On the next-to-minimal weight of projective Reed-Muller codes
C\'icero Carvalho, Victor G.L. Neumann

TL;DR
This paper determines several values of the next-to-minimal weights for projective Reed-Muller codes over finite fields with q ≥ 3, extending previous binary results and providing examples of codewords with specific zero set properties.
Contribution
It extends the known results on next-to-minimal weights of projective Reed-Muller codes to non-binary fields and provides explicit examples of codewords with particular zero set configurations.
Findings
Several values for the next-to-minimal weights are identified.
Examples of codewords with non-hyperplane zero sets are provided.
Extension of binary results to q ≥ 3 fields.
Abstract
In this paper we present several values for the next-to-minimal weights of projective Reed-Muller codes. We work over with since in IEEE-IT 62(11) p. 6300-6303 (2016) we have determined the complete values for the next-to-minimal weights of binary projective Reed-Muller codes. As in loc. cit. here we also find examples of codewords with next-to-minimal weight whose set of zeros is not in a hyperplane arrangement.
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Taxonomy
TopicsCoding theory and cryptography · Cooperative Communication and Network Coding · Advanced Wireless Communication Technologies
On the next-to-minimal weight of projective Reed-Muller codes
Cícero Carvalho and Victor G.L. Neumann111Authors’ emails: [email protected] and [email protected]. Both authors were partially supported by grants from CNPq and FAPEMIG.
Faculdade de Matemática, Universidade Federal de Uberlândia, Av. J. N. Ávila 2121, 38.408-902 Uberlândia - MG, Brazil
Abstract. In this paper we present several values for the next-to-minimal weights of projective Reed-Muller codes. We work over with since in [3] we have determined the complete values for the next-to-minimal weights of binary projective Reed-Muller codes. As in [3] here we also find examples of codewords with next-to-minimal weight whose set of zeros is not in a hyperplane arrangement.
1 Introduction
Reed-Muller codes were introduced in 1954 by D.E. Muller ([11]) as codes defined over , and a decoding algorithm for them was devised by I.S. Reed ([12]). In 1968 Kasami, Lin, and Peterson ([7]) extended the original definition to a finite field , where is any prime power, and named these codes “generalized Reed-Muller codes”. They also presented some results on the weight distribution, the dimension of the codes being determined in later works. In coding theory one is always interested in the values of the higher Hamming weights of a code because of their relationship with the code performance, but usually this is not a simple problem. For the generalized Reed-Muller codes, the complete determination of the second lowest Hamming weight, also called next-to-minimal weight, was only completed in 2010, when Bruen ([2]) observed that the value of these weights could be obtained from unpublished results in the Ph.D. thesis of D. Erickson ([4]) and Bruen’s own results from 1992 and 2006. Now that Bruen called the attention the Erickson’s thesis we know that the complete list of the next-to-minimal weights for the generalized Reed-Muller codes may be obtained by combining results from Erickson’s thesis with results by Geil (see [6]) or with results by Rolland (see [16]).
In 1990 Lachaud introduced the class of projective Reed-Muller codes (see [8]). The parameters of this codes were determined by Serre ([19]), for some cases, and by Sørensen ([20]) for the general case. As for the determination of the next-to-minimal weight for these codes, there are some results (also about higher Hamming weights) on this subject by Rodier and Sboui ([14], [15], [18]) and also by Ballet and Rolland ([1]). Recently the authors of this note completely determined the next-to-minimal weight of projective Reed-Muller codes defined over (see [3]) In this paper we present several results on the next-to-minimal Hamming weights for projective Reed-Muller codes, including the complete determination of the next-to-minimal weights for the case of projective Reed-Muller codes defined over . In the next section we recall the definitions of the generalized and projective Reed-Muller codes, and some results of geometrical nature that will allow us to determine many cases of higher Hamming weights for the projective Reed-Muller codes, which we do in the last section.
2 Preliminary results
Let be a finite field and let be the ideal of polynomials which vanish at all points of the affine space . Let be the -linear transformation given by .
Definition 2.1
Let be a nonnegative integer. The generalized Reed-Muller code of order is defined as .
It is not difficult to prove that if , so in this case the minimum distance is 1. Let and write with , then the minimum distance of is
[TABLE]
According to [4] and [2] (see also [1, Thm. 9]) the next-to-minimal weight of is equal to
[TABLE]
where
[TABLE]
We will need some specific values of in the next section.
Let be the points of , where . From e.g. [13] or [10] we get that the homogeneous ideal of the polynomials which vanish in all points of is generated by . We denote by (respectively, ) the -vector subspace formed by the homogeneous polynomials of degree (together with the zero polynomial) in (respectively, ).
Definition 2.2
Let be a positive integers and let be the -linear transformation given by , where we write the points of in the standard notation, i.e. the first nonzero entry from the left is equal to 1. The projective Reed-Muller code of order , denoted by , is the image of .
In [20] Sørensen determined all values for the minimum distance of and proved that
[TABLE]
One may wonder if there is a similar relation between the next-to-minimal weight of projective Reed-Muller codes and the next-to-minimal weight of generalized Reed-Muller codes. A hint that this might be true comes from the following reasoning. Let be the Hamming weight of , where is a polynomial of degree , and let be the homogenization of with respect to . Then the degree of is and the weight of is . This shows that, denoting by the next-to-minimal weight of , we have
[TABLE]
In [3] we determined all values for the next-to-minimal weights of projective Reed-Muller codes defined over , and from those results we get that there are cases for which equality does not hold in (2.2). In the next section we will determine several values for the next-to-minimal weights of projective Reed-Muller codes defined over , with , and we will also find some cases where equality does not hold in (2.2). We recall from [3] a definition and some results that we will need to prove the main results.
Definition 2.3
Let . The set of points of which are not zeros of is called the support of , and we denote its cardinality by (hence is the weight of the codeword ).
In what follows the integers and will always be the ones uniquely defined by the equality
[TABLE]
with and .
Theorem 2.4
*([3, Lemma 2.4, Lemma 2.5, Prop. 2.6 and Prop. 2.7]) Let be a nonzero polynomial, and let be it support, which we assume to be nonempty. Then:
i) if there exists a hyperplane such that and then ;
ii) if then there exists a hyperplane such that ;
iii) if then there exists and a linear subspace of dimension such that .*
3 Main results
In this section we determine the next-to-minimal weight for most cases of projective Reed-Muller codes. Recall that we are assuming . We start by treating the case where .
Proposition 3.1
If , with then
[TABLE]
**Proof: ** Let be a nonzero polynomial such that
[TABLE]
(such a polynomial exists because ). Let be the support of , from Theorem 2.4 (iii) there exists a hyperplane such that . From Theorem 2.4 (i) we get that or , so that , and from inequality (2.2) we get .
Now we start to study the case where .
Proposition 3.2
Let be such that . If either , or , and , we get
[TABLE]
**Proof: ** From (2.1) we get that
[TABLE]
where, when , and we have (and a fortiori ), and when and we have (and a fortiori ). Assume, by means of absurd, that there exists such that
[TABLE]
and let be the support of . From Theorem 2.4 (ii) and (i) we get , a contradiction. Hence and a fortiori .
Next we treat the case where , and . We observe from (2.1) that (actually we have equality when and an strict inequality when ).
Proposition 3.3
Let , and , then
[TABLE]
**Proof: ** In case let , where
[TABLE]
or let in case . We claim that , and let be a point in the support of . If then we may take , and we have (or in case ). Thus we must have and , so we get points of this form in the support. If then
[TABLE]
in case , or in case . We see that for any we get , thus we must have and , so we get points of this form in the support, and we get
[TABLE]
this proves that . Assume, by means of absurd, that there exists such that
[TABLE]
and let be the support of . From Theorem 2.4 (ii) and (i) we get , a contradiction, and we conclude that .
The above proof shows that the next-to-minimal weight of projective Reed-Muller codes is not, in all cases, attained only by evaluating polynomials that split completely as a product of degree one factors. For example, in the case of the above result (hence and ) the next-to-minimal weight is attained from the evaluation of an irreducible quadric. This is in contrast with what happens with polynomials that attain the minimum distance of and which must be product of degree one polynomials (see [5] and [17] respectively). Also, in [9], the author proves that codewords of next-to-minimal weight in , when , always come from the evaluation of polynomials which are products of degree one polynomials.
The following result deals with the case where and (so that and ).
Proposition 3.4
Let and then
[TABLE]
**Proof: ** Let be such that
[TABLE]
From Theorem 2.4 (ii) and (i) we get , a contradiction, hence from we get . Let be such that and let be its support. From Theorem 2.4 (i) if there exists a line in not intersecting then , so let’s assume that there is no such line. After a projective transformation we may assume that is not in , and let be the lines that contain . Let , since we have and from we must have at most one line intersecting in points. After a projective transformation that fixes we may assume that the line intersects in points, and that and are the points of the line missing , so we may write . Observe that there are points of the form in the support of . Let , then and for each we have values for such that . On the other hand, if then either or for , so that or , which proves .
We summarize the results for obtained in [3] and in this paper in the following tables, where we also list the corresponding values of for comparison.
The reference list from the paper itself. Each links out to its DOI / PubMed record.
- 1[1] S. Ballet, R. Rolland, On low weight codewords of generalized affine and projective Reed-Muller codes, Des. Codes Cryptogr. 73 (2014) 271–297.
- 2[2] A. Bruen, Blocking sets and low-weight codewords in the generalized Reed-Muller codes, Contemp. Math. 525 (2010) 161–164.
- 3[3] C. Carvalho, C.; V. G.L. Neumann, The next-to-minimal weights of binary projective Reed-Muller codes. IEEE Transactions on Information Theory, 62 (2016) 6300–6303.
- 4[4] D. Erickson, Counting zeros of polynomials over finite fields. Ph D Thesis, California Institute of Technology, Pasadena (1974).
- 5[5] P. Delsarte, J. Goethals, F. Mac Williams, On generalized Reed-Muller codes and their relatives, Inform. Control 16 (1970) 403–442.
- 6[6] O. Geil, On the second weight of generalized Reed-Muller codes. Des. Codes Cryptogr. 48 (3) (2008) 323–330.
- 7[7] T. Kasami, S. Lin, and W. W. Peterson, New generalizations of the Reed-Muller codes-Part I: Primitive codes, IEEE Trans. Inform. Theory, 2͡xtbf 14 (1968) 189–199.
- 8[8] G. Lachaud, The parameters of projective Reed-Muller codes, Discrete Math. 81 (2) (1990) 217–221.
