem with heterogeneous packet arrivals and delay requirements for the HSR services. However, the above works did not make full use of three unique features of HSR wireless networks [16], i.e., the deterministic moving direction, relatively steady moving speed, and the accurate train location information.
The data transmission rate is highly determined by the transmit power and the distance between the base station and the train; thus, the power allocation along the time has a large influence on transmission performance in HSR wireless networks. Four power allocation schemes were presented in [10] for different design objectives. Among these schemes, to achieve a tradeoff between the power efficiency and the fairness along the time, a proportional fair power allocation scheme was proposed and its Îµoptimal solution was presented. However, the schemes proposed in [10] do not consider crosslayer design. The forecast channels in the HSR scenario were exploited in [17] to minimize the total transmit power along the time under the packet deadline constraint, while only one type of service was considered. Under the average power constraint in HSR wireless network, [18] investigated a joint admission control and resource allocation problem, which aims at maximizing the system utility while stabilizing all transmission queues.
An effective crosslayer resource allocation is necessary to improve the performance of wireless communication system. The crosslayer resource allocation problem was formulated as a utilitybased resource allocation problem in [19], where the utility function is used to define the relationship between resource allocated to application and the satisfaction brought by this application. With the help of the utility function, we present a utilitybased resource allocation framework in HSR wireless networks, which can jointly consider the power allocation along the time and packet allocation among services.
3 System model
In this paper, a twohop HSR wireless network architecture is considered, as shown in Figure 1. The base station (BS) deployed along the rail line is connected to the backbone network via a wireline link. The relay station (RS) with powerful antennas installed on the top of the train is used for communicating with the BS. The RS is further connected to the access point (AP) which can be accessed by the users inside the train. Thus, there is a twohop wireless link, consisting of the BSRS link and the APusers link, which has several advantages. Firstly, it is the RS not each user to implement the handover procedure, which can achieve better handover performance and reduce the dropoff rate significantly [4]. Secondly, with this twohop wireless link, signals do not penetrate into the carriage; thus, the large penetration loss can be dramatically reduced [1]. Finally, since the users are nearly stationary with respect to the AP, the APusers link can provide a stable and highspeed wireless data transmission [13].
We consider the downlink data transmission in this twohop architecture. The APusers link inside the carriage can provide a large data transmission rate by using wireless local area network (WLAN) technologies, while the BSRS link suffers from the fastvarying wireless channel and may become the bottleneck in this architecture. Therefore, the transmission in the BSRS link will be mainly considered in this paper with the assumption for the downlink data always being successfully received when delivered to RS.
3.1 Timedistance mapping
We consider a train that travels at a constant speed v through a single cell with radius R. The total time the train spends is T_{all}=2R/v, which is divided into slots of equal duration T_{ s }. Then, the total number of slots is given by T=T_{all}/T_{ s }, where we assume that T_{all} can be exactly divided by T_{ s } and T is even. Without loss of generality, we assume that the train goes into and out of the cell coverage at slot 0 and slot T, respectively. The traveled distance until slot t is given by s(t)=v t T_{ s }. A timedistance mapping function d(t) is defined as the distance between the BS and RS at slot t[20], i.e., d(t): [ 0,T]â†’ [ d_{0},d_{max}], where {d}_{\text{max}}=\sqrt{{R}^{2}+{d}_{0}^{2}} and d_{0} is the distance between the BS and the rail line as shown in Figure 1. The mapping function d(t) can be expressed by
where we assume that the distance d(t) does not change within slot t since T_{ s } is very small. There are two inherent properties about the mapping function d(t): (i) the train is closest to the BS at slot \frac{T}{2}, i.e., d\left(\frac{T}{2}\right)={d}_{0}. (ii) For any slot tâˆˆ [ 0,T], we have d(t)=d(Tâˆ’t) due to the distance symmetry.
3.2 BSRS link capacity
In HSR wireless networks, the channel condition in BSRS link is fast varying due to the largescale fading and smallscale fading [21]. Confirmed by engineering measurements [22, 23], the lineofsight path in the BSRS link is available at most time, and the effect of largescale fading is more obvious than that of smallscale fading. Therefore, we ignore the smallscale fading and assume that the channel condition variation results only from the fastvarying distance between the BS and RS. As shown in [10], power allocation along the travel time plays a key role in improving the performance of HSR wireless networks. We denote P(t) as the transmit power of the BS at slot t, which is limited by the average value P_{av}. The assumption of average power constraint is the same as that used in [10]. Given P(t) and d(t), the received signaltonoise ratio (SNR) by RS at slot t can be expressed by
where N(t)=W N_{0}d^{Î±}(t), W is the system bandwidth, N_{0} is the noise power spectral density, and Î± is the path loss exponent. The instantaneous transmission rate in the BSRS link at slot t is
For the communications in the BSRS link, we consider the frame structure proposed in [24] which is specifically designed for highspeed trains with a speed up to 360 km/h. Suppose that a packet is the fundamental unit of transmission with equal size L bits and the overhead of packetization can be ignored; hence, the link capacity C(t) at slot t can be denoted as the maximum number of packets [18], which can be expressed by
where \stackrel{~}{C}\left(t\right)=R\left(t\right){T}_{s}/L and \xe2\u0152\u0160x\xe2\u0152\u2039=max\{n\xe2\u02c6\u02c6\mathrm{\xe2\u201e\xa4}n\xe2\u2030\xa4x\}.
3.3 Utilitybased resource allocation
Assume that there are K types of elastic services with infinite packets to be transmitted from the BS to RS, and the service set is denoted by \mathcal{K}\xe2\u2030\u0153\{1,\xe2\u20ac\xa6,K\}. The elastic services, e.g., file transfer, electronic mail, and web surfing, can tolerate long delays. To allocate the network resources based on the type of elastic services, utilitybased resource allocation can be employed [19]. Figure 2 gives an example of the relationship between utility and data rate for three different types of services. For any service, the utility grows as the allocated data rate increases. On one hand, equal data rate allocation does not provide equal utility, which is interpreted as equal service satisfaction. On the other hand, to achieve equal utility, the different data rates should be allocated to the services according to their types, which results in utilizing the network resources more efficiently [25]. Thus, we consider utilitybased resource allocation instead of ratebased resource allocation in this paper.
Suppose, in general, that service k maintains an increasing and concave function U_{ k }(Î½_{ k }) as its utility function, which indicates a serviceâ€™s degree of satisfaction on the allocated Î½_{ k } packets. Instead of maximizing network throughput performance, our objective is to maximize the overall network utility, which is the summation of all servicesâ€™ utility functions. From [26] and [27], the utility function for service k can be defined as
where Î± is a parameter dictating the shape of the utility function, and Ï‰_{ k } represents the weight of service k. When the weights of all services are the same, e.g., Ï‰_{ k }=1, the optimization objective can be specialized into the following four cases according to different values of Î±:

(i)
throughput maximization, U _{ k }(Î½ _{ k })=Î½ _{ k } when Î±=0;

(ii)
proportional fairness, U _{ k }(Î½ _{ k })= ln(Î½ _{ k }) when Î±=1;

(iii)
(1,Î±) proportional fairness, {U}_{k}\left({\mathrm{\xce\xbd}}_{k}\right)=\frac{{\mathrm{\xce\xbd}}_{k}^{1\xe2\u02c6\u2019\mathrm{\xce\pm}}}{1\xe2\u02c6\u2019\mathrm{\xce\pm}} when Î±âˆˆ(0,1)âˆª(1,âˆž);

(iv)
maxmin fairness, {U}_{k}\left({\mathrm{\xce\xbd}}_{k}\right)=\underset{\mathrm{\xce\pm}\xe2\u2020\u2019\mathrm{\xe2\u02c6\u017e}}{lim}\frac{{\mathrm{\xce\xbd}}_{k}^{1\xe2\u02c6\u2019\mathrm{\xce\pm}}}{1\xe2\u02c6\u2019\mathrm{\xce\pm}} when Î±â†’âˆž.
Similar to [28], we choose U_{ k }(Î½_{ k })=Ï‰_{ k } ln(Î½_{ k }) to obtain weighted proportionally fair resource allocation, where Ï‰_{ k } is assumed to be an integer for k\xe2\u02c6\u02c6\mathcal{K} in this paper.
4 Problem formulation
In this section, we develop a mathematical formulation of the optimal resource allocation problem in HSR wireless networks. Let Î½(t)= [ Î½_{1}(t),â€¦,Î½_{ K }(t)]^{T} represent the packet allocation vector at slot t, where Î½_{ k }(t) denotes the number of packets allocated to service k at slot t. The optimization problem consists in maximizing the BS utility to find the optimal power allocation along the time and the optimal packet allocation among the services, and two necessary constraints are added: (i) The BS has an average power constraint along the time. (ii) The total number of allocated packets is no more than the link capacity at any slot. Thus, the utilitybased resource allocation optimization problem is formulated as
Problem P1 is a MINLP problem, including T+1 continuous variables P(t) and K(T+1) integer variables Î½_{ k }(t), which is in general NPhard [11]. The main difficulty of analyzing problem P1 comes from the integer nature of Î½_{ k }(t). To significantly improve the computational efficiency and obtain some engineering insights for solving the MINLP problem, we adopt integer constraint relaxation for problem P1, where {\mathrm{\xce\xbc}}_{k}\left(t\right)\xe2\u02c6\u02c6{\mathrm{\xe2\u201e\u0161}}^{+} substitutes the constraint {\mathrm{\xce\xbd}}_{k}\left(t\right)\xe2\u02c6\u02c6\mathrm{\xe2\u201e\u2022} and \stackrel{~}{C}\left(t\right) substitutes C(t).
As a result, problem P1 is simplified into a relaxed problem P2 as follows:
Notice that the optimal solution of problem P2 provides an upper bound to that of problem P1 since the constraints in problem P2 are looser than those in problem P1. There are totally (K+1)(T+1) continuous variables in problem P2, where T is typically of the order of 10^{4} to 10^{5}. Standard convex optimization tools such as CVX [29] can be employed to solve P2; however, the computational complexity is very high due to the large size of the problem [30]. In order to obtain a lowcomplexity and effective algorithm for problem P2, we carry out the problem transformation in Section 5. Before we present the solution for problem P2, we consider the problem decomposition to determine some characteristics which will be useful in understanding the structure of problem P2 better.
By decoupling of the optimization variables in constraint (7c), problem P2 can be decomposed into two subproblems: (i) power allocation along the time (PAT): how to implement power allocation along the time under the average power constraint at the BS. (ii) Packet allocation among services (PAS): how to allocate resources to multiple services at each slot by the given power allocation. Next, we will discuss these two subproblems separately.
4.1 PAT Problem
In this subsection, we investigate the power allocation problem along the time under the average power constraint at the BS. Since the channel state in BSRS link is timevarying, to achieve different optimization objectives, four power allocation schemes have been proposed in [10].
4.1.1 Constant power allocation
The most straightforward scheme is the constant power allocation, where BS maintains a constant transmit power at all times, i.e., P(t)=P_{av}. Thus,
4.1.2 Channel inversion power allocation
It tries to maintain a constant link capacity \stackrel{~}{C}\left(t\right) at the BS all the time. Therefore, based on (3) and (4), the ratio of P(t) to N(t) is a constant for all slots. Without loss of generality, we suppose that P(t)=k_{0}N(t). And then by solving \underset{t=0}{\overset{T}{\xe2\u02c6\u2018}}P\left(t\right)=(T+1){P}_{\text{av}}, we have {k}_{0}=\frac{(T+1){P}_{\text{av}}}{\underset{t=0}{\overset{T}{\xe2\u02c6\u2018}}N\left(t\right)} and
4.1.3 Waterfilling power allocation
To maximize the total link capacity at the BS, we formulate the following optimization problem:
whose solution can be obtained by a waterfilling scheme [10].
4.1.4 Proportional fair power allocation
To achieve a tradeoff between the total link capacity and the fairness along the time, a proportional fair power allocation optimization problem is formulated as
whose Îµoptimal solution can be obtained by the proposed algorithm in [10].
4.2 PAS problem
In this subsection, the packet allocation problem among the services is studied under the link capacity constraint by fixing the power allocation at all slots, which can be obtained according to the power allocation schemes in the above subsection. This setup is less complicated compared to our more general model, and its solution can provide us with some insights for solving problem P2.
Given the fixed power allocation P(t) at any slot t, the link capacity \stackrel{~}{C}\left(t\right) can be computed by (4). Problem P2 can be divided into T+1 packet allocation problems, and the problem at any slot tâˆˆ [ 0,T] can be given by
which is a convex optimization problem. By applying the KarushKuhnTucker (KKT) conditions, we obtain the closedform optimal solution of (12) and an important structural characteristic in the following lemma.
Lemma 1. For the optimal solution vector{\mathit{\xce\xbc}}^{\xe2\u02c6\u2014}\left(t\right)=\phantom{\rule{0.3em}{0ex}}{\left[\phantom{\rule{0.3em}{0ex}}{\mathrm{\xce\xbc}}_{1}^{\xe2\u02c6\u2014}\right(t),{\mathrm{\xce\xbc}}_{2}^{\xe2\u02c6\u2014}(t),\xe2\u20ac\xa6,{\mathrm{\xce\xbc}}_{K}^{\xe2\u02c6\u2014}(t\left)\right]}^{T}at any slot tâˆˆ [ 0,T], there must be the case that
and the closedform optimal solution of (12) is
Proof. The proof of Lemma 1 is provided in Appendix 1.
Based on (13) in Lemma 1, there is an inherent relationship among the optimal solutions at any slot. More resources are allocated to the service with a larger weight. In particular, for any service k, the allocated resource {\mathrm{\xce\xbc}}_{k}^{\xe2\u02c6\u2014}\left(t\right) at slot t is proportional to its weight Ï‰_{ k }. Notice that the service weights are assumed to be integer so as to simplify the analysis in the sequel, since the optimal solutions depend on the relative size rather than on the absolute size of the weights. If the service weights are noninteger, the corresponding integer weights can be obtained after being multiplied by the same factor. For simplicity of expression in the sequel, we introduce a virtual variable at any slot tâˆˆ [ 0,T], which is given by
From (15), we can see that x(t) is only determined by the power allocation P(t) at any slot t. By plugging (15) into (14), the optimal solution of (12) can be rewritten by
Thus, if the optimal power allocation solution in problem P2 can be obtained, then the optimal x^{âˆ—}(t) and the optimal packet allocation solution in problem P2 can be calculated by (15) and (16), respectively.
5 Problem transformation
In this section, to reduce the computational complexity, we consider the problem transformation for problem P2, where the number of the optimization variables dramatically decreases from (K+1)(T+1) to \frac{T}{2}+1. Based on the bisection search method, a greedy algorithm with low complexity is proposed for solving problem P2.
Firstly, since Lemma 1 provides the necessary condition for the optimal solutions of (12) and problem P2, based on (16), the resource allocation variables Î¼_{ k }(t) at slot t can be substituted by one single variable x(t). Then, the objective function of problem P2 can be simplified into
where \mathrm{\xce\pm}=(T+1)\underset{k}{\xe2\u02c6\u2018}\left({\mathrm{\xcf\u2030}}_{k}(ln({\mathrm{\xcf\u2030}}_{k}\left)\right)\right) and \mathrm{\xce\xb3}=\underset{k}{\xe2\u02c6\u2018}{\mathrm{\xcf\u2030}}_{k} are both constant. Similarly, for the constraint (7c), \underset{k}{\xe2\u02c6\u2018}{\mathrm{\xce\xbc}}_{k}\left(t\right)=\mathrm{\xce\xb3x}\left(t\right). Thus, problem P2 can be transformed into
Lemma 2. Suppose that the optimal solution of problem P3 exists, the optimal solution provides proportionally fair resource allocation along the time for each service.
Proof. The proof of Lemma 2 is provided in Appendix 2.
After the problem transformation, the total number of variables decreases from (K+1)(T+1) to 2(T+1), and hence, the computational complexity is dramatically reduced when K is large. Based on the investigation on problem P3, the total number of variables can be further reduced to T+1 as shown below.
It is easy to show that at the optimality of problem P3, the constraints (18b) and (18c) are both tight; otherwise, one can increase the value of x(t) and P(t), such that the objective function can be further maximized. Thus, we have
and
Based on (20), there exits a onetoone correspondence established between x(t) and P(t), which is expressed by
where \mathrm{\xce\xb7}=\frac{{T}_{s}W}{\mathrm{\xce\xb3L}ln2}.
Thus, plugging (19) and (21) into problem P3 yields
Lemma 3. The optimal solution of problem P4 is the same as that of the proportional fair power allocation (PFPA) problem.
Proof. The proof of Lemma 3 is provided in Appendix 3.
Based on Lemma 3, the optimal solution of problem P4 provides proportionally fair power allocation along the time. Furthermore, we can observe that problem P2 can be equivalently decomposed into two subproblems: problem P4 and PAS problem, which are corresponding to power allocation problem along the time and packet allocation problem among the services, respectively. The explanation of the equivalence problem is given as follows. On the one hand, problem P2 can be decomposed into T+1 PAS problems for the given power allocation along the time. Based on the Lemma 1, if the optimal power allocation P^{âˆ—}(t) is given, the optimal packet allocation {\mathrm{\xce\xbc}}_{k}^{\xe2\u02c6\u2014}\left(t\right) of problem P2 can be obtained by solving the PAS problems. On the other hand, based on (15) and (16), the virtual variable x(t) builds a bridge between Î¼_{ k }(t) and P(t). By variable substitution, problem P2 can be equivalently transformed into problem P3, which is further simplified into problem P4 based on the necessary optimality conditions. These equivalent transforms can guarantee that the optimal power allocation P^{âˆ—}(t) of problem P4 is the same as that of problem P2 at any slot t. Based on the above two points, we can conclude that problem P2 can be equivalently decomposed into problem P4 and PAS problem. Thus, in order to obtain the optimal solutions of problem P2, we can solve problem P4 at first, and then by using the power allocation results, the packet allocation solution can be obtained by using (16) and (21).
To solve problem P4 effectively, the following lemma allows us to further reduce the computational complexity based on the distance symmetry at the base station, which has been mentioned in Section 3.1.
Lemma 4. In the optimal solution vector P^{âˆ—}= [ P^{âˆ—}(0),â€¦,P^{âˆ—}(T)], there exists a symmetry on the optimal solution, i.e., P^{âˆ—}(t)=P^{âˆ—}(Tâˆ’t),âˆ€tâˆˆ [ 0,T].
Proof. The proof of Lemma 4is provided in Appendix 4.
As a consequence of Lemma 4, problem P4 can be simplified into the power allocation problem from slot 0 to slot \frac{T}{2}, which is labeled as P5.
where g\left(P\right(t\left)\right)=ln\left(\mathrm{\xce\xb7}ln\left(1+\frac{P\left(t\right)}{N\left(t\right)}\right)\right) and the total number of variables decrease nearly half from T+1 to \frac{T}{2}+1.
Problem P5 is a convex optimization problem, which can be solved by CVX [29]. In addition, since problem P5 has a similar structure to the PFPA problem, the proposed algorithm in [10] can be used to find the Îµoptimal solution of problem P5. However, the Lambert W function was introduced in the proposed algorithm, resulting in the high computing time. In this paper, the bisection search method is employed to reduce the computing time of searching the optimal solution.
Specifically, using the standard optimization technique, the corresponding Lagrangian function is obtained as
Based on the KKT conditions, we have
which can be rewritten by
Let f\left(P\right(t\left)\right)=ln\left(1+\frac{P\left(t\right)}{N\left(t\right)}\right)\left(P\left(t\right)+N\left(t\right)\right), which is a monotonically increasing function of P(t) at any slot t. Let \mathrm{\xce\xb2}=\frac{1}{\mathrm{\xce\xbb}}, then (26) is equal to f(P(t))=Î². Due to the monotonicity of f(P(t)), the bisection search method can be used to find P(t), satisfying f(P(t))=Î² for a given Î² at each slot t. In addition, for any slot t, P(t)=f^{âˆ’1}(Î²) is also a monotonically increasing function of Î². Thus, to satisfy the average power constraint (23b), the bisection search method can also be used to find the optimal Î²^{âˆ—}.
The specific steps of the bisection search method is provided in Algorithm 1. The search regions of P(t) and Î² should be initialized based on their maximums and minimums. At first, it is easy to verify that the maximum and minimum of P(t) at each slot t can be set as {P}_{\text{max}}=\left(\frac{T}{2}+1\right){P}_{\text{av}} and P_{min}=0, respectively. And then the maximum and minimum of Î² can be obtained by the following lemma:
Lemma 5. Based on the equality f(P(t))=Î², the maximum of Î² can be obtained when P(t)=P_{max}and t=0 in function f(P(t)), i.e., Î²_{max}=f(P_{max})_{t=0}and the minimum of Î² can be set as Î²_{min}=0.
Proof. The proof of Lemma 5 is provided in Appendix 5.
The Algorithm 1 consists of two loops to find the optimal power allocation. The outer loop is used for the bisection search of Î², and the inner loop is used to solve f(P(t))=Î² for a given Î². In addition, the convergence of Algorithm 1 is ensured by the bisection search, where Îµ_{ Î” P } and Îµ_{ Î” Î² } are small constants to control the convergence accuracy.
Algorithm 1 Bisection search method
6 The greedy algorithm
In the above section, we obtain the power allocation results using Algorithm 1, and then the solution of virtual variable x^{âˆ—}(t) for any slot t can be computed by using (21). Since the solution x^{âˆ—}(t) is continuous, based on (16), it can not ensure that the packet allocation solution {\mathrm{\xce\xbc}}_{k}^{\xe2\u02c6\u2014}\left(t\right) is an integer for any service k and slot t. As a result, the solution {\mathrm{\xce\xbc}}_{k}^{\xe2\u02c6\u2014}\left(t\right) is not valid for practical purposes since the number of allocated packets must take integer value. As an alternative, an integer solution {\mathrm{\xce\xbd}}_{k}^{\xe2\u02c6\u2014}\left(t\right) in problem P1 can be obtained if the noninteger solution {\mathrm{\xce\xbc}}_{k}^{\xe2\u02c6\u2014}\left(t\right) is rounded to the nearest integer, but there is no guarantee about satisfying the problem constraints in problem P1.
According to the above analysis, if x^{âˆ—}(t) is an integer, then the integer solution of problem P1 can be obtained by (16). Based on this idea, we propose a greedy algorithm to find the integer solution of the virtual variable x(t) for any slot t, which is denoted as y^{âˆ—}(t), and y(t) is an integer variable corresponding to x(t). Since x^{âˆ—}(t) and y^{âˆ—}(t) largely coincide, the noninteger solution x^{âˆ—}(t) can be used to obtain the integer solution y^{âˆ—}(t). Then, substituting y(t) for x(t) in (21), the power allocation solution can be computed by
Since (27) establishes a onetoone mapping between y(t) and P(t), the average power constraint should be considered when finding the integer solution y^{âˆ—}(t). In particular, the proposed greedy algorithm

(i)
provides a valid integer solution y ^{âˆ—}(t), derived from the noninteger solution x ^{âˆ—}(t) at any slot t;

(ii)
fulfills the average power constraint;

(iii)
achieves an objective value as close as possible to the maximum objective value in problem P5; and

(iv)
has low complexity.
Notice that simply rounding x^{âˆ—}(t) does not ensure to always satisfy (ii) and (iii).
The pseudocode of the greedy algorithm is provided in Algorithm 2 and its main steps are sketched as follows. In step 2, each noninteger solution x^{âˆ—}(t) is rounded to its floor integer y(t) by the floor integer function âŒŠÂ·âŒ‹, and then the corresponding power allocation P(t) is calculated based on (27) in step 3. This may cause that the total power is underutilized and the maximum objective value is not achieved. Thus, the remaining power will be allocated along the time to increase the objective function value in the following steps. In step 4, y(t) is assumed to be added one for any slot t, and then the increased power Î” P(t) and increased objective function value Î” g(t) are calculated in step 5 and step 6, respectively. The allocation process from step 8 to step 16 is repeated to add one to the selected y(t) at each process until the set {\mathcal{T}}_{A} is empty. {\mathcal{T}}_{A} in step 9 represents the set of active slots at which y(t) can possibly be added one under the average power constraint, given by
In step 10, the slot t^{â€²} in set {\mathcal{T}}_{A} which can achieve the maximal ratio of Î” g(t) to Î” P(t) is selected, which implies that the increase of objective function value per power is maximal at slot t^{â€²}. Then, only y(t^{â€²}) can be added one and the corresponding power consumption P(t^{â€²}) can be assigned in step 11 and step 12, respectively. Next, Î” P(t^{â€²}) and Î” g(t^{â€²}) can be updated from step 13 to step 15. Finally, the integer solution y^{âˆ—}(t) and the power allocation solution P^{âˆ—}(t) can be obtained in step 18.
According to Algorithm 2, y^{âˆ—}(t) and P^{âˆ—}(t) at slot t\xe2\u02c6\u02c6\phantom{\rule{0.3em}{0ex}}[\phantom{\rule{0.3em}{0ex}}0,\frac{T}{2}] have been obtained. Based on Lemma 4and (27), y^{âˆ—}(t) and P^{âˆ—}(t) at slot tâˆˆ [ 0,T] can be calculated. And then substituting y^{âˆ—}(t) for x^{âˆ—}(t) in (16), we can obtain the packet allocation solution for any service k\xe2\u02c6\u02c6\mathcal{K} at slot tâˆˆ [ 0,T]. Furthermore, the greedy algorithm with low complexity leads to a near optimal rather than an optimal solution of problem P5, which implies that the obtained integer packet allocation solution and power allocation solution of problem P1 are both near optimal.
Algorithm 2 The greedy algorithm
7 Numerical results and discussions
In this section, we implement the proposed algorithm using MATLAB (The MathWorks, Inc., Natick, MA, USA) and present simulation results to illustrate its performance. In order to emphasize different service weights, without loss of generality, we set the integer weight value Ï‰_{ k }=k for any k\xe2\u02c6\u02c6\mathcal{K}. In addition, we summarize the simulation parameters in Table 1. A single simulation runs the algorithm when the train moves from the edge to the center of the BS coverage (25,000 slots).
The power allocation and link capacity along the time for the four power allocation schemes are presented in Figures 3 and 4, respectively. The advantage and disadvantage of these schemes can be observed from these two figures. For the sake of convenience in the engineering implementation, a constant power is allocated along the time in constant power allocation (CPA) scheme while it ignores the variation of channel gain and results in the great unfairness in term of link capacity. In order to provide a stable link capacity and achieve the best fairness along the time, the channel inversion power allocation (CIPA) scheme spends much power to compensate those bad channel states when the train is far from the BS. Similar to the traditional waterfilling method, the waterfilling power allocation (WFPA) scheme can maximum the total link capacity at the BS, whereas all the services will generally suffer from starvation when the train is near the edge of the BS coverage. In addition, the PFPA scheme can achieve a tradeoff between the total link capacity and the link capacity fairness along the time. Finally, from Figure 3, we can observe that the power allocation solutions of PFPA problem and problem P4 are the same, which verifies Lemma 3 by simulations.
Figure 5 presents a comparison of the optimal packet solution {\mathrm{\xce\xbc}}_{4}^{\xe2\u02c6\u2014}\left(t\right) of problem P2 with the solution obtained by the other schemes. It can be observed that the trend of the curves in Figure 5 is similar to that in Figure 4. This can be explained by (14), which shows that the packet allocation solution {\mathrm{\xce\xbc}}_{4}^{\xe2\u02c6\u2014}\left(t\right) is linear with respect to the link capacity \stackrel{~}{C}\left(t\right). Moreover, we can see that the optimal packet solution {\mathrm{\xce\xbc}}_{4}^{\xe2\u02c6\u2014}\left(t\right) of problem P2 is the same as the solution obtained by the PFPA+PAS scheme, which implies that problem P2 can be equivalently decomposed into PFPA problem and PAS problem. Service 4 is just an example for illustrating the characteristics of problem P2, and the same results can be obtained for the other services.
Figure 6 compares the power allocation solutions of three different methods solving problem P5 and their computational complexities, where the complexity is represented by the computing time in an Intel Core 3.30GHz computer (Santa Clara, CA, USA). In this figure, the power allocation solutions are plotted in a single simulation and the computing times are obtained by averaging 100 simulations. It can be observed that the power allocation solutions of these methods are almost the same, which implies that the optimal power allocation solution of problem P5 can be obtained by the bisection search method when Îµ_{ Î” P } and Îµ_{ Î” Î² } are arbitrarily small. In addition, it is worth noting that the computing time of the bisection search method is much lower than those of the other two methods, which illustrates the high effectiveness of Algorithm 1.
Figure 7 compares different power allocation solutions under the situations, where the solution of virtual variable x(t) is noninteger or integer. We can observe that the curve of the power allocation solution in problem P5 is smooth, which corresponds to the noninteger solution of x(t). For obtaining the integer solution of x(t), the noninteger solution x^{âˆ—}(t) is rounded to its floor integer, while the power allocation P(t) can be calculated in step 3 of Algorithm 2, which results in the underutilization of the total power as shown in this figure. As for the power allocation solution obtained by Algorithm 2, we can see that more power is allocated to some slots for better utilization of the total power. This causes that the curve of the power allocation solution obtained by Algorithm 2 is just around that of the power allocation solution in problem P5.
The packet allocation solutions of service 2 and service 4 are described in Figure 8, including the noninteger packet allocation solution of problem P2 and the integer packet allocation solution obtained by Algorithm 2. From this figure, we can see that more and more packets are allocated to each service when the train moves from the edge to the center of the BS coverage. Similar to the phenomenon presented in Figure 7, the curve of the integer solution is just around that of the noninteger solution for both two services. Similar results can be obtained for the other services. In addition, the number of packets allocated to service 4 equals twice the number of packets allocated to service 2, which can be explained by Lemma 1.
8 Conclusion
In this paper, we investigated the utilitybased resource allocation problem at a base station in HSR wireless networks, jointly taking into account the power allocation along time and the packet allocation among services. To maximize the total utility at a base station under the average power constraint, the resource allocation optimization problem was formulated as an MINLP problem. With the help of integer constraint relaxation, the MINLP problem was simplified into a convex optimization problem. However, the size of the relaxed problem is very large, which motivates us to carry out the problem transformation and find some structural characteristics of the problem. The detailed analysis has been performed, which revealed that the relaxed problem can be equivalently decomposed into power allocation problem along time and packet allocation problem among the services. When the optimality of the relaxed problem is achieved, the power allocation along the time and the packet allocation along the time for each service are both proportionally fair. In addition, the integer relaxation provides a noninteger solution not implementable in practice, which motivates us to propose a greedy algorithm to obtain a nearoptimal integer solution of the MINLP problem. Finally, the simulation results coincide with the structural characteristics we have shown in this paper.
Notice that only singlecell resource allocation problem is considered in this paper. The singlecell resource allocation can be regarded as a special case of the resource allocation in the entire trip. The singlecell resource allocation method can be extended to the multicell resource allocation problem in HSR wireless networks.
Appendices
Appendix 1
Proof of Lemma 1
Introduce a dual variable Î»â‰¥0 for the constraint (12b). The Lagrangian function of the optimization problem (12) is
The dual function g(Î») can now be stated as
From the solution of (30), the resource allocation vector Î¼ can be determined by solving K decomposed problems with an explicit solution {\mathrm{\xce\xbc}}_{k}=\frac{{\mathrm{\xcf\u2030}}_{k}}{\mathrm{\xce\xbb}}. The dual problem of (12) can be expressed as
whose optimal solution is {\mathrm{\xce\xbb}}^{\xe2\u02c6\u2014}=\frac{\underset{k}{\xe2\u02c6\u2018}{\mathrm{\xcf\u2030}}_{k}}{\stackrel{~}{C}}. Since the problem (12) is convex and satisfies Slaterâ€™s condition, strong duality holds between (12) and its dual problem (31). Based on [30], the solution of (12) can be obtained by the solution of (31) and is given by
In addition, we can obtain that
This completes the proof of Lemma 1.
Appendix 2
Proof of Lemma 2
Based on Definition 3 in [10], an optimal solution vector x^{âˆ—}= [ x^{âˆ—}(1),â€¦,x^{âˆ—}(T)]^{T} is said to be proportionally fair along the time if and only if, for any feasible solution vector x^{â€²}= [ x^{â€²}(1),â€¦,x^{â€²}(T)]^{T}, we have
Firstly, we will prove that the solution of problem P3 satisfies (34) for any feasible vector x^{â€²}. For the ease of exposition, let U(x) denote the objective function (18a) in problem P3. Since the strictly concave increasing property of U(x), the following condition holds at x=x^{âˆ—}[31]
This is can be explained by the fact that movement along any direction (xâˆ’x^{âˆ—}) at the optimal vector x^{âˆ—} can not improve the objective function. Thus, the optimal solution vector x^{âˆ—} is proportionally fair.
Secondly, due to Î¼_{ k }(t)=Ï‰_{ k }x(t) in (16), for any service k, we have
where {\mathrm{\xce\xbc}}_{k}^{\xe2\u20ac\xb2}\left(t\right) is the feasible solution corresponding to x^{â€²}(t) and {\mathrm{\xce\xbc}}_{k}^{\xe2\u02c6\u2014}\left(t\right) is the optimal solution corresponding to x^{âˆ—}(t). Thus, the optimal solution of problem P3 provides proportionally fair resource allocation along the time for each service.
Appendix 3
Proof of Lemma 3
First, substituting \stackrel{~}{C}\left(t\right) into PFPA problem yields
where \mathrm{\xce\xbe}=\frac{{T}_{s}W}{Lln2}. For the constraint (37b), when the optimal solution is achieved, the equality holds. In this sense, the constraint in problem P4 and PFPA problem is same. To compare these two problems, the only difference is that Î· is in problem P4 and Î¾ is in the PFPA problem. Thus, if we can prove that the optimal solutions of these two problems are independent of Î· and Î¾, respectively, then the optimal solution of problem P4 is equivalent to that of the PFPA problem.
Consider the Lagrangian function of PFPA problem
Since the PFPA problem is convex, by applying the KKT conditions, we have
and
Thus, the optimal solution of PFPA problem can be obtained by solving (40) and (41), which is independent of Î·. Similarly, we can show that the optimal solution of problem P4 is independent of Î¾. Therefore, the optimal solution of problem P4 is the same as that of the PFPA problem, which completes the proof.
Appendix 4
Proof of Lemma 4
We prove this lemma by contradiction. Without loss of generality, we assume that P^{âˆ—}(t_{1})â‰ P^{âˆ—}(Tâˆ’t_{1}) for certain t_{1}âˆˆ [ 0,T]. Construct another solution vector P^{â€²} by replacing the elements P^{âˆ—}(t_{1}), P^{âˆ—}(Tâˆ’t_{1}) in P^{âˆ—} with P^{â€²}(t_{1}), P^{â€²}(Tâˆ’t_{1}) and keeping all other elements unchanged, where {P}^{\xe2\u20ac\xb2}\left({t}_{1}\right)={P}^{\xe2\u20ac\xb2}(T\xe2\u02c6\u2019{t}_{1})=\frac{{P}^{\xe2\u02c6\u2014}\left({t}_{1}\right)+{P}^{\xe2\u02c6\u2014}(T\xe2\u02c6\u2019{t}_{1})}{2}. Notice that the following equality holds
which implies the solution vector P^{â€²} satisfies the constraint (22b) and P^{â€²} is a feasible solution vector.
For any tâˆˆ [ 0,T], since d(t)=d(Tâˆ’t) and N(t)=W N_{0}d^{Î±}(t), we have N(t)=N(Tâˆ’t). Since ln(ln(Â·)) is a concave function, based on Jensenâ€™s inequality, we can obtain
which illustrates the solution vector P^{âˆ—} is not optimal, which contradicts with the assumption. Therefore, for any tâˆˆ [ 0,T], there must be the case P^{âˆ—}(t)=P^{âˆ—}(Tâˆ’t) in the optimal solution vector P^{âˆ—}.
Appendix 5
Proof of Lemma 5
According to the equality f(P(t))=Î², we can find the maximum and minimum of function f(P(t)) among all slots instead of finding the maximum and minimum of Î² directly. Firstly, considering a certain slot t, N(t) is fixed and P(t)âˆˆ [ P_{min},P_{max}] is variable. Since f(P(t)) is a monotonically increasing function of P(t), the maximum and the minimum of function f(P(t)) can be achieved when P(t)=P_{max} and P(t)=P_{min}, respectively.
Secondly, to find the maximum and minimum of function f(P(t)) among all slots, it is necessary to consider different values of N(t) along the time. The derivative of f(P(t)) with respect to N(t) is given by
where the inequality holds based on ln(1+z)â‰¥z for zâ‰¥0. Thus, given a constant P(t) along the time, for any {t}_{1},{t}_{2}\xe2\u02c6\u02c6\phantom{\rule{0.3em}{0ex}}[\phantom{\rule{0.3em}{0ex}}0,\frac{T}{2}] and t_{1}>t_{2}, since N(t_{1})<N(t_{2}), we have f\left(P\right(t\left)\right){}_{t={t}_{1}}<f\left(P\right(t\left)\right){}_{t={t}_{2}}, which implies that the maximum and the minimum of function f(P(t)) can be achieved when t=0 and t=\frac{T}{2}, respectively.
From the above analysis, we conclude that the maximum of Î² can be set as Î²_{max}=f(P_{max})_{t=0}, and the minimum of Î² can be set as {\mathrm{\xce\xb2}}_{\text{min}}=f\left({P}_{\text{min}}\right){}_{t=\frac{T}{2}}=0.
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Acknowledgements
This work is supported by the Fundamental Research Funds for the Central Universities (Grant No. 2014YJS026), the Key Projects of State Key Lab of Rail Traffic Control and Safety (No. RCS2012ZZ004), the China Postdoctoral Science Foundation (Grant No. 2013M530519), and the Key Grant Project of Chinese Ministry of Education (No. 313006).
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Xu, S., Zhu, G., Shen, C. et al. Utilitybased resource allocation in highspeed railway wireless networks. J Wireless Com Network 2014, 68 (2014). https://doi.org/10.1186/16871499201468
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DOI: https://doi.org/10.1186/16871499201468