Research Article  Open Access
Mohammad Abu Hanif, Sina Vafi, "A Novel Scheme of Product Polar Codes with High Efficiency and Rate Compatibility", Wireless Communications and Mobile Computing, vol. 2020, Article ID 7573147, 13 pages, 2020. https://doi.org/10.1155/2020/7573147
A Novel Scheme of Product Polar Codes with High Efficiency and Rate Compatibility
Abstract
This paper presents a new structure of product codes formed by combining two polar codes. The encoding performance of these codes is verified by implementing an exhaustive search algorithm, which determines their minimum weight specifications. Conducted analysis and simulations confirm that with the equal code length and rate, the newly proposed codes outperform the conventional polar codes in high energy per bittonoise ratios ( dB). This is concluded from punctured and nonpunctured product codes.
1. Introduction
Polar codes are promising forward error correction (FEC) codes for the next generation of broadband networks including the fifth generation of wireless networks (5G). These codes are recognized as capacityachieving codes under a successive cancellation (SC) decoding technique, which were initially constructed for the symmetric binaryinput discrete memoryless channel (BIDMC) [1]. However, at a short code length, their bit error rate (BER) performance is not as reliable as other known codes, such as lowdensityparitycheck (LDPC) and turbo codes. This limits their reputation as a good code for a wide range of applications. In order to overcome this issue, short length codes are combined with other codes to form a scheme of highperformance concatenated codes [2].
A serially concatenated code was proposed based on an inner polar code and an outer ReedSolomon (RSpolar) code [3]. It is shown that the block error rate performance of the code is improved at the expense of increasing the length and complexity of the RS code. Eslami and PishroNik showed that a highperformance concatenated code can be formed by combining polar and LDPC codes [4]. In [5], Tal and Vardy considered concatenation of a polar code with an outer cyclic redundancy check (CRC) code. The CRC code together with the usage of a list decoding algorithm concludes a highperformance code formed by the short length polar code. An alternative scheme of these codes is achieved, when the CRC code is replaced by the paritycheck code [6]. In this case, paritycheck codes having low multiplicity in their minimum weight are selected [7].
On the other hand, construction of a parallel concatenated code formed by two polar codes was proposed in [8]. Based on the same code length and rate, the designed code outperforms the single one. More recent work demonstrates a parallel construction of multiple polar codes having different rates [9]. Constructed code has high performance at the expense of high complexity. Alternatively, a parallel concatenated code was presented by combining a polar code with a Recursive Systematic Convolutional (RSC) code [10]. Codes obtained by this method conclude a performance better than other wellknown codes (turbo codes and LDPC codes), mainly at the error floor region due to utilizing a modified interleaver, which is matched with specifications of the constituent RSC code.
The main similarity between the abovementioned codes is the serial combination of a polar code with a nonpolar code. On the other hand, a turbo product code is based on multiple polar codes (polarTPC) introduced in [11]. In this work, nonpunctured constituent polar codes are used to form a product code, where SCLChase decoding algorithm was proposed.
This paper presents a new scheme of serially concatenated codes constituted by two systematic polar codes linked by an interleaver. Codes are constructed on the basis of the message, whose length is the product of the length of constituent codes. This code can be also introduced as a polar code, as every bit of the codeword is properly polarized. Moreover, the puncturing structure of these codes will be verified. Unlike a punctured single polar code, which applies a relatively high number of punctured bits, punctured product polar codes can be constructed by removing a low number of bits applied in one of the constituent codes. This feature will allow decoders to interactively exchange their decoded information with each other and improve the error correcting capability of the code. Conducted simulations confirm that with the same rate and code length, punctured product polar codes have better performance than single punctured polar codes. In addition, it is analysed that the proposed code decoded with BP decoding has similar performance to codes decoded with the SCLChasebased algorithm.
The rest of the paper is organized as follows. A brief introduction of polar codes is given in Section 2. In Section 3, the structure of product polar codes and their comparison with single polar codes formed by the same rate and length are explained. Puncturing technique of the proposed code is presented in Section 4. Numerical results are given in Section 5. Finally, Section 6 concludes the paper.
2. Basic Structure of Polar Codes
Let and be the length and dimension of a polar code, respectively. The rate of this code is . Let be the generator matrix of the polar code with rate one and length , where denotes the th Kronecker power and as in [1]. It is shown that as approaches to infinity, under successive cancellation (SC) decoding, a fraction of rows of leads to good channels suitable for carrying messages with length . Other channels are referred to as bad channels. In order to measure how good a binaryinput channel is, Arikan used the Bhattacharyya parameter of , which is defined as [1] where is the channel transitional probability of input alphabet and output alphabet . For binary erasure channel (BEC) with , the reliability of bit channels can be recursively determined by [1] where , , is the Bhattacharyya parameter of channel . The code construction rule (3) is channelindependent [12]. This means, the same rule can be used for constructing codes for any binaryinput channel [12]. However, it shows that for the additive white Gaussian noise (AWGN) channel, with zero mean and variance , the code works better if equation (2) is initialized by [13–15] where and is the energy spent per bits. In this case, the coded bits () are modulated by binary phase shift keying (BPSK) modulation. Hence, channels with low values are referred to as noiseless channels (or good channels).
Let be the set of good channels. Similarly, denotes the frozen set, which specifies the set of bad channels. Let be a message vector of length . In this vector, there are message bits () and frozen bits (). The codeword vector is generated by , where is a generator matrix.
In systematic polar encoding, the codeword is split into two parts [16]. This can be written as , where is an arbitrary subset of . These parts are recognized as message and parity parts of the codeword, respectively. In this case, where is a generator matrix formed by taking rows of indices and columns of indices of . In general, frozen bits are set to the value of zero. Hence, is a zero vector and can be calculated as
2.1. Effect of the Minimum Weight on the Performance of Polar Code
The minimum weight () of a systematic polar code is determined based on the weights of its rows, whose indices are elements of . This is given by [10, 17] where is the number of ones in the binary expansion of . In polar codes, the lowest expected parity weight of the codeword is one [4]. This means that of the code is obtained from messages, whose weights are not greater than . Based on this property and using equation (7), Table 1 gives minimum weight specifications of different polar codes. In this table, gives the multiplicity of the minimum weight determined by an exhaustive search algorithm, which considers all possible messages with weight no greater than of the code.

As a class of linear block codes, performance of polar codes can be analysed by its Inputoutput weight enumerating function (IOWEF), which is given by [18] where is the number of codewords with weight obtained from messages with weight . Based on IOWEF, the conditional weight enumerating function (CWEF) of the code is defined by
This leads to expressing the upper bound of the probability of error for the code decoded by a maximum likelihood decoding technique as follows: where is the signaltonoise ratio per bit. The above bound can also be represented as where
Here, gives the number of codewords generated by an input message with weight , whose paritycheck bits have weight . With a good approximation, the above probability is given by
Let , where . The relative contribution of each weight to the overall BER is given by
Example 1. The IOWEF of (8, 4) systematic polar code is given by
The CWEF of this code is .
From (11) and (12), probability of error of the code is .
Considering (12) and CWEF of the code, it is evident that the effect of codewords with weight 4 on the performance of the code is much higher than that with weight 8.
Figure 1 shows the relative contribution of the three lowest weights of (16, 8) and (32, 16) polar codes. It is clearly observed that by increasing , the minimum weight has the highest effect on the performance of code. Figure 2 shows the relative contribution of low weights of (32, 8) and (64, 16) polar codes with . The weight distributions of these short length codes conclude minimum weights with high multiplicities. Considering the probability of error given in equation (10), the existence of either the minimum weight with a high multiplicity or a low minimum weight relative to the length of the codeword will deteriorate performance of the polar code. As shown in the figures, this is more sensible at the medium to high .
3. Structure of Product Polar Codes (PPCS)
Product codes are represented as one of the most wellknown codes, whose high errorcorrecting capability is guaranteed due to their high minimum weight. Figure 3(a) shows the basic structure of product codes. In this code, every message with length is converted to blocks with length . The outer code encodes every block and generates codewords with length . Codewords obtained from the first encoder are transposed to construct blocks of length , which are considered as the message for the (inner) code. Finally, codewords obtained from the second encoding are multiplexed to form a codeword with length for the concatenated code. The minimum weight of product codes is calculated by [19], where and are minimum weights of the and constituent codes, respectively.
(a)
(b)
The product code can be viewed as a serially concatenated code, which is formed by outer and inner codes. This structure is shown in Figure 3(b). Indeed, the outer code encodes blocks of messages with length codewords obtained from this encoding which are interleaved to form messages with length . Finally, every bit message is encoded by the code to conclude a codeword with a length of [20].
The behaviour of the product code allows us to analyse its performance by utilizing the uniform interleaver with length , which maps information with length into all distinct permutations of it with equal probability of as seen in [18]. The analysis conducted by the uniform interleaver represents the average performance of the code. Indeed, for each value of the signaltonoise ratio, there will always be an interleaver, which provides better performance for the code compared to the uniform interleaver. In this case, the CWEF of the product code is expressed by [18] where and are the number of codewords with weight obtained to form messages with weight of the outer code and CWEF of the inner code, respectively. As from (9), we have
Let . Based on the Leibnitz theorem, the above equation is given by
The third term is expressed as
In product polar codes with the constituent by two half rate polar codes, the minimum weight obtained from messages with weight of is [4]. Hence, the lowest order of obtained from the third term will be . By contrast, for the first and second terms, the expected lowest order of is as they are only formed by one derivative. Therefore, for different s, the third term will not be as effective as the first and second terms on the performance of the code. This will be more evident, when the value of increases. Continuing the Leibnitz theorem for the first and second terms, CWEF of the inner code is approximately given by
For , . Hence,
Similarly, . Therefore, CWEF of the product code is finalised as follows:
As shown in Section 1.1, codewords with the minimum weight have the most effect on the performance of the code at the medium to high signaltonoise ratios. Therefore, equation (24) can be approximately given by
As the lowest order of obtained from is , more simplified CWEF of the product code is given by
On the other hand, the CWEF of a single polar code with rate and minimum weight of is approximately given by where is number of codewords with the weight of generated from messages with weight .
Based on and , Table 2 shows conditions for different product codes with , which satisfy . Considering (10), this inequality concludes that the product polar code can produce a lower upper bound of probability of error than that obtained from the single polar code. Conditions are formed by , which assumes that the multiplicity of the minimum weight obtained from the product code is much greater than that generated by the single code. It is observed that the expected lower probability of error for the product code is guaranteed by that are applicable in communication systems.

In particular cases, multiplicity of minimum weight of the product code can be similar or even smaller than the multiplicity of the minimum weight of the single code. This will provide a better condition for the product code to outperform the single code at the error floor region.
Figure 4 shows the probability of error for the (64, 16) code. In these graphs, only the minimum weight specifications of the code are considered in (13). Based on the exhaustive search algorithm, multiplicity of 196 for the minimum weight of the (64, 16) product code is obtained. From Table 1, it is observed that codes have the same minimum weight but the product code generates lower multiplicity for the minimum weight. This consequently provides a better error correcting compared to the single polar code. Again, the improvement should be mainly observed at the medium to high , where the practical behaviour of codes is matched with the calculated [18].
3.1. Reliability of Bit Channels for Product Polar Codes
The codeword obtained from the product polar encoding can be expressed as a matrix. This matrix can also be represented by two and submatrices, which denote the codeword of the outer code and parity bits of the inner code, respectively. The reliability of bits for the first and second submatrices is directly determined from equation (2). In every row of the first submatrix, computation is initialized by the value given in equation (3). Therefore, bits positioned at the same column will have the same reliability value. The reliability of bits at the inner code is determined on the basis of reliability of interleaved bits obtained from the first submatrix. Indeed, reliabilities calculated from rows of the first submatrix are considered as the initialized values for determining the reliability of bits positioned at the second submatrix.
Table 3 shows the reliability of bit channels for the (16, 4) product polar code constituted by two (4, 2) polar codes, which are recursively calculated by equation (2). In this case, channels are considered as binary AWGN and followed the polar code construction method proposed in [13–15] with dB. In the first encoding, reliability of bits positioned at the first two rows is obtained. This is accomplished when is applied for equation (2). In this case, , , are channel reliabilities of bits placed in one column of the first submatrix. Then, from these calculated values, those reliabilities positioned at one column of the matrix are applied as , , to determine reliabilities of parity bits for codewords of the polar code. All of the reliabilities relevant to the inner code are expressed as , in equation (2).

This table also gives the reliabilities of bit channels for the single (16, 4) polar code. Similar to the single code, the product code effectively polarizes the channel as either good or bad channels. Such recognition allows us to construct polar codes with arbitrary lengths and originated from the main product polar code when a number of codeword bits are punctured.
4. A Puncturing Technique for Product Polar Codes
A polar code is punctured by removing a number of rows and columns from the generator matrix. Let be the number of punctured bits. The codeword length and rate of the newly designed code are and , respectively. In product polar codes, puncturing can be conducted on one of its constituent codes. The rate of these codes formed by two constituent and codes is determined by where is the number of bits removed from the code.
In order to have equal to the rate of the single polar code (, ), the following condition should be satisfied:
This means a lower number of bits punctured from one of the constituent codes are required in comparison with the number of punctured bits applied for the single code.
Based on the twodimensional structure of the codeword, rows or columns representing the most unreliable bits of a constituent code will be removed. The structure of punctured codewords for the (64, 16) product code is given by where , , and are message bits and the rest are parity bits. In this matrix,“×” denotes position of punctured bits. This code is constructed by two (8, 4) polar codes. For a punctured code formed based on a low value of φ, it is possible to do the puncturing by selecting bits that are not adjacent to each other [21]. In this code, the first and fifth bits of the (8, 4) code have the lowest reliabilities. Hence, the information positioned at the mentioned columns (first and fifth columns) of the matrix is punctured. In this case, at every decoding step of the outer code, there would be at least one valid (nonpunctured) information, which assists the decoder to recover the original codeword.
On the other hand, based on transposing the received information, at the second decoder, some adjacent information is recognized as punctured information. However, as shown in Figure 5, due to interactive iterative decoding of the product code, in every iteration, decoded information obtained from two decoders is exchanged with each other. This allows both decoders to effectively recover the original information transmitted over the noisy channel. Regardless the error floor effect, existence of a good error correcting performance is expected from the medium to high , where the first decoder has a better chance to correctly decode the received information.
By contrast, in a single polar code formed by a high number of punctured bits, it is possible to puncture adjacent bits or those having high reliability. This is mainly evident for codes with [21]. Moreover, as interactive iterative decoding is not conducted for a single polar code, it is expected that with the same rate and length, punctured product polar codes outperform punctured single polar codes.
4.1. Puncturing Effect on the Channel Reliability for SPC and PPC
The reliability of the bit channel can effect error performance of the punctured code. Puncturing a bit ultimately deletes its bitchannel reliability. This consequently reduces the overall bitchannel reliability () of the code and mitigates decoding performance. The overall reliability of a polar code is defined by
As mentioned above, the value is reduced, when bits are punctured. Therefore, it is essential to keep as high as possible to have a good performance for the punctured code. Let be the overall reliability of nonpunctured bits of a punctured code, which is given by where is the bitchannel reliability value of the th bit of the codeword and represents the set of indices applied for punctured codeword bits. Obviously, for , the code is considered as a nonpunctured one. From (29) and (30), the below inequality can be observed
Therefore, if is tightly upper bounded, punctured bits have less effect on the code performance. This requires careful selection of puncturing bits so that the calculated remains close to of the code.
As mentioned before, in product polar codes, a lower of number of bits are punctured from their constituent codes compared to a single punctured code. Hence, less effect of punctured bits on the performance of product code compared to the single code is expected. Table 4 confirms this subject for the number of punctured product polar and single codes formed by the equal code length and rate.

5. Numerical Results
The bit error rate (BER) and frame error rate (FER) performances of different product and single polar codes transmitted over the AWGN channel are verified. Codes are modulated by BPSK and decoded by the softin softout belief propagation method mentioned in [16]. For product codes, four iterations are considered for the interactive decoding between two constituent decoders. For single systematic polar codes, decoding is accomplished by 60 iterations. A successive cancellation list with cyclic redundancy check (SCLCRC) decoding is performed with the list size of either or . Moreover, bit CRC code is applied. This means bits added to the message bits.
Figure 6 shows the performance of (64, 16) codes. It is observed that the product code has a similar BER performance to the single code with SCLCRC ( and ) decoding. Constituent half rate codes are decoded by 30 iterations. In addition, at dB, this code shows a performance better than the single polar code. The product code provides significantly better performance than SPC with BP decoding.
Figure 7 shows the performance of two product codes and their performance with BCHpolar [22] and RSpolar [23] codes. Constituents of both product codes are based on nonhalf rate polar codes. It shows that the (256, 42) product code with rate has close FER performance with BCHbased polar code. In addition, the (512, 171) product code is constituted by (32, 19) and (16, 9) polar codes. At dB, this code has 2.0 dB and 0.85 dB gain in BER performance compared to RSpolar and LDPCpolar codes, respectively. Similarly, the (1984, 946) product code constituted by the (62, 43) and (32, 22) polar codes has close performance to the single (2048, 1024) polar code decoded by SCLCRC decoding with and . All product codes apply 30 iterations in their BP decoding.
Figure 8 shows the performance of the (800, 256) product and (768, 256) single polar codes. In this case, the product code is constructed by two (32, 16) polar codes, which are decoded by BP decoding, including 90 iterations. Due to interactive iterative decoding applied in the product code, one decoder can properly recover punctured information from a block of information and deliver them to the second decoder for the next step of decoding. It is observed that the product code provides similar performance to decoding based SPC, while outperforming the single polar code decoded by BP decoding.
Figure 9 shows the BER and FER performances of the (3196, 1024) product and (3072, 1024) single polar codes. Again, 90 iterations were considered for BP decoding of constituent codes. It is observed that the product code has a better BER performance compared to the single code. It also has similar FER performance with the single code decoded by the SCLCRC technique with and .
Furthermore, BER performance of the (256^{2}, 239^{2}) product polar code and polarTPC proposed in [11] are analysed in Figure 10. Codes are modulated by quadrature phase shift keying (QPSK). Sixty (60) iterations are applied for BP decoding of the product polar code. It is concluded that the product code decoded by ten and twenty interactive iterations has similar performance to polarTPC decoded by the SCLChase algorithm with the list size of and , respectively.
6. Conclusions and Future Work
The paper presented a product coding scheme of polar codes formed by two different rates of polar codes. The conducted analysis and simulation results confirmed that the constructed product codes outperform the conventional polar codes. This is mainly evident in the medium to high signaltonoise ratios, which is applicable for both nonpunctured and punctured codes. In the future work, a modification of the structure of punctured product polar codes will be followed aimed at improving their performance.
Data Availability
Data sharing not applicable to this article as no data sets were generated or analysed during the current study.
Conflicts of Interest
The authors declare that there is no conflict of interest regarding the publication of this paper.
Acknowledgments
This work is supported by the Research Training Program (RTP) scholarship under Charles Darwin University.
References
 E. Arikan, “Channel polarization: a method for constructing capacityachieving codes for symmetric binaryinput memoryless channels,” IEEE Transactions on Information Theory, vol. 55, no. 7, pp. 3051–3073, 2009. View at: Publisher Site  Google Scholar
 Y. Wang, K. R. Narayanan, and Y.C. Huang, “Interleaved concatenations of polar codes with BCH and convolutional codes,” IEEE Journal on Selected Areas in Communications, vol. 34, no. 2, pp. 267–277, 2016. View at: Publisher Site  Google Scholar
 M. Bakshi, S. Jaggi, and M. Effros, “Concatenated polar codes,” in 2010 IEEE International Symposium on Information Theory, Austin, TX, USA, June 2010. View at: Publisher Site  Google Scholar
 A. Eslami and H. PishroNik, “On finitelength performance of polar codes: stopping sets, error floor, and concatenated design,” IEEE Transactions on Communications, vol. 61, no. 3, pp. 919–929, 2013. View at: Publisher Site  Google Scholar
 I. Tal and A. Vardy, “List decoding of polar codes,” IEEE Transactions on Information Theory, vol. 61, no. 5, pp. 2213–2226, 2015. View at: Publisher Site  Google Scholar
 T. Wang, D. Qu, and T. Jiang, “Paritycheckconcatenated polar codes,” IEEE Communications Letters, vol. 20, no. 12, pp. 2342–2345, 2016. View at: Publisher Site  Google Scholar
 J. Park, I. Kim, and H. Y. Song, “Construction of paritycheckconcatenated polar codes based on minimum hamming weight codewords,” Electronics Letters, vol. 53, no. 14, pp. 924–926, 2017. View at: Publisher Site  Google Scholar
 D. Wu, A. Liu, Y. Zhang, and Q. Zhang, “Parallel concatenated systematic polar codes,” Electronics Letters, vol. 52, no. 1, pp. 43–45, 2016. View at: Publisher Site  Google Scholar
 S.N. Hong, D. Hui, and I. Maric, “Capacityachieving ratecompatible polar codes,” IEEE Transactions on Information Theory, vol. 63, no. 12, pp. 7620–7632, 2017. View at: Publisher Site  Google Scholar
 Q. Zhang, A. Liu, Y. Zhang, and X. Liang, “Practical design and decoding of parallel concatenated structure for systematic polar codes,” IEEE Transactions on Communications, vol. 64, no. 2, pp. 456–466, 2016. View at: Publisher Site  Google Scholar
 T. KoikeAkino, C. Cao, and Y. Wang, “Turbo product codes with irregular polar coding for highthroughput parallel decoding in wireless OFDM transmission,” in 2018 IEEE International Conference on Communications (ICC), pp. 1–7, Kansas, MO, USA, May 2018. View at: Publisher Site  Google Scholar
 E. Arkan, “A performance comparison of polar codes and ReedMuller codes,” IEEE Communications Letters, vol. 12, no. 6, pp. 447–449, 2008. View at: Publisher Site  Google Scholar
 S. Zhao, P. Shi, and B. Wang, “Designs of Bhattacharyya parameter in the construction of polar codes,” in 2011 7th International Conference on Wireless Communications, Networking and Mobile Computing, pp. 1–4, Wuhan, China, September 2011. View at: Publisher Site  Google Scholar
 H. Li and J. Yuan, “A practical construction method for polar codes in AWGN channels,” in IEEE 2013 Tencon  Spring, pp. 223–226, Sydney, NSW, Australia, April 2013. View at: Publisher Site  Google Scholar
 H. Vangala, E. Viterbo, and Y. Hong, “A comparative study of polar code constructions for the AWGN channel,” https://arxiv.org/abs/1501.02473. View at: Google Scholar
 E. Arikan, “Systematic polar coding,” IEEE Communications Letters, vol. 15, no. 8, pp. 860–862, 2011. View at: Publisher Site  Google Scholar
 N. Hussami, S. B. Korada, and R. Urbanke, “Performance of polar codes for channel and source coding,” in 2009 IEEE International Symposium on Information Theory, Seoul, South Korea, June–July 2009. View at: Publisher Site  Google Scholar
 S. Benedetto, D. Divsalar, G. Montorsi, and F. Pollara, “Serial concatenation of interleaved codes: performance analysis, design and iterative decoding,” IEEE Transactions on Information Theory, vol. 44, no. 3, pp. 909–926, 1998. View at: Publisher Site  Google Scholar
 W. Ryan and S. Lin, Channel Codes: Classical and Modern, Cambridge University Press, Cambridge, United Kingdom, 2009.
 S. Lin and D. Costello, Error Control Coding:Fundamentals and Applications, Printice Hall, New Jersey, USA, 2004.
 M. Hanif and S. Vafi, “An efficient puncturing method for the short and long length polar codes,” in 2017 11th International Conference on Signal Processing and Communication Systems (ICSPCS), Gold Coast, QLD, Australia, December 2017. View at: Publisher Site  Google Scholar
 Y. Wang, L. Chen, C. Liu, and Z. Xing, “An improved concatenation scheme of BCHPolar codes with lowlatency decoding architecture,” IEEE Access, vol. 7, pp. 95867–95877, 2019. View at: Publisher Site  Google Scholar
 S. M. Zhao, S. P. Xu, and C. Xing, “Concatenated polarcoded multilevel modulation,” in 2015 10th International Conference on Communications and Networking in China (ChinaCom), Shanghai, China, August 2015. View at: Publisher Site  Google Scholar
Copyright
Copyright © 2020 Mohammad Abu Hanif and Sina Vafi. This is an open access article distributed under the Creative Commons Attribution License, which permits unrestricted use, distribution, and reproduction in any medium, provided the original work is properly cited.