Internet DRAFT - draft-ribose-cfrg-sm4
draft-ribose-cfrg-sm4
Internet Research Task Force R. Tse
Internet-Draft Ribose
Intended status: Informational W. Wong
Expires: October 23, 2018 Hang Seng Management College
M-J. Saarinen
Independent Consultant
April 21, 2018
The SM4 Blockcipher Algorithm And Its Modes Of Operations
draft-ribose-cfrg-sm4-10
Abstract
This document describes the SM4 symmetric blockcipher algorithm
published as GB/T 32907-2016 by the State Cryptography Administration
of China (SCA).
This document is a product of the Crypto Forum Research Group (CFRG).
Status of This Memo
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Copyright Notice
Copyright (c) 2018 IETF Trust and the persons identified as the
document authors. All rights reserved.
This document is subject to BCP 78 and the IETF Trust's Legal
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Table of Contents
1. Introduction . . . . . . . . . . . . . . . . . . . . . . . . 4
1.1. Purpose . . . . . . . . . . . . . . . . . . . . . . . . . 4
1.2. History . . . . . . . . . . . . . . . . . . . . . . . . . 4
2. Terms and Definitions . . . . . . . . . . . . . . . . . . . . 5
3. Symbols And Abbreviations . . . . . . . . . . . . . . . . . . 6
4. Compute Structure . . . . . . . . . . . . . . . . . . . . . . 6
5. Key And Key Parameters . . . . . . . . . . . . . . . . . . . 7
6. Functions . . . . . . . . . . . . . . . . . . . . . . . . . . 7
6.1. Round Function F . . . . . . . . . . . . . . . . . . . . 7
6.2. Permutations T and T' . . . . . . . . . . . . . . . . . . 7
6.2.1. Nonlinear Transformation tau . . . . . . . . . . . . 8
6.2.2. Linear Transformations L and L' . . . . . . . . . . . 8
6.2.3. S-box S . . . . . . . . . . . . . . . . . . . . . . . 8
7. Algorithm . . . . . . . . . . . . . . . . . . . . . . . . . . 9
7.1. Encryption . . . . . . . . . . . . . . . . . . . . . . . 9
7.2. Decryption . . . . . . . . . . . . . . . . . . . . . . . 12
7.3. Key Schedule . . . . . . . . . . . . . . . . . . . . . . 12
7.3.1. Family Key FK . . . . . . . . . . . . . . . . . . . . 13
7.3.2. Constant Key CK . . . . . . . . . . . . . . . . . . . 13
8. Modes of Operation . . . . . . . . . . . . . . . . . . . . . 14
8.1. Variables And Primitives . . . . . . . . . . . . . . . . 14
8.2. Initialization Vectors . . . . . . . . . . . . . . . . . 15
8.3. SM4-ECB . . . . . . . . . . . . . . . . . . . . . . . . . 15
8.3.1. SM4-ECB Encryption . . . . . . . . . . . . . . . . . 15
8.3.2. SM4-ECB Decryption . . . . . . . . . . . . . . . . . 16
8.4. SM4-CBC . . . . . . . . . . . . . . . . . . . . . . . . . 16
8.4.1. SM4-CBC Encryption . . . . . . . . . . . . . . . . . 17
8.4.2. SM4-CBC Decryption . . . . . . . . . . . . . . . . . 17
8.5. SM4-CFB . . . . . . . . . . . . . . . . . . . . . . . . . 18
8.5.1. SM4-CFB Variants . . . . . . . . . . . . . . . . . . 18
8.5.2. SM4-CFB Encryption . . . . . . . . . . . . . . . . . 19
8.5.3. SM4-CFB Decryption . . . . . . . . . . . . . . . . . 19
8.6. SM4-OFB . . . . . . . . . . . . . . . . . . . . . . . . . 20
8.6.1. SM4-OFB Encryption . . . . . . . . . . . . . . . . . 20
8.6.2. SM4-OFB Decryption . . . . . . . . . . . . . . . . . 21
8.7. SM4-CTR . . . . . . . . . . . . . . . . . . . . . . . . . 22
8.7.1. SM4-CTR Encryption . . . . . . . . . . . . . . . . . 22
8.7.2. SM4-CTR Decryption . . . . . . . . . . . . . . . . . 23
9. Object Identifier . . . . . . . . . . . . . . . . . . . . . . 24
9.1. GM/T OIDs . . . . . . . . . . . . . . . . . . . . . . . . 24
9.1.1. SCA OID Prefix . . . . . . . . . . . . . . . . . . . 24
9.1.2. Blockcipher Algorithms . . . . . . . . . . . . . . . 24
9.1.3. Standard Identification . . . . . . . . . . . . . . . 25
9.2. ISO OID . . . . . . . . . . . . . . . . . . . . . . . . . 25
10. Design Considerations . . . . . . . . . . . . . . . . . . . . 25
10.1. Basic Transformation . . . . . . . . . . . . . . . . . . 25
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10.2. Nonlinear Transformation . . . . . . . . . . . . . . . . 26
10.2.1. S-box Algebraic Expression . . . . . . . . . . . . . 26
10.2.2. Algebraic Degree And Distribution Of Terms . . . . . 27
10.2.3. Differential Distribution . . . . . . . . . . . . . 28
10.2.4. Nonlinearity . . . . . . . . . . . . . . . . . . . . 29
10.2.5. Maximum Linearity Advantage . . . . . . . . . . . . 29
10.2.6. Balance . . . . . . . . . . . . . . . . . . . . . . 29
10.2.7. Completness and Avalanche Effect . . . . . . . . . . 30
10.3. Linear Transform . . . . . . . . . . . . . . . . . . . . 30
10.4. Key Expansion Algorithm . . . . . . . . . . . . . . . . 31
11. Cryptanalysis Results . . . . . . . . . . . . . . . . . . . . 32
11.1. Differential Cryptanalysis . . . . . . . . . . . . . . . 32
11.2. Linear Cryptanalysis . . . . . . . . . . . . . . . . . . 33
11.3. Multi-dimensional Linear Cryptanalysis . . . . . . . . . 33
11.4. Impossible Differential Cryptanalysis . . . . . . . . . 33
11.5. Zero-correlation Linear Cryptanalysis . . . . . . . . . 34
11.6. Integral Cryptanalysis . . . . . . . . . . . . . . . . . 34
11.7. Algebraic Attacks . . . . . . . . . . . . . . . . . . . 34
11.8. Matrix Attacks . . . . . . . . . . . . . . . . . . . . . 34
11.9. Provable Security Against Differential And Linear
Cryptanalysis . . . . . . . . . . . . . . . . . . . . . 35
11.10. Provable Security Against Related-Key Differential
Cryptanalysis . . . . . . . . . . . . . . . . . . . . . 35
11.11. Summary of SM4 Cryptanalytic Attacks . . . . . . . . . . 36
12. Security Considerations . . . . . . . . . . . . . . . . . . . 37
13. IANA Considerations . . . . . . . . . . . . . . . . . . . . . 39
14. References . . . . . . . . . . . . . . . . . . . . . . . . . 39
14.1. Normative References . . . . . . . . . . . . . . . . . . 39
14.2. Informative References . . . . . . . . . . . . . . . . . 39
Appendix A. Appendix A: Example Calculations . . . . . . . . . . 45
A.1. Examples From GB/T 32907-2016 . . . . . . . . . . . . . . 45
A.1.1. Example 1 (GB/T 32907-2016 Example 1 Encryption) . . 45
A.1.2. Example 2 (GB/T 32907-2016 Example 1 Decryption) . . 47
A.1.3. Example 3 (GB/T 32907-2016 Example 2 Encryption) . . 48
A.1.4. Example 4 . . . . . . . . . . . . . . . . . . . . . . 48
A.1.5. Example 5 . . . . . . . . . . . . . . . . . . . . . . 49
A.1.6. Example 6 . . . . . . . . . . . . . . . . . . . . . . 50
A.2. Examples For Various Modes Of Operations . . . . . . . . 51
A.2.1. SM4-ECB Examples . . . . . . . . . . . . . . . . . . 51
A.2.1.1. Example 1 . . . . . . . . . . . . . . . . . . . . 51
A.2.1.2. Example 2 . . . . . . . . . . . . . . . . . . . . 51
A.2.2. SM4-CBC Examples . . . . . . . . . . . . . . . . . . 52
A.2.2.1. Example 1 . . . . . . . . . . . . . . . . . . . . 52
A.2.2.2. Example 2 . . . . . . . . . . . . . . . . . . . . 52
A.2.3. SM4-OFB Examples . . . . . . . . . . . . . . . . . . 53
A.2.3.1. Example 1 . . . . . . . . . . . . . . . . . . . . 53
A.2.3.2. Example 2 . . . . . . . . . . . . . . . . . . . . 53
A.2.4. SM4-CFB Examples . . . . . . . . . . . . . . . . . . 53
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A.2.4.1. Example 1 . . . . . . . . . . . . . . . . . . . . 54
A.2.4.2. Example 2 . . . . . . . . . . . . . . . . . . . . 54
A.2.5. SM4-CTR Examples . . . . . . . . . . . . . . . . . . 54
A.2.5.1. Example 1 . . . . . . . . . . . . . . . . . . . . 54
A.2.5.2. Example 2 . . . . . . . . . . . . . . . . . . . . 55
Appendix B. Sample Implementation In C . . . . . . . . . . . . . 56
B.1. sm4.h . . . . . . . . . . . . . . . . . . . . . . . . . . 56
B.2. sm4.c . . . . . . . . . . . . . . . . . . . . . . . . . . 56
B.3. sm4_main.c . . . . . . . . . . . . . . . . . . . . . . . 60
B.4. print.c and print.h . . . . . . . . . . . . . . . . . . . 65
Appendix C. Acknowledgements . . . . . . . . . . . . . . . . . . 66
Authors' Addresses . . . . . . . . . . . . . . . . . . . . . . . 66
1. Introduction
SM4 [GBT.32907-2016] [ISO.IEC.18033-3.AMD2] is a cryptographic
standard issued by the State Cryptography Administration (SCA) of
China [SCA] (formerly the Office of State Commercial Cryptography
Administration, OSCCA) as an authorized cryptographic algorithm for
the use within China. The algorithm is published in public.
SM4 is a symmetric encryption algorithm, specifically a blockcipher,
designed for data encryption.
1.1. Purpose
This document does not aim to introduce a new algorithm, but to
provide a clear and open description of the SM4 algorithm in English,
and also to serve as a stable reference for IETF documents that
utilize this algorithm.
While this document is similar to [SM4-En] in nature, [SM4-En] is a
textual translation of the "SMS4" algorithm [SM4] published in 2006.
Instead, this document follows the updated description and structure
of [GBT.32907-2016] published in 2016. Sections 1 to 7 of this
document directly map to the corresponding sections numbers of the
[GBT.32907-2016] standard for convenience of the reader.
This document also provides additional information on the design
considerations of the SM4 algorithm [SM4-Details], its modes of
operations that are currently being used (see Section 8), and the
offical SM4 OIDs (see Section 9).
1.2. History
The "SMS4" algorithm (the former name of SM4) was invented by Shu-
Wang Lu [LSW-Bio]. It was first published in 2003 as part of
[GB.15629.11-2003], then published independently in 2006 by SCA
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(OSCCA at that time) [SM4], published as an industry cryptographic
standard and renamed to "SM4" in 2012 by SCA (OSCCA at that time)
[GMT-0002-2012], and finally formalized in 2016 as a Chinese National
Standard (GB Standard) [GBT.32907-2016]. SM4 has also been
standardized in [ISO.IEC.18033-3.AMD2] by the International
Organization for Standardization in 2017.
SMS4 was originally created for use in protecting wireless networks
[SM4], and is mandated in the Chinese National Standard for Wireless
LAN WAPI (Wired Authentication and Privacy Infrastructure)
[GB.15629.11-2003]. A proposal was made to adopt SMS4 into the IEEE
802.11i standard, but the algorithm was eventually not included due
to concerns of introducing inoperability with existing ciphers.
The latest SM4 standard [GBT.32907-2016] was proposed by the SCA
(OSCCA at that time), standardized through TC 260 of the
Standardization Administration of the People's Republic of China
(SAC), and was drafted by the following individuals at the Data
Assurance and Communication Security Research Center (DAS Center) of
the Chinese Academy of Sciences, the China Commercial Cryptography
Testing Center and the Beijing Academy of Information Science &
Technology (BAIST):
o Shu-Wang Lu
o Dai-Wai Li
o Kai-Yong Deng
o Chao Zhang
o Peng Luo
o Zhong Zhang
o Fang Dong
o Ying-Ying Mao
o Zhen-Hua Liu
2. Terms and Definitions
The key words "*MUST*", "*MUST NOT*", "*REQUIRED*", "*SHALL*",
"*SHALL NOT*", "*SHOULD*", "*SHOULD NOT*", "*RECOMMENDED*", "*NOT
RECOMMENDED*", "*MAY*", and "*OPTIONAL*" in this document are to be
interpreted as described in BCP 14 [RFC2119] [RFC8174] when, and only
when, they appear in all capitals, as shown here.
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The following terms and definitions apply to this document.
block length
Bit-length of a message block.
key length
Bit-length of a key.
key expansion algorithm
An operation that converts a key into a round key.
rounds
The number of iterations that the round function is run.
round key
A key used in each round on the blockcipher, derived from the
input key, also called a subkey.
word
a 32-bit quantity
S-box
The S (substitution) box function produces 8-bit output from 8-bit
input, represented as S(.)
3. Symbols And Abbreviations
S xor T
bitwise exclusive-or of two 32-bit vectors S and T. S and T will
always have the same length.
a <<< i
32-bit bitwise cyclic shift on a with i bits shifted left.
4. Compute Structure
The SM4 algorithm is a blockcipher, with block size of 128 bits and a
key length of 128 bits.
Both encryption and key expansion use 32 rounds of a nonlinear key
schedule per block. Each round processes one of the four 32-bit
words that constitute the block.
The structure of encryption and decryption are identical, except that
the round key schedule has its order reversed during decryption.
Using a 8-bit S-box, it only uses exclusive-or, cyclic bit shifts and
S-box lookups to execute.
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5. Key And Key Parameters
The SM4 encryption key is 128 bits long and represented below, where
each MK_i, (i = 0, 1, 2, 3) is 32 bits long.
MK = (MK_0, MK_1, MK_2, MK_3)
The round key schedule is derived from the encryption key,
represented as below where each rk_i (i = 0, ..., 31) is 32 bits
long:
(rk_0, rk_1, ... , rk_31)
The family key used for key expansion is represented as FK, where
each FK_i (i = 0, ..., 3) is 32 bits long:
FK = (FK_0, FK_1, FK_2, FK_3)
The constant key used for key expansion is represented as CK, where
each CK_i (i = 0, ..., 31) is 32 bits long:
CK = (CK_0, CK_1, ... , CK_31)
6. Functions
6.1. Round Function F
The round function F is defined as:
F(X_0, X_1, X_2, X_3, rk) = X_0 xor T(X_1 xor X_2 xor X_3 xor rk)
Where:
o Each $$X_i$ is 32-bit wide.
o The round key rk is 32-bit wide.
6.2. Permutations T and T'
T is a reversible permutation that outputs 32 bits from a 32-bit
input.
It consists of a nonlinear transform tau and linear transform L.
T(.) = L(tau(.))
The permutation T' is created from T by replacing the linear
transform function L with L'.
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T'(.) = L'(tau(.))
6.2.1. Nonlinear Transformation tau
tau is composed of four parallel S-boxes.
Given a 32-bit input A, where each a_i is a 8-bit string:
A = (a_0, a_1, a_2, a_3)
The output is a 32-bit B, where each b_i is a 8-bit string:
B = (b_0, b_1, b_2, b_3)
B is calculated as follows:
(b_0, b_1, b_2, b_3) = tau(A)
tau(A) = (S(a_0), S(a_1), S(a_2), S(a_3))
6.2.2. Linear Transformations L and L'
The output of nonlinear transformation function tau is used as input
to linear transformation function L.
Given B, a 32-bit input.
The linear transformation L' is defined as follows.
L(B) = B xor (B <<< 2) xor (B <<< 10) xor (B <<< 18) xor (B <<< 24)
The linear transformation L' is defined as follows.
L'(B) = B xor (B <<< 13) xor (B <<< 23)
6.2.3. S-box S
The S-box S used in nonlinear transformation tau is given in the
lookup table shown in Figure 1 with hexadecimal values.
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| 0 1 2 3 4 5 6 7 8 9 A B C D E F
---|-------------------------------------------------
0 | D6 90 E9 FE CC E1 3D B7 16 B6 14 C2 28 FB 2C 05
1 | 2B 67 9A 76 2A BE 04 C3 AA 44 13 26 49 86 06 99
2 | 9C 42 50 F4 91 EF 98 7A 33 54 0B 43 ED CF AC 62
3 | E4 B3 1C A9 C9 08 E8 95 80 DF 94 FA 75 8F 3F A6
4 | 47 07 A7 FC F3 73 17 BA 83 59 3C 19 E6 85 4F A8
5 | 68 6B 81 B2 71 64 DA 8B F8 EB 0F 4B 70 56 9D 35
6 | 1E 24 0E 5E 63 58 D1 A2 25 22 7C 3B 01 21 78 87
7 | D4 00 46 57 9F D3 27 52 4C 36 02 E7 A0 C4 C8 9E
8 | EA BF 8A D2 40 C7 38 B5 A3 F7 F2 CE F9 61 15 A1
9 | E0 AE 5D A4 9B 34 1A 55 AD 93 32 30 F5 8C B1 E3
A | 1D F6 E2 2E 82 66 CA 60 C0 29 23 AB 0D 53 4E 6F
B | D5 DB 37 45 DE FD 8E 2F 03 FF 6A 72 6D 6C 5B 51
C | 8D 1B AF 92 BB DD BC 7F 11 D9 5C 41 1F 10 5A D8
D | 0A C1 31 88 A5 CD 7B BD 2D 74 D0 12 B8 E5 B4 B0
E | 89 69 97 4A 0C 96 77 7E 65 B9 F1 09 C5 6E C6 84
F | 18 F0 7D EC 3A DC 4D 20 79 EE 5F 3E D7 CB 39 48
Figure 1: SM4 S-box Values
For example, input "EF" will produce an output read from the S-box
table row E and column F, giving the result S(EF) = 84.
7. Algorithm
7.1. Encryption
The encryption algorithm consists of 32 rounds and 1 reverse
transform R.
Given a 128-bit plaintext input, where each X_i is 32-bit wide:
(X_0, X_1, X_2, X_3)
The output is a 128-bit ciphertext, where each Y_i is 32-bit wide:
(Y_0, Y_1, Y_2, Y_3)
Each round key is designated as rk_i, where each rk_i is 32-bit wide
and i = 0, 1, 2, ..., 31.
a. 32 rounds of calculation
i = 0, 1, ..., 31
X_{i+4} = F(X_i, X_{i+1}, X_{i+2}, X_{i+3}, rk_i)
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b. reverse transformation
(Y_0, Y_1, Y_2, Y_3) = R(X_32, X_33, X_34, X_35)
R(X_32, X_33, X_34, X_35) = (X_35, X_34, X_33, X_32)
Please refer to Appendix A for sample calculations.
A flow of the calculation is given in Figure 2.
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128-bits plaintext
\___________________________/
|
v
X_0 X_1 X_2 X_3
| | | |
v v v v
+---------------------------+
Round 1 | Round Function | <--rk_0
+---------------------------+
| | | |
X_1 X_2 X_3 X_4
| | | |
v v v v
+---------------------------+
Round 2 | Round Function | <--rk_1
+---------------------------+
| | | |
X_2 X_3 X_4 X_5
| | | |
v v v v
...
X_31 X_32 X_33 X_34
| | | |
v v v v
+---------------------------+
Round 32 | Round Function | <--rk_31
+---------------------------+
| | | |
X_32 X_33 X_34 X_35
| | | |
v v v v
+---------------------------+
| Reverse Transformation R |
+---------------------------+
| | | |
Y_0 Y_1 Y_2 Y_3
\___________________________/
|
v
128-bits ciphertext
Figure 2: SM4 Encryption Flow
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7.2. Decryption
Decryption takes an identical process as encryption, with the only
difference the order of the round key sequence.
During decryption, the round key sequence is:
(rk_31, rk_30, ..., rk_0)
7.3. Key Schedule
Round keys used during encryption are derived from the encryption
key.
Specifically, given the encryption key MK, where each MK_i is 32-bit
wide:
MK = (MK_0, MK_1, MK_2, MK_3)
Each round key rk_i is created as follows, where i = 0, 1, ..., 31.
(K_0, K_1, K_2, K_3) =
(MK_0 xor FK_0, MK_1 xor FK_1, MK_2 xor FK_2, MK_3 xor FK_3)
rk_i = K_{i + 4}
K_{i + 4} =
K_i xor T' (K_{i + 1} xor K_{i + 2} xor K_{i + 3} xor CK_i)
Since the decryption key is identical to the encryption key, the
round keys used in the decryption process are derived from the
decryption key through the identical process to that of during
encryption.
Figure 3 depicts the i-th round of SM4.
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X_i rk_i X_{i+1} X_{i+2} X_{i+3}
| | | | |
| | | | |
| v | | |
+---+ +---+ +---+ | | |
| X | | | | X | <--+ | |
| O | <- | T | <- | O | <----------+ |
| R | | | | R | <------------------+
+---+ +---+ +---+ | | |
| / / /
| / / /
| / / /
\--------------------------------------=
/ / / \
/ / / |
/---------------/ / / |
| | | |
X_{i+1} X_{i+2} X_{i+3} X_{i+4}
Figure 3: SM4 Round Function For the i-th Round
7.3.1. Family Key FK
Family key FK given in hexadecimal notation, is:
FK_0 = A3B1BAC6
FK_1 = 56AA3350
FK_2 = 677D9197
FK_3 = B27022DC
7.3.2. Constant Key CK
The method to retrieve values from the constant key CK is as follows.
Let ck_{i, j} be the j-th byte (i = 0, 1, ..., 31; j = 0, 1, 2, 3) of
CK_i.
Therefore, each ck_{i, j} is a 8-bit string, and each CK_i a 32-bit
word.
CK_i = (ck_{i, 0}, ck_{i, 1}, ck_{i, 2}, ck_{i, 3})
ck_{i, j} = (4i + j) x 7 (mod 256)
The values of the constant key CK_i, where (i = 0, 1, ..., 31), in
hexadecimal, are:
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CK_0 = 00070E15 CK_16 = C0C7CED5
CK_1 = 1C232A31 CK_17 = DCE3EAF1
CK_2 = 383F464D CK_18 = F8FF060D
CK_3 = 545B6269 CK_19 = 141B2229
CK_4 = 70777E85 CK_20 = 30373E45
CK_5 = 8C939AA1 CK_21 = 4C535A61
CK_6 = A8AFB6BD CK_22 = 686F767D
CK_7 = C4CBD2D9 CK_23 = 848B9299
CK_8 = E0E7EEF5 CK_24 = A0A7AEB5
CK_9 = FC030A11 CK_25 = BCC3CAD1
CK_10 = 181F262D CK_26 = D8DFE6ED
CK_11 = 343B4249 CK_27 = F4FB0209
CK_12 = 50575E65 CK_28 = 10171E25
CK_13 = 6C737A81 CK_29 = 2C333A41
CK_14 = 888F969D CK_30 = 484F565D
CK_15 = A4ABB2B9 CK_31 = 646B7279
8. Modes of Operation
This document defines multiple modes of operation for the SM4
blockcipher algorithm.
The CBC (Cipher Block Chaining), ECB (Electronic CodeBook), CFB
(Cipher FeedBack), OFB (Output FeedBack) and CTR (Counter) modes are
defined in [NIST.SP.800-38A] and utilized with the SM4 algorithm in
the following sections.
8.1. Variables And Primitives
Hereinafter we define:
SM4Encrypt(P, K)
The SM4 algorithm that encrypts plaintext P with key K, described
in Section 7.1
SM4Decrypt(C, K)
The SM4 algorithm that decrypts ciphertext C with key K, described
in Section 7.2
b
block size in bits, defined as 128 for SM4
P_j
block j of ciphertext bitstring P
C_j
block j of ciphertext bitstring C
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NBlocks(B, b)
Number of blocks of size b-bit in bitstring B
IV
Initialization vector
LSB(b, S)
Least significant b bits of the bitstring S
MSB(b, S)
Most significant b bits of the bitstring S
8.2. Initialization Vectors
The CBC, CFB and OFB modes require an additional input to the
encryption process, called the initialization vector (IV). The
identical IV is used in the input of encryption as well as the
decryption of the corresponding ciphertext.
Generation of IV values *MUST* take into account of the
considerations in Section 12 recommended by [BC-EVAL].
8.3. SM4-ECB
In SM4-ECB, the same key is utilized to create a fixed assignment for
a plaintext block with a ciphertext block, meaning that a given
plaintext block always gets encrypted to the same ciphertext block.
As described in [NIST.SP.800-38A], this mode should be avoided if
this property is undesirable.
This mode requires input plaintext to be a multiple of the block
size, which in this case of SM4 it is 128-bit. It also allows
multiple blocks to be computed in parallel.
8.3.1. SM4-ECB Encryption
Inputs:
o P, plaintext, length *MUST* be multiple of b
o K, SM4 128-bit encryption key
Output:
o C, ciphertext, length is a multiple of b
C is defined as follows.
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_____________________________________________________________________
n = NBlocks(P, b)
for i = 1 to n
C_i = SM4Encrypt(P_i, K)
end for
C = C_1 || ... || C_n
_____________________________________________________________________
8.3.2. SM4-ECB Decryption
Inputs:
o C, ciphertext, length *MUST* be multiple of b
o K, SM4 128-bit encryption key
Output:
o P, plaintext, length is a multiple of b
P is defined as follows.
_____________________________________________________________________
n = NBlocks(C, b)
for i = 1 to n
P_i = SM4Decrypt(C_i, K)
end for
P = P_1 || ... || P_n
_____________________________________________________________________
8.4. SM4-CBC
SM4-CBC is similar to SM4-ECB that the input plaintext *MUST* be a
multiple of the block size, which is 128-bit in SM4. SM4-CBC
requires an additional input, the IV, that is unpredictable for a
particular execution of the encryption process.
Since CBC encryption relies on a forward cipher operation that depend
on results of the previous operation, it cannot be parallelized.
However, for decryption, since ciphertext blocks are already
available, CBC parallel decryption is possible.
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8.4.1. SM4-CBC Encryption
Inputs:
o P, plaintext, length *MUST* be multiple of b
o K, SM4 128-bit encryption key
o IV, 128-bit, unpredictable, initialization vector
Output:
o C, ciphertext, length is a multiple of b
C is defined as follows.
_____________________________________________________________________
n = NBlocks(P, b)
C_1 = SM4Encrypt(P_1 xor IV, K)
for i = 2 to n
C_i = SM4Encrypt(P_i xor C_{i - 1}, K)
end for
C = C_1 || ... || C_n
_____________________________________________________________________
8.4.2. SM4-CBC Decryption
Inputs:
o C, ciphertext, length *MUST* be a multiple of b
o K, SM4 128-bit encryption key
o IV, 128-bit, unpredictable, initialization vector
Output:
o P, plaintext, length is multiple of b
P is defined as follows.
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_____________________________________________________________________
n = NBlocks(C, b)
P_1 = SM4Decrypt(C_1, K) xor IV
for i = 2 to n
P_i = SM4Decrypt(C_i, K) xor C_{i - 1}
end for
P = P_1 || ... || P_n
_____________________________________________________________________
8.5. SM4-CFB
SM4-CFB relies on feedback provided by successive ciphertext segments
to generate output blocks. The plaintext given must be a multiple of
the block size.
Similar to SM4-CBC, SM4-CFB requires an IV that is unpredictable for
a particular execution of the encryption process.
SM4-CFB further allows setting a positive integer parameter s, that
is less than or equal to the block size, to specify the size of each
data segment. The same segment size must be used in encryption and
decryption.
In SM4-CFB, since the input block to each forward cipher function
depends on the output of the previous block (except the first that
depends on the IV), encryption is not parallelizable. Decryption,
however, can be parallelized.
8.5.1. SM4-CFB Variants
SM4-CFB takes an integer s to determine segment size in its
encryption and decryption routines. We define the following variants
of SM4-CFB for various s:
o SM4-CFB-1, the 1-bit SM4-CFB mode, where s is set to 1.
o SM4-CFB-8, the 8-bit SM4-CFB mode, where s is set to 8.
o SM4-CFB-64, the 64-bit SM4-CFB mode, where s is set to 64.
o SM4-CFB-128, the 128-bit SM4-CFB mode, where s is set to 128.
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8.5.2. SM4-CFB Encryption
Inputs:
o P#, plaintext, length *MUST* be multiple of s
o K, SM4 128-bit encryption key
o IV, 128-bit, unpredictable, initialization vector
o s, an integer 1 <= s <= b that defines segment size
Output:
o C#, ciphertext, length is a multiple of s
C# is defined as follows.
_____________________________________________________________________
n = NBlocks(P#, s)
I_1 = IV
for i = 2 to n
I_i = LSB(b - s, I_{i - 1}) || C#_{j - 1}
end for
for i = 1 to n
O_j = SM4Encrypt(I_i, K)
end for
for i = 1 to n
C#_i = P#_1 xor MSB(s, O_j)
end for
C# = C#_1 || ... || C#_n
_____________________________________________________________________
8.5.3. SM4-CFB Decryption
Inputs:
o C#, ciphertext, length *MUST* be a multiple of s
o K, SM4 128-bit encryption key
o IV, 128-bit, unpredictable, initialization vector
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o s, an integer 1 <== s <== b that defines segment size
Output:
o P#, plaintext, length is multiple of s
P# is defined as follows.
_____________________________________________________________________
n = NBlocks(P#, s)
I_1 = IV
for i = 2 to n
I_i = LSB(b - s, I_{i - 1}) || C#_{j - 1}
end for
for i = 1 to n
O_j = SM4Encrypt(I_i, K)
end for
for i = 1 to n
P#_i = C#_1 xor MSB(s, O_j)
end for
P# = P#_1 || ... || P#_n
_____________________________________________________________________
8.6. SM4-OFB
SM4-OFB is the application of SM4 through the Output Feedback mode.
This mode requires that the IV is a nonce, meaning that the IV *MUST*
be unique for each execution for an input key. OFB does not require
the input plaintext to be a multiple of the block size.
In OFB, the routines for encryption and decryption are identical. As
each forward cipher function (except the first) depends on previous
results, both routines cannot be parallelized. However given a known
IV, output blocks could be generated prior to the input of plaintext
(encryption) or ciphertext (decryption).
8.6.1. SM4-OFB Encryption
Inputs:
o P, plaintext, composed of (n - 1) blocks of size b, with the last
block P_n of size 1 <== u <== b
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o K, SM4 128-bit encryption key
o IV, a nonce (a unique value for each execution per given key)
Output:
o C, ciphertext, composed of (n - 1) blocks of size b, with the last
block C_n of size 1 <== u <== b
C is defined as follows.
_____________________________________________________________________
n = NBlocks(P, b)
I_1 = IV
for i = 1 to (n - 1)
O_i = SM4Encrypt(I_i)
I_{i + 1} = O_i
end for
for i = 1 to (n - 1)
C_i = P_i xor O_i
end for
C_n = P_n xor MSB(u, O_n)
C = C_1 || ... || C_n
_____________________________________________________________________
8.6.2. SM4-OFB Decryption
Inputs:
o C, ciphertext, composed of (n - 1) blocks of size b, with the last
block C_n of size 1 <== u <== b
o K, SM4 128-bit encryption key
o IV, the nonce used during encryption
Output:
o P, plaintext, composed of (n - 1) blocks of size b, with the last
block P_n of size 1 <== u <== b
C is defined as follows.
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_____________________________________________________________________
n = NBlocks(C, b)
I_1 = IV
for i = 1 to (n - 1)
O_i = SM4Encrypt(I_i)
I_{i + 1} = O_i
end for
for i = 1 to (n - 1)
P_i = C_i xor O_i
end for
P_n = C_n xor MSB(u, O_n)
P = P_1 || ... || P_n
_____________________________________________________________________
8.7. SM4-CTR
SM4-CTR is an implementation of a stream cipher through a blockcipher
primitive. It generates a "keystream" of keys that are used to
encrypt successive blocks, with the keystream created from the input
key, a nonce (the IV) and an incremental counter. The counter could
be any sequence that does not repeat within the block size.
Both SM4-CTR encryption and decryption routines could be
parallelized, and random access is also possible.
8.7.1. SM4-CTR Encryption
Inputs:
o P, plaintext, composed of (n - 1) blocks of size b, with the last
block P_n of size 1 <== u <== b
o K, SM4 128-bit encryption key
o IV, a nonce (a unique value for each execution per given key)
o T, a sequence of counters from T_1 to T_n
Output:
o C, ciphertext, composed of (n - 1) blocks of size b, with the last
block C_n of size 1 <== u <== b
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C is defined as follows.
_____________________________________________________________________
n = NBlocks(P, b)
for i = 1 to n
O_i = SM4Encrypt(T_i)
end for
for i = 1 to (n - 1)
C_i = P_i xor O_i
end for
C_n = P_n xor MSB(u, O_n)
C = C_1 || ... || C_n
_____________________________________________________________________
8.7.2. SM4-CTR Decryption
Inputs:
o C, ciphertext, composed of (n - 1) blocks of size b, with the last
block C_n of size 1 <= u <= b
o K, SM4 128-bit encryption key
o IV, a nonce (a unique value for each execution per given key)
o T, a sequence of counters from T_1 to T_n
Output:
o P, plaintext, composed of (n - 1) blocks of size b, with the last
block P_n of size 1 <= u <= b
P is defined as follows.
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_____________________________________________________________________
n = NBlocks(C, b)
for i = 1 to n
O_i = SM4Encrypt(T_i)
end for
for i = 1 to (n - 1)
P_i = C_i xor O_i
end for
P_n = C_n xor MSB(u, O_n)
C = C_1 || ... || C_n
_____________________________________________________________________
9. Object Identifier
The Object Identifier for SM4 is identified through these OIDs.
9.1. GM/T OIDs
9.1.1. SCA OID Prefix
All SM4 GM/T OIDs belong under the "1.2.156.10197" OID prefix,
registered by the Chinese Cryptography Standardization Technology
Committee ("CCSTC"), a committee under the SCA. Its components are
described below in ASN.1 notation.
o "id-ccstc" "{iso(1) member-body(2) cn(156) ccstc(10197)}"
9.1.2. Blockcipher Algorithms
These SM4 OIDs are assigned in [GMT-0006-2012] and described in
[GBT.33560-2017].
"1.2.156.10197.1.100" for "Blockcipher Algorithms":
o "id-bc" "{id-ccstc sm-scheme(1) block-cipher(100)}"
"1.2.156.10197.1.104" for "Blockcipher Algorithm: SM4":
o "id-bc-sm4" "{id-ccstc sm-scheme(1) sm4(104)}"
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9.1.3. Standard Identification
The "SM4 Blockcipher Algorithm" standard is assigned the OID
"1.2.156.10197.6.1.1.2" in [GMT-0002-2012] and this assignment is
also described in [GBT.33560-2017].
o "id-standard-sm4" "{id-ccstc standard(1) fundamental(1)
algorithm(1) sm4(2)}"
Note that this OID is purely used for identifying the SM4 standard
itself.
9.2. ISO OID
SM4 is assigned the OID "1.0.18033.3.2.4" ("id-bc128-sm4") in
[ISO.IEC.18033-3.AMD2]. Its components are described below in ASN.1
notation.
o "is18033-3" "{iso(1) standard(0) is18033(18033) part3(3)}"
o "id-bc128" "{is18033-3 block-cipher-128-bit(2)}"
o "id-bc128-sm4" "{id-bc128 sm4(4)}"
10. Design Considerations
10.1. Basic Transformation
The chaos principle and the diffusion principle are two basic
principles of block cipher design. A well-designed blockcipher
algorithm should be based on a cryptographically sound basic
transformation structure, with its round calculation based on a
cryptographically sound basic transformation.
The cryptographic properties of the basic transformation determines
the efficiency of the resulting encryption transformation.
The SM4 algorithm is structured on orthomorphic permutation. Its
round transformation is an orthomorphic permutation, and its
cryptographic properties can be deduced from the characteristics of
orthomorphic permutations.
Let the single round of the SM4 block cipher algorithm be P, for any
given plaintext X, P (X, K ')! = P (X, K) if the key K'! = K.
The conclusion shows that if X is a row variable and K is a column
variable, the square P(X, K) forms a Latin square. There are two
conclusions about the nature of cryptography:
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1. The SM4 blockcipher algorithm will produce different round
transformations given different keys.
2. The SM4 blockcipher algorithm, within a single round, will
produce a different output given the same input with different
keys.
10.2. Nonlinear Transformation
An S-box can be viewed as a bijection:
S(X) = (f_1(X), f_2(X), ... , f_m(X)) : F_2^n -> F_2^m.
S(x): F_2^n -> F_2^m can be represented as a multi-output boolean
function with n-bit input and m-bit output, or a n x m S-box (an
S-box with n inputs and m outputs), usually realized as a
substitution that takes an n-bit input and produces a m-bit output.
In SM4, the S-box takes n = m = 8.
In many blockciphers, the S-box is the sole element providing
nonlinearity, for the purpose of mixing, in order to reduce linearity
and to hide its variable structure.
The cryptographic properties of the S-box directly affects the
resulting cryptographic strength of the blockcipher. When designing
a blockcipher, the cryptographic strength of the S-box must be taken
into account. The cryptographic strength of an S-box can be
generally measured by factors such as its nonlinearity and
differential distribution.
10.2.1. S-box Algebraic Expression
In order to prevent insertion attacks, the algebraic formula used for
cryptographic substitution should be a high degree polynomial and
contain a large number of terms.
The algebraic expression of the SM4 S-box [SM4-Sbox] is determined
through Lagrange's interpolation to be a polynomial of the 254th
degree with 255 terms, providing the highest level of complexity
based on its size:
f(x) : sum_{i=0}^{255} y_i
PI_{j!=i, j=0}^255 ((x - x_j) / (x_i - x_j))
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10.2.2. Algebraic Degree And Distribution Of Terms
Any n boolean function f(x): F_2^n -> F_2 can be represented uniquely
in its algebraic normal form shown below:
f(X) = a_0 + sum_{1<=i_i<...<i_k<=n, 1<=k<=n}
a_{i_1 i_2 ... i_k} x_{i_1} x_{i_2} ... x_{i_k}
X = (x_1, x_2, ..., x_n)
a_0, a_{i_1, i_2, ... i_k} element-of F_2
The "algebraic degree" of the n-boolean function f(X) is defined to
be the algebraic degree of the highest algebraic degree of its terms
with a nonzero coefficient in its ANF representation. The constant
of the i-th term of f(x) in ANF representation is called the i-th
term of f(X), the total number of all i-th (0<=i<=n) terms is called
the "number of terms" of f(X).
S(X) can be represented as a m-component function S(X) = (f_1(X),
f_2(X), ... f_m(X)): F_2^n -> F_2^m. Consider S(X) to be a random
substitution, each of its component functions would be best to have
algebraic degree of n-1, each component function i-th coefficient
should be near C_n^i/2. If the algebraic degree is too low, for
example, each component function has a degree of 2, then the
algorithm can be easily attacked by advanced differential
cryptanalysis. If the number of terms are insufficient, then it may
improve the success probability of insert attacks.
The algebraic degrees and number of terms of the SM4 S-box are
described in Figure 4.
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+--------------------+--------------------------------------------+
| | Algebraic Degree |
| Component Function +-----+---+----+----+----+----+----+---+-----+
| | 8 | 7 | 6 | 5 | 4 | 3 | 2 | 1 | 0 |
+--------------------+-----+---+----+----+----+----+----+---+-----+
| Y_0 | 0 | 3 | 15 | 31 | 28 | 29 | 14 | 3 | 1 |
| Y_1 | 0 | 3 | 12 | 34 | 40 | 33 | 12 | 4 | 1 |
| Y_2 | 0 | 5 | 17 | 24 | 40 | 24 | 11 | 3 | 0 |
| Y_3 | 0 | 2 | 11 | 31 | 34 | 27 | 15 | 5 | 1 |
| Y_4 | 0 | 5 | 15 | 28 | 33 | 24 | 13 | 5 | 0 |
| Y_5 | 0 | 5 | 11 | 25 | 41 | 25 | 16 | 4 | 1 |
| Y_6 | 0 | 4 | 15 | 29 | 27 | 32 | 18 | 4 | 1 |
| Y_7 | 0 | 4 | 14 | 32 | 35 | 30 | 16 | 3 | 0 |
+--------------------+-----+---+----+----+----+----+----+---+-----+
| Expected Value | 1/2 | 4 | 14 | 28 | 35 | 28 | 14 | 4 | 1/2 |
+--------------------+-----+---+----+----+----+----+----+---+-----+
Figure 4: SM4 S-box Component Functions Algebraic Degree And Terms
10.2.3. Differential Distribution
The definition of differential distribution has been given in
[BC-Design].
Differential cryptanalysis is a chosen-plaintext attack, with the
understanding that analysis of selected plaintexts of differentials
can retrive the most probable key. Differential distribution is an
attribute to measure the resistance of a cryptographic function
against differential cryptanalysis.
delta_S = 1/2^n max_{a in F_2^n, a!=0} max_{beta in F_2^m} |
{ X in F_2^n : S(X and alpha) - S(X) = beta } |
"delta_S" is the differential distribution of the S-box "S".
According to the definition of differential distribution, 2^{-m} <=
delta_S <= 2^{m-n}, if there is a delta_S = 2^{m-n} then S is
considered a fully nonlinear function from F_2^n to F_2^m. For
resistance against differential cryptanalysis, the differential
distribution should be as low as possible.
The highest differential distribution of the SM4 S-box is 2^{-6},
meaning it has a good resistance against differential cryptanalysis.
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10.2.4. Nonlinearity
The nonlinearity of an S-box is described by [BC-Design].
Let S(X) = (f_1(X), f_2(X), ... , f_m(X)) : F_2^n -> F_2^m be a
multi-output function. The nonlinearity of S(X) is defined as N_S =
min_{l in L_n, 0 != u in F_2^m} d_H (u . S(X), l(X)).
L_n is the group of all n-boolean functions, d_H(f, l) is the Hamming
distance between f and l. The nonlinearity of the S-box is in fact
the minimum Hamming distance between all the Boolean functions and
all affine functions.
The upper-bound of nonlinearity is known to be 2^{n-1} - 2^{n/2 - 1},
where a Boolean function that reaches this bound is called a "bent
function".
The nonlinearity of a Boolean function is used to measure resistance
against linear attacks. The higher the nonlinearity, the higher
resistance that the Boolean function f(x) has against linear attacks.
On the contrary, the lower the nonlinearity, the Boolean function
f(x) has lower resistance against linear attacks.
The nonlinearity of the SM4 S-box is 112.
10.2.5. Maximum Linearity Advantage
Linear approximation of a S-box is defined in [BC-Design]. Given a
S-box with n inputs and m outputs, any linear approximation can be
represented as : a . X = b . Y, where a in F_2^n, b in F_2^m.
The probability p that satisfies a . X = b . Y is
| p - 1/2 | <= 1/2 - N_S / 2^n
where | p - 1/2 | is the advantage of the linear approximation
equation, lambda_S = 1/2 - N_s / 2^n is the maximum advantage of the
S-box.
The maximum advantage of the SM4 S-box is 2^{-4}.
10.2.6. Balance
A S-box S(X) = (f_1(X), f_2(X), ... , f_m(X)) : F_2^n -> F_2^m is
considered "balanced" if for any beta in F_2^m, there are 2^{n-m} x
in F_2^n, such that S(x) = beta.
The SM4 S-box is balanced.
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10.2.7. Completness and Avalanche Effect
A S-box S(X) = (f_1(X), f_2(X), ... , f_m(X)) : F_2^n -> F_2^m is
considered "complete" if every input bit directly correlates to an
output bit.
In algebraic expression, each component function contains the unknown
variables x_1, x_2, ... x_n, such that for any (s, t) in { (i, j) | 1
<= i <= n, 1 <= j <= m}, there is an X that S(X) and S(X and e_s)
would contain a different bit t.
Avalanche effect refers to a single bit change in the input would
correspond to a change of half of the output bits.
The SM4 S-box satisfies completness and the avalanche effect.
10.3. Linear Transform
Linear transformation is used to provide diffusion in SM4. A
blockcipher algorithm often adopts m x m S-boxes to form an
obfuscation layer.
Since the m-bits output by one S-box are only related to the m bits
of its input and are irrelevant to the input of other S boxes, the
introduction of a linear transform would disrupt and mix the output
m-bits so that they seem correlating to the other S-box inputs.
A sound linear transform design will diffuse the S-box output,
allowing the blockcipher to resist differential and linear
cryptanalysis.
An important measure of the diffusivity of a linear transform is its
branch number.
The "branch number" of a linear transform is defined in [BC-Design]:
B(theta) = min_{x!=0} w_b(x) + w_b(theta(x))
Where B(theta) is the branch number of transform theta, w_b(x) is a
non-zero integer x_i (1 <== i <== m), and x_i is called the "bundle
weight".
The branch number can be used to quantify the resistance of the block
cipher algorithm to differential cryptanalysis and linear
cryptanalysis.
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Similar to differential cryptanalysis and linear cryptanalysis, the
differential branch number and linear branch number of theta can be
defined as follows.
The differential branch number of theta is:
B_d(theta) = min_{x, x!= x*}
(w_b(x and x*) + w_b(theta(x)) and theta(x*))
The linear branch number of theta is:
B_l(theta) = min_{a, b, c (x . alpha^t , theta(x) . beta) != 0}
(w_b(alpha) + w_b(beta))
where,
c (x . a^t , theta(x) . beta) =
2 X Pr(x . alpha^t = theta(x) . beta) - 1
x . alpha^t is a matrix multiplication.
The branch number in a linear transformation reflects its
diffusivity. The higher the branch number, the better the diffusion
effect.
This means that the larger the differential branch number or linear
branch number, the more known plaintexts will be required for
differential or linear cryptanalysis respectively.
The linear transform differential branch number and linear branch
number of SM4 are both 5.
10.4. Key Expansion Algorithm
The SM4 key schedule is designed to fulfill the security requirements
of the encryption algorithm and achieve ease of implementation for
performance reasons.
All subkeys are derived from the encryption key, and therefore,
subkeys are always statistically relevant. In the context of a
blockcipher, it is not possible to have non-statistical-correlated
subkeys, but the designer can only aim to have subkeys achieve near
statistical independence [BC-Design].
The purpose of the key schedule, generated through the key expansion
algorithm, is to mask the statistical correlation between subkeys to
make this relationship difficult to exploit.
The SM4 key expansion algorithm satisfies the following design
criteria:
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1. There are no obvious statistical correlation between subkeys;
2. There are no weak subkeys;
3. The speed of key expansion is not slower than the encryption
algorithm, and uses less resources;
4. Every subkey can be directly generated from the encryption key.
11. Cryptanalysis Results
SM4 has been heavily cryptanalyzed by international researchers since
it was first published. Nearly all currently known cryptanalysis
techniques have been applied to SM4.
At the time of publishing this document, there are no known practical
attacks against the full SM4 blockcipher. However, there are side-
channel concerns [SideChannel] when the algorithm is implemented in a
hardware device.
A summary of cryptanalysis results are presented in the following
sections.
11.1. Differential Cryptanalysis
In 2008, Zhang et al. [SM4-DiffZhang1] gave a 21-round differential
analysis with data complexity 2^188, time complexity 2^126.8
encryptions.
In 2008, Kim et al. [SM4-LDA] gave a 22-round differential attack
that requires 2^118 chosen plaintexts, 2^123 memory and 2^125.71
encryptions.
In 2009, Zhang et al. (differing author but overlapping team)
[SM4-DiffZhang2] gave a 18-round differential characteristics with an
attack that reaches the 22nd round, with data complexity 2^117 and
time complexity 2^112.3.
In 2010, Zhang et al. (with no relation to above) [SM4-DiffZhang3]
utilized 18-round differential characteristics for the 22nd round
with 2^117 chosen plaintexts with time complexity 2^123 encryptions,
memory complexity of 2^112.
In 2011, Su et al. [SM4-DiffSu] gave a 19 round differential
characteristics and pushed their attack to the 23rd round, with data
complexity of 2^118 chosen plaintexts, time complexity 2^126.7
encryptions, and memory complexity 2^120.7.
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11.2. Linear Cryptanalysis
In 2008 Etrog et al. [SM4-LinearEtrog] provided a linear
cryptanalysis result for 22 rounds of SM4, the data complexity is
given as 2^188.4 known plaintexts, time complexity 2^117 encrypt
operations.
In the same year, Kim et al. [SM4-LDA] improved on the linear
cryptanalysis result for 22 rounds of SM4 with data complexity of
2^117 known plaintexts, memory complexity of 2^109 and time
complexity of 2^109.86.
In 2011 Dong [SM4-LinearDong] presented a linear cryptanalysis result
for 20 rounds, 2^110.4 known ciphertexts, 2^106.8 encryption
operations, memory complexity 2^90.
In 2014 Liu et al. [SM4-LinearLiu] presented their linear
cryptanalysis for 23-rounds of SM4, time complexity 2^112 encryption
operations, data complexity 2^126.54 known ciphertexts, memory
complexity 2^116.
In 2017 Liu et al. [SM4-NLC] presented an attack based on linear
cryptanalysis on 24-rounds of SM4, with time complexity of 2^122.6
encryptions, data complexity of 2^122.6 known ciphertexts, and memory
complexity of 2^85.
11.3. Multi-dimensional Linear Cryptanalysis
In 2010, Liu et al. [SM4-MLLiu] constructed a series of 18 rounds of
linear traces based on a 5-round circular linear trace, capable of
attacking 22 rounds of SM4. The required data complexity was 2^112
known plaintexts, time complexity 2^124.21 encryption operations,
with memory complexity of 2^118.83.
In 2010 Cho et al. [SM4-MLCho] gave a linear analysis of 23 rounds
of SM4 with a data complexity of 2^126.7 known plaintexts and a time
complexity of 2^127, memory complexity of 2^120.7.
In 2014, Liu et al. [SM4-LinearLiu] gave the results of multi-
dimensional linear analysis of 23 rounds of SM4 algorithm. The time
complexity was 2^122.7, data complexity was 2^122.6 known plaintext
with memory complexity 2^120.6.
11.4. Impossible Differential Cryptanalysis
In 2007 Lu et al. [SM4-IDCLu] first presented 16 rounds of
impossible differential analysis of SM4 with the required data
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complexity 2^105 chosen plaintexts, time complexity 2^107 encryption
operations.
In 2008 Toz et al. [SM4-IDCToz] revised the results of [SM4-IDCLu],
that the data complexity is actually 2^117.05 chosen plaintexts, time
complexity 2^132.06 encryptions, but its complexity is already beyond
the 2^128 limit.
In 2010 Wang et al. [SM4-IDCWang] pushed the impossible differential
cryptanalysis to 17 rounds of SM4, the data complexity is 2^117
chosen ciphertexts, time complexity 2^132 memory queries.
11.5. Zero-correlation Linear Cryptanalysis
In 2015 Ma et al. [SM4-ZCLC] gives the results of multi-dimensional
zero-correlation linear cryptanalysis of a 14-round SM4 algorithm.
The required data complexity is 2^123.5 known plaintexts, time
complexity is 2^120.7 encryption operations and memory complexity of
2^73 blocks.
11.6. Integral Cryptanalysis
In 2007 Liu et al. [SM4-ICLiu] first gave a 13-round integral
analysis of SM4, which required 2^16 chosen plaintexts and time
complexity of 2^114 encryption operations.
In 2008 Zhong et al. [SM4-ICZhong] constructed a 12-round
distinguisher of SM4 to attack 14-round SM4, with data complexity of
2^32 chosen plaintexts and time complexity 2^96.5 encryptions.
11.7. Algebraic Attacks
In 2009 Ji et al. [SM4-AAJi] and in 2010 Erickson et al. [SM4-AAEr]
utilized algebraic methods such as XL, Groebner base and SAT to
analyze the resistance of SM4 against algebraic attacks. The results
demonstrate that SM4 is safe against algebraic attacks, and
specifically, has a higher resistance against algebraic attacks than
AES.
11.8. Matrix Attacks
In 2007 Lu et al. [SM4-IDCLu] provided a matrix attack against
14-round SM4, with data complexity 2^121.82 chosen plaintexts, time
complexity 2^116.66 encryptions.
In 2008 Toz et al. [SM4-IDCToz] lowered both data and time
complexity of the aformentioned attack to 2^106.89 chosen ciphertexts
and time complexity of 2^107.89.
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In 2008, Zhang et al. [SM4-DiffZhang1] provided a matrix attack
against 16-round SM4, which required a data complexity of 2^125
chosen plaintexts and time complexity of 2^116 encryptions.
She's Master dissertation [SM4-MatrixShe] provided a SM4 16-round
matrix distinguisher that can attack 18-round SM4, with data
complexity of 2^127 chosen plaintexts and time complexity 2^110.77
encryptions with memory complexity of 2^130.
In 2012 Wei et al. [SM4-MatrixWei] applied differential analysis and
algebraic attack techniques on 20-round SM4 and discovered that the
combined attack results on 20-round SM4 are superior than using pure
differential cryptanalysis.
11.9. Provable Security Against Differential And Linear Cryptanalysis
SM4 uses a novel structure differing from the general Feistel and SP
structures.
[SM4-Random] has proven that the SM4 non-balanced Feistel structure
is pseudo-random.
[SM4-SLDC] analyzes the SM4 non-balanced Feistel structure on its
resistance against differential and linear cryptanalysis techniques.
Under SP type round functions with branch number 5, it is proven that
in a 27-round SM4 guarantees at least 22 active S-boxes, therefore
SM4 is secure against differential attacks.
[SM4-SLC] has analyzed resistance of SM4 against linear
cryptanalysis.
11.10. Provable Security Against Related-Key Differential Cryptanalysis
Related-key differential cryptanalysis is related to the encryption
algorithm and key schedule. When performing a related-key attack,
the attacker simultaneously insert differences in both the key and
the message.
In [AutoDC], Sun et al. proposed an automated differential route
search method based on MILP (mixed-integer linear programming) that
can be used to assess the security bounds of a blockcipher under
(related-key) differential cryptanalysis.
[SM4-RKDC] describes the lower bounds of active S-boxes within SM4
and is shown in Table 1.
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+-------+------------+-------------+
| Round | Single Key | Related Key |
+-------+------------+-------------+
| 3 | 0 | 0 |
| 4 | 1 | 1 |
| 5 | 2 | 2 |
| 6 | 2 | 4 |
| 7 | 5 | 6 |
| 8 | 6 | 8 |
| 9 | 7 | 9 |
| 10 | 8 | 10 |
| 11 | 9 | 11 |
| 12 | 10 | 13 |
| 13 | 10 | 14 |
| 14 | 10 | 14 |
| 15 | 13 | 16 |
| 16 | 14 | 18 |
| 17 | 15 | 19 |
| 18 | 16 | 20 |
| 19 | 18 | 22 |
| 20 | 18 | - |
| 21 | 19 | - |
| 22 | 20 | - |
| 23 | 22 | - |
| 24 | 23 | - |
| 25 | 23 | - |
| 26 | 24 | - |
+-------+------------+-------------+
Table 1: Strongest SM4 Attacks ("-" denotes unknown)
As the maximal probability of the SM4 S-box is 2^-6, when the minimum
active S-boxes reach 22 the differential characteristics will have
probability 2^132, which is higher than enumeration (2^128).
This indicates that 19 rounds and 23 rounds under related key and
single key settings will provide a minimum of 22 active S-boxes and
is able to resist related-key differential attacks.
11.11. Summary of SM4 Cryptanalytic Attacks
Table 2 provides a summary on the strongest attacks on SM4 at the
time of publishing.
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+-------------------+--------+--------------------+-----------------+
| Method | Rounds | Complexity | Reference |
+-------------------+--------+--------------------+-----------------+
| Linear | 24 | Time: 2^{122.6}, | [SM4-NLC] |
| | | Data: 2^{122.6}, | |
| | | Memory: 2^{85} | |
+-------------------+--------+--------------------+-----------------+
| Multi-dimensional | 23 | Time: 2^{122.7}, | [SM4-LinearLiu] |
| Linear | | Data: 2^{122.6}, | |
| | | Memory: 2^{120.6} | |
+-------------------+--------+--------------------+-----------------+
| Differential | 23 | Time: 2^{126.7}, | [SM4-DiffSu] |
| | | Data: 2^{117}, | |
| | | Memory: 2^{120.7} | |
+-------------------+--------+--------------------+-----------------+
| Matrix | 18 | Time: 2^{110.77}, | [SM4-MatrixShe] |
| | | Data: 2^{127}, | |
| | | Memory 2^{130} | |
+-------------------+--------+--------------------+-----------------+
| Impossible | 17 | Time: 2^{132}, | [SM4-IDCWang] |
| Differential | | Data: 2^{117}, | |
| | | Memory: -- | |
+-------------------+--------+--------------------+-----------------+
| Zero-correlation | 14 | Time: 2^{120.7}, | [SM4-ZCLC] |
| Linear | | Data: 2^{123.5}, | |
| | | Memory: 2^{73} | |
+-------------------+--------+--------------------+-----------------+
| Integral | 14 | Time: 2^{96.5}, | [SM4-ICZhong] |
| | | Data: 2^{32}, | |
| | | Memory: -- | |
+-------------------+--------+--------------------+-----------------+
Table 2: Leading SM4 Attacks As Of Publication
As of the publication of this document, no open research results have
provided a method to successfully attack beyond 24 rounds of SM4.
The traditional view suggests that SM4 provides an extra safety
margin compared to blockciphers adopted in [ISO.IEC.18033-3] that
already have full-round attacks, including MISTY1 [MISTY1-IC]
[MISTY1-270] and AES [AES-CA] [AES-BC] [AES-RKC].
12. Security Considerations
o Products and services that utilize cryptography are regulated by
the SCA [SCA]; they must be explicitly approved or certified by
the SCA before being allowed to be sold or used in China.
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o SM4 is a blockcipher symmetric algorithm with key length of 128
bits. It is considered as an alternative to AES-128
[NIST.FIPS.197].
o SM4 [GBT.32907-2016] is a blockcipher certified by the SCA [SCA].
No formal proof of security is provided. There are no known
practical attacks against SM4 algorithm by the time of publishing
this document, but there are security concerns with regards to
side-channel attacks when the SM4 algorithm is implemented in
hardware.
For instance, [SM4-Power] illustrated an attack by measuring the
power consumption of the device. A chosen ciphertext attack,
assuming a fixed correlation between the round keys and data mask,
is able to recover the round key successfully.
When the SM4 algorithm is implemented in hardware, the parameters
and keys *SHOULD* be randomly generated without fixed correlation.
There have also been improvements to the hardware embodiment
design for SM4 [SM4-VLSI] [SM4-FPGA], white-box implementions
[SM4-WhiteBox], and performance enhancements [SM4-HiSpeed], that
may resist such attacks.
o The IV does not have to be secret. The IV itself, or criteria
enough to determine it, *MAY* be transmitted with ciphertext.
o SM4-ECB: ECB is one of the four original modes defined for DES.
With its problem well known to "leak quite a large amount of
information" [BC-EVAL], it *SHOULD NOT* be used in most cases.
o SM4-CBC, SM4-CFB, SM4-OFB: CBC, CFB and OFB are IV-based modes of
operation originally defined for DES.
When using these modes of operation, the IV *SHOULD* be random to
preserve message confidentiality [BC-EVAL]. It is shown in the
same document that CBC, CFB, OFB, the variants #CBC, #CFB that
utilize the recommendation of [NIST.SP.800-38A] to make CBC and
CFB nonce-based, are SemCPA secure as probabilistic encryption
schemes.
Various attack scenarios have been described in [BC-EVAL] and
these modes *SHOULD NOT* be used unless for compatibility reasons.
o SM4-CTR: CTR is considered to be the "best" mode of operation
within [NIST.SP.800-38A] as it is considered SemCPA secure as a
nonce-based encryption scheme, providing provable-security
guarantees as good as the classic modes of operation (ECB, CBC,
CFB, OFB) [BC-EVAL].
Users with no need of authenticity, non-malleablility and chosen-
ciphertext (CCA) security *MAY* utilize this mode of operation
[BC-EVAL].
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13. IANA Considerations
This document does not require any action by IANA.
14. References
14.1. Normative References
[GBT.32907-2016]
Standardization Administration of the People's Republic of
China, "GB/T 32907-2016: Information security technology
-- SM4 block cipher algorithm", August 2016,
<http://www.gb688.cn/bzgk/gb/
newGbInfo?hcno=7803DE42D3BC5E80B0C3E5D8E873D56A>.
[ISO.IEC.18033-3.AMD2]
International Organization for Standardization, "ISO/IEC
WD1 18033-3/AMD2 -- Encryption algorithms -- Part 3: Block
ciphers -- Amendment 2", June 2017,
<https://www.iso.org/standard/54531.html>.
[RFC2119] Bradner, S., "Key words for use in RFCs to Indicate
Requirement Levels", BCP 14, RFC 2119,
DOI 10.17487/RFC2119, March 1997,
<https://www.rfc-editor.org/info/rfc2119>.
[RFC8174] Leiba, B., "Ambiguity of Uppercase vs Lowercase in RFC
2119 Key Words", BCP 14, RFC 8174, DOI 10.17487/RFC8174,
May 2017, <https://www.rfc-editor.org/info/rfc8174>.
14.2. Informative References
[AES-BC] Bogdanov, A., Khovratovich, D., and C. Rechberger,
"Biclique Cryptanalysis of the Full AES", 2011,
<https://doi.org/10.1007/978-3-642-25385-0_19>.
[AES-CA] Ferguson, N., Kelsey, J., Lucks, S., Schneier, B., Stay,
M., Wagner, D., and D. Whiting, "Improved Cryptanalysis of
Rijndael", Jan 2002,
<https://doi.org/10.1007/3-540-44706-7_15>.
[AES-RKC] Biryukov, A. and D. Khovratovich, "Related-Key
Cryptanalysis of the Full AES-192 and AES-256", 2009,
<https://doi.org/10.1007/978-3-642-10366-7_1>.
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[AutoDC] Siwei, S., Hu, L., Wang, P., Qiao, K., Ma, X., and L.
Song, "Automatic Security Evaluation and (Related-key)
Differential Characteristic Search: Application to SIMON,
PRESENT, LBlock, DES(L) and Other Bit-Oriented Block
Ciphers", 2014,
<https://doi.org/10.1007/978-3-662-45611-8_9>.
[BC-Design]
Wu, W., "Block Cipher Design and Analysis (in Chinese)",
October 2009, <http://www.tup.tsinghua.edu.cn/booksCenter/
book_03193701.html>.
[BC-EVAL] Rogaway, P., "Evaluation of Some Blockcipher Modes of
Operation", February 2011,
<http://web.cs.ucdavis.edu/rogaway/papers/modes.pdf>.
[BOTAN] Lloyd, J., "Botan: Crypto and TLS for C++11", October
2017, <https://botan.randombit.net>.
[GB.15629.11-2003]
Standardization Administration of the People's Republic of
China, "Information technology -- Telecommunications and
information exchange between systems -- Local and
metropolitan area networks -- Specific requirements --
Part 11: Wireless LAN Medium Access Control (MAC) and
Physical Layer (PHY) Specifications", May 2003,
<http://www.gb688.cn/bzgk/gb/
newGbInfo?hcno=74B9DD11287E72408C19C4D3A360D1BD>.
[GBT.33560-2017]
Standardization Administration of the People's Republic of
China, "GB/T 33560-2017: Information security technology
-- Cryptographic application identifier criterion
specification", May 2017, <http://www.gb688.cn/bzgk/gb/
newGbInfo?hcno=252CF0F72A7BE339A56DEA7D774E8994>.
[GMT-0002-2012]
Office of State Commercial Administration of China, "GM/T
0002-2012: SM4 block cipher algorithm", March 2012,
<http://www.oscca.gov.cn/Column/Column_32.htm>.
[GMT-0006-2012]
Office of State Commercial Administration of China, "GM/T
0006-2012: Cryptographic Application Identifier Criterion
Specification", March 2012,
<http://www.oscca.gov.cn/Column/Column_32.htm>.
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[ISO.IEC.18033-3]
International Organization for Standardization, "ISO/IEC
18033-3:2010 -- Encryption algorithms -- Part 3: Block
ciphers", December 2017,
<https://www.iso.org/standard/54531.html>.
[LSW-Bio] Sun, M., "Lv Shu Wang -- A life in cryptography", November
2010,
<http://press.ustc.edu.cn/sites/default/files/fujian/field
_fujian_multi/20120113/%E5%90%95%E8%BF%B0%E6%9C%9B%20%E5%A
F%86%E7%A0%81%E4%B8%80%E6%A0%B7%E7%9A%84%E4%BA%BA%E7%94%9F
.pdf>.
[MISTY1-270]
Bar-On, A. and N. Keller, "A 2^{70} Attack on the Full
MISTY1", 2016,
<https://doi.org/10.1007/978-3-662-53018-4_16>.
[MISTY1-IC]
Todo, Y., "Integral Cryptanalysis on Full MISTY1", 2015,
<https://doi.org/10.1007/s00145-016-9240-x>.
[NIST.FIPS.197]
National Institute of Standards and Technology, "NIST FIPS
197: Advanced Encryption Standard (AES)", November 2001,
<https://doi.org/10.6028/NIST.FIPS.197>.
[NIST.SP.800-38A]
Dworkin, M., "NIST Special Publication 800-38A:
Recommendation for Block Cipher Modes of Operation --
Methods and Techniques", December 2001,
<http://dx.doi.org/10.6028/NIST.SP.800-38A>.
[OPENSSL] OpenSSL Software Foundation, "OpenSSL: Cryptography and
SSL/TLS Toolkit", October 2017, <https://www.openssl.org>.
[SCA] State Cryptography Administration of China, "State
Cryptography Administration of China", Dec 2017,
<http://www.sca.gov.cn>.
[SideChannel]
Lei, Q., Wu, L., Zhang, S., Zhang, X., Li, X., Pan, L.,
and Z. Dong, "Software Hardware Co-design for Side-Channel
Analysis Platform on Security Chips", December 2015,
<https://doi.org/10.1109/CIS.2015.102>.
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[SM4] Office of State Commercial Administration of China, "SMS4
Cryptographic Algorithm For Wireless LAN Products",
January 2006,
<http://www.oscca.gov.cn/UpFile/200621016423197990.pdf>.
[SM4-AAEr]
Erickson, J., Ding, J., and C. Christensen, "Algebraic
Cryptanalysis of SMS4: Groebner Basis Attack and SAT
Attack Compared", 2010,
<https://doi.org/10.1007/978-3-642-14423-3_6>.
[SM4-AAJi]
Wen, J., Lei, H., and H. Ou, "Algebraic Attack to SMS4 and
the Comparison with AES", 2009,
<https://doi.org/10.1109/IAS.2009.171>.
[SM4-Details]
Lu, S., Su, B., Peng, P., Miao, Y., and L. Huo, "Overview
on SM4 Algorithm", October 2016,
<http://ris.sic.gov.cn/EN/Y2016/V2/I11/995>.
[SM4-DiffSu]
Su, B., Wu, W., and W. Zhang, "Security of the SMS4 Block
Cipher Against Differential Cryptanalysis", January 2011,
<https://doi.org/10.1007/s11390-011-9420-y>.
[SM4-DiffZhang1]
Zhang, L., Zhang, W., and W. Wu, "Cryptanalysis of
Reduced-Round SMS4 Block Cipher", July 2008,
<https://doi.org/10.1007/978-3-540-70500-0_16>.
[SM4-DiffZhang2]
Zhang, W., Wu, W., Feng, D., and B. Su, "Some New
Observations on the SMS4 Block Cipher in the Chinese WAPI
Standard", 2009,
<https://doi.org/10.1007/978-3-642-00843-6_28>.
[SM4-DiffZhang3]
Zhang, M., Liu, J., and X. Wang, "22-Round SMS4
Differential Cryptanalysis", 2010,
<http://www.airitilibrary.com/Publication/alDetailedMesh?d
ocid=05296579-201003-201004120040-201004120040-43-47>.
[SM4-En] Diffie, W. and G. Ledin, "SMS4 Encryption Algorithm for
Wireless Networks", May 2008,
<https://eprint.iacr.org/2008/329>.
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[SM4-FPGA]
Cheng, H., Zhai, S., Fang, L., Ding, Q., and C. Huang,
"Improvements of SM4 Algorithm and Application in Ethernet
Encryption System Based on FPGA", July 2014,
<https://www.researchgate.net/publication/287081686_Improv
ements_of_SM4_algorithm_and_application_in_Ethernet_encryp
tion_system_based_on_FPGA>.
[SM4-HiSpeed]
Lv, Q., Li, L., and Y. Cao, "High-speed Encryption
Decryption System Based on SM4", July 2016,
<http://dx.doi.org/10.14257/ijsia.2016.10.9.01>.
[SM4-ICLiu]
Liu, F., Ji, W., Hu, L., Ding, J., Lv, S., Pyshkin, A.,
and R. Weinmann, "Analysis of the SMS4 Block Cipher",
2007, <https://doi.org/10.1007/978-3-540-73458-1_13>.
[SM4-ICZhong]
Zhong, M., Hu, Y., and J. Chen, "14-Round Square Attack on
Blockcipher SMS4", 2008, <http://www.cnki.com.cn/Article/
CJFDTotal-XDKD200801019.htm>.
[SM4-IDCLu]
Lu, J., "Attacking Reduced-Round Versions of the SMS4
Block Cipher in the Chinese WAPI Standard", 2007,
<https://doi.org/10.1007/978-3-540-77048-0_24>.
[SM4-IDCToz]
Toz, D. and O. Dunkelman, "Analysis of Two Attacks on
Reduced-Round Versions of the SMS4", 2008,
<https://doi.org/10.1007/978-3-540-88625-9_10>.
[SM4-IDCWang]
Wang, G., "Improved Impossible Differential Cryptanalysis
on SMS4", October 2010,
<https://doi.org/10.1109/CIS.2012.116>.
[SM4-LDA] Kim, T., Kim, J., Kim, S., and J. Sung, "Linear and
Differential Cryptanalysis of Reduced SMS4 Block Cipher",
June 2008, <https://eprint.iacr.org/2008/281>.
[SM4-LinearDong]
Dong, X., "Security Analysis of the blockciphers AES and
SM4", 2011, <http://kns.cnki.net/KCMS/detail/detail.aspx?d
bcode=CDFD&dbname=CDFD1214&filename=1013114416.nh>.
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[SM4-LinearEtrog]
Etrog, J. and M. Robshaw, "The Cryptanalysis of Reduced-
Round SMS4", 2009,
<https://doi.org/10.1007/978-3-642-04159-4_4>.
[SM4-LinearLiu]
Liu, M. and J. Chen, "Improved Linear Attacks on the
Chinese Block Cipher Standard", November 2014,
<https://doi.org/10.1007/s11390-014-1495-9>.
[SM4-MatrixShe]
Ping, S., "Matrix Attack On Blockcipher SMS4", 2012,
<http://cdmd.cnki.com.cn/Article/
CDMD-10422-1012464969.htm>.
[SM4-MatrixWei]
Wei, H., Cui, H., and X. Lu, "Differential-Algebraic
Analysis of the SMS4 Block Cipher", 2012,
<http://www.cnki.com.cn/Article/
CJFDTotal-CDDD201202017.htm>.
[SM4-MLCho]
Cho, J. and K. Nyberg, "Improved linear cryptanalysis of
SM4 block cipher", 2010, <https://scholar.google.com.hk/
scholar?cluster=13432379689578293076>.
[SM4-MLLiu]
Zhiqiang, L., Dawu, G., and Z. Jing, "Multiple Linear
Cryptanalysis of Reduced-Round SMS4 Block Cipher", 2010,
<http://citeseerx.ist.psu.edu/viewdoc/
summary?doi=10.1.1.215.8314>.
[SM4-NLC] Liu, Y., Liang, H., Wang, W., and M. Wang, "New Linear
Cryptanalysis of Chinese Commercial Block Cipher Standard
SM4", June 2017, <https://doi.org/10.1155/2017/1461520>.
[SM4-Power]
Du, Z., Wu, Z., Wang, M., and J. Rao, "Improved chosen-
plaintext power analysis attack against SM4 at the round-
output", October 2015,
<http://dx.doi.org/10.6028/NIST.FIPS.180-4>.
[SM4-Random]
Zhang, L. and W. Wu, "Pseudorandomness and Super-
pseudorandomness of a non-balanced Feistel Structure using
compressed functions", January 2009,
<http://www.cnki.com.cn/Article/
CJFDTOTAL-JSJX200907008.htm>.
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[SM4-RKDC]
Zhang, J., Wu, W., and Y. Zheng, "Security of SM4 Against
(Related-Key) Differential Cryptanalysis", November 2016,
<http://doi.org/10.1007/978-3-319-49151-6_5>.
[SM4-Sbox]
Liu, J., Wei, B., and X. Dai, "Cryptographic Properties of
S-box in SMS4", January 2011,
<http://www.cnki.com.cn/Article/
CJFDTotal-JSJC200805057.htm>.
[SM4-SLC] Zhang, B. and J. Chenhui, "Practical security against
linear cryptanalysis for SMS4-like ciphers with SP round
function", 2012,
<https://doi.org/10.1007/s11432-011-4448-8>.
[SM4-SLDC]
Zhang, M., Liu, Y., Liu, J., and X. Min, "Practically
Secure against Differential Cryptanalysis for Block Cipher
SMS4", 2011, <http://www.ajetr.org/vol15/no1/n09.pdf>.
[SM4-VLSI]
Yu, S., Li, K., Li, K., Qin, Y., and Z. Tong, "A VLSI
implementation of an SM4 algorithm resistant to power
analysis", July 2016,
<https://doi.org/10.3233/JIFS-169011>.
[SM4-WhiteBox]
Bai, K. and C. Wu, "A secure white-box SM4
implementation", May 2008,
<http://dx.doi.org/10.1002/sec.1394>.
[SM4-ZCLC]
Ma, M., Zhao, Y., Liu, Q., and F. Liu, "Multidimensional
Zero-correlation Linear Cryptanalysis on SMS4 Algorithm",
September 2015,
<http://www.jcr.cacrnet.org.cn:8080/mmxb/CN/abstract/
abstract105.shtml>.
Appendix A. Appendix A: Example Calculations
A.1. Examples From GB/T 32907-2016
A.1.1. Example 1 (GB/T 32907-2016 Example 1 Encryption)
This is example 1 provided by [GBT.32907-2016] to demonstrate
encryption of a plaintext.
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Plaintext:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
Encryption key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
Status of the round key (rk_i) and round output (X_i) per round:
rk_0 = F12186F9 X_4 = 27FAD345
rk_1 = 41662B61 X_5 = A18B4CB2
rk_2 = 5A6AB19A X_6 = 11C1E22A
rk_3 = 7BA92077 X_7 = CC13E2EE
rk_4 = 367360F4 X_8 = F87C5BD5
rk_5 = 776A0C61 X_9 = 33220757
rk_6 = B6BB89B3 X_10 = 77F4C297
rk_7 = 24763151 X_11 = 7A96F2EB
rk_8 = A520307C X_12 = 27DAC07F
rk_9 = B7584DBD X_13 = 42DD0F19
rk_10 = C30753ED X_14 = B8A5DA02
rk_11 = 7EE55B57 X_15 = 907127FA
rk_12 = 6988608C X_16 = 8B952B83
rk_13 = 30D895B7 X_17 = D42B7C59
rk_14 = 44BA14AF X_18 = 2FFC5831
rk_15 = 104495A1 X_19 = F69E6888
rk_16 = D120B428 X_20 = AF2432C4
rk_17 = 73B55FA3 X_21 = ED1EC85E
rk_18 = CC874966 X_22 = 55A3BA22
rk_19 = 92244439 X_23 = 124B18AA
rk_20 = E89E641F X_24 = 6AE7725F
rk_21 = 98CA015A X_25 = F4CBA1F9
rk_22 = C7159060 X_26 = 1DCDFA10
rk_23 = 99E1FD2E X_27 = 2FF60603
rk_24 = B79BD80C X_28 = EFF24FDC
rk_25 = 1D2115B0 X_29 = 6FE46B75
rk_26 = 0E228AEB X_30 = 893450AD
rk_27 = F1780C81 X_31 = 7B938F4C
rk_28 = 428D3654 X_32 = 536E4246
rk_29 = 62293496 X_33 = 86B3E94F
rk_30 = 01CF72E5 X_34 = D206965E
rk_31 = 9124A012 X_35 = 681EDF34
Ciphertext:
68 1E DF 34 D2 06 96 5E 86 B3 E9 4F 53 6E 42 46
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A.1.2. Example 2 (GB/T 32907-2016 Example 1 Decryption)
This demonstrates the decryption process of the Example 1 ciphertext
provided by [GBT.32907-2016].
Ciphertext:
68 1E DF 34 D2 06 96 5E 86 B3 E9 4F 53 6E 42 46
Encryption key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
Status of the round key (rk_i) and round output (X_i) per round:
rk_31 = 9124A012 X_35 = 7B938F4C
rk_30 = 01CF72E5 X_34 = 893450AD
rk_29 = 62293496 X_33 = 6FE46B75
rk_28 = 428D3654 X_32 = EFF24FDC
rk_27 = F1780C81 X_31 = 2FF60603
rk_26 = 0E228AEB X_30 = 1DCDFA10
rk_25 = 1D2115B0 X_29 = F4CBA1F9
rk_24 = B79BD80C X_28 = 6AE7725F
rk_23 = 99E1FD2E X_27 = 124B18AA
rk_22 = C7159060 X_26 = 55A3BA22
rk_21 = 98CA015A X_25 = ED1EC85E
rk_20 = E89E641F X_24 = AF2432C4
rk_19 = 92244439 X_23 = F69E6888
rk_18 = CC874966 X_22 = 2FFC5831
rk_17 = 73B55FA3 X_21 = D42B7C59
rk_16 = D120B428 X_20 = 8B952B83
rk_15 = 104495A1 X_19 = 907127FA
rk_14 = 44BA14AF X_18 = B8A5DA02
rk_13 = 30D895B7 X_17 = 42DD0F19
rk_12 = 6988608C X_16 = 27DAC07F
rk_11 = 7EE55B57 X_15 = 7A96F2EB
rk_10 = C30753ED X_14 = 77F4C297
rk_9 = B7584DBD X_13 = 33220757
rk_8 = A520307C X_12 = F87C5BD5
rk_7 = 24763151 X_11 = CC13E2EE
rk_6 = B6BB89B3 X_10 = 11C1E22A
rk_5 = 776A0C61 X_9 = A18B4CB2
rk_4 = 367360F4 X_8 = 27FAD345
rk_3 = 7BA92077 X_7 = 76543210
rk_2 = 5A6AB19A X_6 = FEDCBA98
rk_1 = 41662B61 X_5 = 89ABCDEF
rk_0 = F12186F9 X_4 = 01234567
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Plaintext:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
A.1.3. Example 3 (GB/T 32907-2016 Example 2 Encryption)
This example is provided by [GBT.32907-2016] to demonstrate
encryption of a plaintext 1,000,000 times repeatedly, using a fixed
encryption key.
Plaintext:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
Encryption Key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
Ciphertext:
59 52 98 C7 C6 FD 27 1F 04 02 F8 04 C3 3D 3F 66
A.1.4. Example 4
The following example demonstrates encryption of a different message
using a different key from the above examples.
Plaintext:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Encryption key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
Status of the round key (rk_i) and round output (X_i) per round:
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rk_0 = 0D8CC1B4 X_4 = F7EAEB6A
rk_1 = AC44F213 X_5 = B4967C0F
rk_2 = 188C0C40 X_6 = 5B9B2419
rk_3 = 7537585E X_7 = F46BECBA
rk_4 = 627646F5 X_8 = A8013E25
rk_5 = 54D785AD X_9 = B38E2ABE
rk_6 = 51B96DEE X_10 = 3E7C99A1
rk_7 = 0C385958 X_11 = 6DD5F47F
rk_8 = 5E494992 X_12 = B286430C
rk_9 = 32F3FE04 X_13 = AB997DE3
rk_10 = 3A3A733D X_14 = 80F8F21F
rk_11 = 0EDFB91D X_15 = 4EF7052E
rk_12 = 6823CD6B X_16 = 4462FFAF
rk_13 = 40F7D825 X_17 = 14DFD5EA
rk_14 = 4BD68EE5 X_18 = 6D33EFED
rk_15 = 165A36C8 X_19 = 3A4F8B3C
rk_16 = 56608984 X_20 = 1A435088
rk_17 = 23F35FF4 X_21 = 4E64B153
rk_18 = 8B592B3E X_22 = 0415CEDA
rk_19 = 80F7388A X_23 = ADD88955
rk_20 = 0415C409 X_24 = 73964EF1
rk_21 = AFDF1370 X_25 = B0085092
rk_22 = CF444772 X_26 = 554A1293
rk_23 = 9AF9901F X_27 = 4BC6D6A8
rk_24 = C457578C X_28 = 7BB650E1
rk_25 = 95701C60 X_29 = DDFB8A61
rk_26 = 2B0F4EE1 X_30 = 5C4DFD78
rk_27 = 7F826139 X_31 = FD9066FD
rk_28 = FA37F8D9 X_32 = 55ADB594
rk_29 = D18AF8CE X_33 = AC1B3EA9
rk_30 = 5BD5D8C6 X_34 = 13F01ADE
rk_31 = 711138B7 X_35 = F766678F
Ciphertext:
F7 66 67 8F 13 F0 1A DE AC 1B 3E A9 55 AD B5 94
A.1.5. Example 5
The following example demonstrates decryption of Example 4.
Ciphertext:
F7 66 67 8F 13 F0 1A DE AC 1B 3E A9 55 AD B5 94
Encryption key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
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Status of the round key (rk_i) and round output (X_i) per round:
rk_31 = 711138B7 X_35 = FD9066FD
rk_30 = 5BD5D8C6 X_34 = 5C4DFD78
rk_29 = D18AF8CE X_33 = DDFB8A61
rk_28 = FA37F8D9 X_32 = 7BB650E1
rk_27 = 7F826139 X_31 = 4BC6D6A8
rk_26 = 2B0F4EE1 X_30 = 554A1293
rk_25 = 95701C60 X_29 = B0085092
rk_24 = C457578C X_28 = 73964EF1
rk_23 = 9AF9901F X_27 = ADD88955
rk_22 = CF444772 X_26 = 0415CEDA
rk_21 = AFDF1370 X_25 = 4E64B153
rk_20 = 0415C409 X_24 = 1A435088
rk_19 = 80F7388A X_23 = 3A4F8B3C
rk_18 = 8B592B3E X_22 = 6D33EFED
rk_17 = 23F35FF4 X_21 = 14DFD5EA
rk_16 = 56608984 X_20 = 4462FFAF
rk_15 = 165A36C8 X_19 = 4EF7052E
rk_14 = 4BD68EE5 X_18 = 80F8F21F
rk_13 = 40F7D825 X_17 = AB997DE3
rk_12 = 6823CD6B X_16 = B286430C
rk_11 = 0EDFB91D X_15 = 6DD5F47F
rk_10 = 3A3A733D X_14 = 3E7C99A1
rk_9 = 32F3FE04 X_13 = B38E2ABE
rk_8 = 5E494992 X_12 = A8013E25
rk_7 = 0C385958 X_11 = F46BECBA
rk_6 = 51B96DEE X_10 = 5B9B2419
rk_5 = 54D785AD X_9 = B4967C0F
rk_4 = 627646F5 X_8 = F7EAEB6A
rk_3 = 7537585E X_7 = 0C0D0E0F
rk_2 = 188C0C40 X_6 = 08090A0B
rk_1 = AC44F213 X_5 = 04050607
rk_0 = 0D8CC1B4 X_4 = 00010203
Plaintext:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
A.1.6. Example 6
This example is based on Example 4 to demonstrate encryption of a
plaintext 1,000,000 times repeatedly, using a fixed encryption key.
Plaintext:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
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Encryption Key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
Ciphertext:
37 9A 96 D0 A6 A5 A5 06 0F B4 60 C7 5D 18 79 ED
A.2. Examples For Various Modes Of Operations
The following examples can be verified using open-source
cryptographic libraries including:
o the Botan cryptographic library [BOTAN] with SM4 support, and
o the OpenSSL Cryptography and SSL/TLS Toolkit [OPENSSL] with SM4
support
A.2.1. SM4-ECB Examples
A.2.1.1. Example 1
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
Ciphertext:
5E C8 14 3D E5 09 CF F7 B5 17 9F 8F 47 4B 86 19
2F 1D 30 5A 7F B1 7D F9 85 F8 1C 84 82 19 23 04
A.2.1.2. Example 2
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
Ciphertext:
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C5 87 68 97 E4 A5 9B BB A7 2A 10 C8 38 72 24 5B
12 DD 90 BC 2D 20 06 92 B5 29 A4 15 5A C9 E6 00
A.2.2. SM4-CBC Examples
A.2.2.1. Example 1
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
78 EB B1 1C C4 0B 0A 48 31 2A AE B2 04 02 44 CB
4C B7 01 69 51 90 92 26 97 9B 0D 15 DC 6A 8F 6D
A.2.2.2. Example 2
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
0D 3A 6D DC 2D 21 C6 98 85 72 15 58 7B 7B B5 9A
91 F2 C1 47 91 1A 41 44 66 5E 1F A1 D4 0B AE 38
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A.2.3. SM4-OFB Examples
A.2.3.1. Example 1
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
AC 32 36 CB 86 1D D3 16 E6 41 3B 4E 3C 75 24 B7
1D 01 AC A2 48 7C A5 82 CB F5 46 3E 66 98 53 9B
A.2.3.2. Example 2
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
5D CC CD 25 A8 4B A1 65 60 D7 F2 65 88 70 68 49
33 FA 16 BD 5C D9 C8 56 CA CA A1 E1 01 89 7A 97
A.2.4. SM4-CFB Examples
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A.2.4.1. Example 1
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
AC 32 36 CB 86 1D D3 16 E6 41 3B 4E 3C 75 24 B7
69 D4 C5 4E D4 33 B9 A0 34 60 09 BE B3 7B 2B 3F
A.2.4.2. Example 2
Plaintext:
AA AA AA AA BB BB BB BB CC CC CC CC DD DD DD DD
EE EE EE EE FF FF FF FF AA AA AA AA BB BB BB BB
Encryption Key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
5D CC CD 25 A8 4B A1 65 60 D7 F2 65 88 70 68 49
0D 9B 86 FF 20 C3 BF E1 15 FF A0 2C A6 19 2C C5
A.2.5. SM4-CTR Examples
A.2.5.1. Example 1
Plaintext:
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AA AA AA AA AA AA AA AA BB BB BB BB BB BB BB BB
CC CC CC CC CC CC CC CC DD DD DD DD DD DD DD DD
EE EE EE EE EE EE EE EE FF FF FF FF FF FF FF FF
AA AA AA AA AA AA AA AA BB BB BB BB BB BB BB BB
Encryption Key:
01 23 45 67 89 AB CD EF FE DC BA 98 76 54 32 10
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
AC 32 36 CB 97 0C C2 07 91 36 4C 39 5A 13 42 D1
A3 CB C1 87 8C 6F 30 CD 07 4C CE 38 5C DD 70 C7
F2 34 BC 0E 24 C1 19 80 FD 12 86 31 0C E3 7B 92
6E 02 FC D0 FA A0 BA F3 8B 29 33 85 1D 82 45 14
A.2.5.2. Example 2
Plaintext:
AA AA AA AA AA AA AA AA BB BB BB BB BB BB BB BB
CC CC CC CC CC CC CC CC DD DD DD DD DD DD DD DD
EE EE EE EE EE EE EE EE FF FF FF FF FF FF FF FF
AA AA AA AA AA AA AA AA BB BB BB BB BB BB BB BB
Encryption Key:
FE DC BA 98 76 54 32 10 01 23 45 67 89 AB CD EF
IV:
00 01 02 03 04 05 06 07 08 09 0A 0B 0C 0D 0E 0F
Ciphertext:
5D CC CD 25 B9 5A B0 74 17 A0 85 12 EE 16 0E 2F
8F 66 15 21 CB BA B4 4C C8 71 38 44 5B C2 9E 5C
0A E0 29 72 05 D6 27 04 17 3B 21 23 9B 88 7F 6C
8C B5 B8 00 91 7A 24 88 28 4B DE 9E 16 EA 29 06
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Appendix B. Sample Implementation In C
B.1. sm4.h
"sm4.h" is the header file for the SM4 function.
<CODE BEGINS>
#ifndef HEADER_SM4_H
# define HEADER_SM4_H
#include <inttypes.h>
# define SM4_BLOCK_SIZE 16
# define SM4_KEY_SCHEDULE 32
void sm4_encrypt(uint8_t key[],
unsigned char plaintext[],
unsigned char ciphertext[]);
void sm4_decrypt(uint8_t key[],
unsigned char ciphertext[],
unsigned char plaintext[]);
#endif
<CODE ENDS>
B.2. sm4.c
"sm4.c" contains the main implementation of SM4.
<CODE BEGINS>
/* A sample implementation of SM4 */
#include <stdlib.h>
#include <string.h>
#include "sm4.h"
#include "print.h"
/* Operations */
/* Rotate Left 32-bit number */
#define ROTL32(X, n) (((X) << (n)) | ((X) >> (32 - (n))))
static uint32_t sm4_ck[32] = {
0x00070E15, 0x1C232A31, 0x383F464D, 0x545B6269,
0x70777E85, 0x8C939AA1, 0xA8AFB6BD, 0xC4CBD2D9,
0xE0E7EEF5, 0xFC030A11, 0x181F262D, 0x343B4249,
0x50575E65, 0x6C737A81, 0x888F969D, 0xA4ABB2B9,
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0xC0C7CED5, 0xDCE3EAF1, 0xF8FF060D, 0x141B2229,
0x30373E45, 0x4C535A61, 0x686F767D, 0x848B9299,
0xA0A7AEB5, 0xBCC3CAD1, 0xD8DFE6ED, 0xF4FB0209,
0x10171E25, 0x2C333A41, 0x484F565D, 0x646B7279
};
static uint8_t sm4_sbox[256] = {
0xD6, 0x90, 0xE9, 0xFE, 0xCC, 0xE1, 0x3D, 0xB7,
0x16, 0xB6, 0x14, 0xC2, 0x28, 0xFB, 0x2C, 0x05,
0x2B, 0x67, 0x9A, 0x76, 0x2A, 0xBE, 0x04, 0xC3,
0xAA, 0x44, 0x13, 0x26, 0x49, 0x86, 0x06, 0x99,
0x9C, 0x42, 0x50, 0xF4, 0x91, 0xEF, 0x98, 0x7A,
0x33, 0x54, 0x0B, 0x43, 0xED, 0xCF, 0xAC, 0x62,
0xE4, 0xB3, 0x1C, 0xA9, 0xC9, 0x08, 0xE8, 0x95,
0x80, 0xDF, 0x94, 0xFA, 0x75, 0x8F, 0x3F, 0xA6,
0x47, 0x07, 0xA7, 0xFC, 0xF3, 0x73, 0x17, 0xBA,
0x83, 0x59, 0x3C, 0x19, 0xE6, 0x85, 0x4F, 0xA8,
0x68, 0x6B, 0x81, 0xB2, 0x71, 0x64, 0xDA, 0x8B,
0xF8, 0xEB, 0x0F, 0x4B, 0x70, 0x56, 0x9D, 0x35,
0x1E, 0x24, 0x0E, 0x5E, 0x63, 0x58, 0xD1, 0xA2,
0x25, 0x22, 0x7C, 0x3B, 0x01, 0x21, 0x78, 0x87,
0xD4, 0x00, 0x46, 0x57, 0x9F, 0xD3, 0x27, 0x52,
0x4C, 0x36, 0x02, 0xE7, 0xA0, 0xC4, 0xC8, 0x9E,
0xEA, 0xBF, 0x8A, 0xD2, 0x40, 0xC7, 0x38, 0xB5,
0xA3, 0xF7, 0xF2, 0xCE, 0xF9, 0x61, 0x15, 0xA1,
0xE0, 0xAE, 0x5D, 0xA4, 0x9B, 0x34, 0x1A, 0x55,
0xAD, 0x93, 0x32, 0x30, 0xF5, 0x8C, 0xB1, 0xE3,
0x1D, 0xF6, 0xE2, 0x2E, 0x82, 0x66, 0xCA, 0x60,
0xC0, 0x29, 0x23, 0xAB, 0x0D, 0x53, 0x4E, 0x6F,
0xD5, 0xDB, 0x37, 0x45, 0xDE, 0xFD, 0x8E, 0x2F,
0x03, 0xFF, 0x6A, 0x72, 0x6D, 0x6C, 0x5B, 0x51,
0x8D, 0x1B, 0xAF, 0x92, 0xBB, 0xDD, 0xBC, 0x7F,
0x11, 0xD9, 0x5C, 0x41, 0x1F, 0x10, 0x5A, 0xD8,
0x0A, 0xC1, 0x31, 0x88, 0xA5, 0xCD, 0x7B, 0xBD,
0x2D, 0x74, 0xD0, 0x12, 0xB8, 0xE5, 0xB4, 0xB0,
0x89, 0x69, 0x97, 0x4A, 0x0C, 0x96, 0x77, 0x7E,
0x65, 0xB9, 0xF1, 0x09, 0xC5, 0x6E, 0xC6, 0x84,
0x18, 0xF0, 0x7D, 0xEC, 0x3A, 0xDC, 0x4D, 0x20,
0x79, 0xEE, 0x5F, 0x3E, 0xD7, 0xCB, 0x39, 0x48
};
static uint32_t sm4_fk[4] = {
0xA3B1BAC6, 0x56AA3350, 0x677D9197, 0xB27022DC
};
static uint32_t load_u32_be(const uint8_t *b, uint32_t n)
{
return ((uint32_t)b[4 * n + 3] << 24) |
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((uint32_t)b[4 * n + 2] << 16) |
((uint32_t)b[4 * n + 1] << 8) |
((uint32_t)b[4 * n ]);
}
static void store_u32_be(uint32_t v, uint8_t *b)
{
b[3] = (uint8_t)(v >> 24);
b[2] = (uint8_t)(v >> 16);
b[1] = (uint8_t)(v >> 8);
b[0] = (uint8_t)(v);
}
static void sm4_key_schedule(uint8_t key[], uint32_t rk[])
{
uint32_t t, x, k[36];
int i;
for (i = 0; i < 4; i++)
{
k[i] = load_u32_be(key, i) ^ sm4_fk[i];
}
/* T' */
for (i = 0; i < SM4_KEY_SCHEDULE; ++i)
{
x = k[i + 1] ^ k[i + 2] ^ k[i + 3] ^ sm4_ck[i];
/* Nonlinear operation tau */
t = ((uint32_t)sm4_sbox[(uint8_t)(x >> 24)]) << 24 |
((uint32_t)sm4_sbox[(uint8_t)(x >> 16)]) << 16 |
((uint32_t)sm4_sbox[(uint8_t)(x >> 8)]) << 8 |
((uint32_t)sm4_sbox[(uint8_t)(x)]);
/* Linear operation L' */
k[i+4] = k[i] ^ (t ^ ROTL32(t, 13) ^ ROTL32(t, 23));
rk[i] = k[i + 4];
}
}
#define SM4_ROUNDS(k0, k1, k2, k3, F) \
do { \
X0 ^= F(X1 ^ X2 ^ X3 ^ rk[k0]); \
X1 ^= F(X0 ^ X2 ^ X3 ^ rk[k1]); \
X2 ^= F(X0 ^ X1 ^ X3 ^ rk[k2]); \
X3 ^= F(X0 ^ X1 ^ X2 ^ rk[k3]); \
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debug_print("rk_%0.2i = %0.8x " \
" X_%0.2i = %0.8x\n", k0, rk[k0], k0+4, X0); \
debug_print("rk_%0.2i = %0.8x " \
" X_%0.2i = %0.8x\n", k1, rk[k1], k1+4, X1); \
debug_print("rk_%0.2i = %0.8x " \
" X_%0.2i = %0.8x\n", k2, rk[k2], k2+4, X2); \
debug_print("rk_%0.2i = %0.8x " \
" X_%0.2i = %0.8x\n", k3, rk[k3], k3+4, X3); \
} while(0)
static uint32_t sm4_t(uint32_t x)
{
uint32_t t = 0;
t |= ((uint32_t)sm4_sbox[(uint8_t)(x >> 24)]) << 24;
t |= ((uint32_t)sm4_sbox[(uint8_t)(x >> 16)]) << 16;
t |= ((uint32_t)sm4_sbox[(uint8_t)(x >> 8)]) << 8;
t |= sm4_sbox[(uint8_t)x];
/*
* L linear transform
*/
return t ^ ROTL32(t, 2) ^ ROTL32(t, 10) ^
ROTL32(t, 18) ^ ROTL32(t, 24);
}
void sm4_encrypt(uint8_t key[],
unsigned char plaintext[],
unsigned char ciphertext[])
{
uint32_t rk[SM4_KEY_SCHEDULE], X0, X1, X2, X3;
int i, j;
sm4_key_schedule(key, rk);
X0 = load_u32_be(plaintext, 0);
X1 = load_u32_be(plaintext, 1);
X2 = load_u32_be(plaintext, 2);
X3 = load_u32_be(plaintext, 3);
SM4_ROUNDS( 0, 1, 2, 3, sm4_t);
SM4_ROUNDS( 4, 5, 6, 7, sm4_t);
SM4_ROUNDS( 8, 9, 10, 11, sm4_t);
SM4_ROUNDS(12, 13, 14, 15, sm4_t);
SM4_ROUNDS(16, 17, 18, 19, sm4_t);
SM4_ROUNDS(20, 21, 22, 23, sm4_t);
SM4_ROUNDS(24, 25, 26, 27, sm4_t);
SM4_ROUNDS(28, 29, 30, 31, sm4_t);
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store_u32_be(X3, ciphertext);
store_u32_be(X2, ciphertext + 4);
store_u32_be(X1, ciphertext + 8);
store_u32_be(X0, ciphertext + 12);
}
void sm4_decrypt(uint8_t key[],
unsigned char ciphertext[],
unsigned char plaintext[])
{
uint32_t rk[SM4_KEY_SCHEDULE], X0, X1, X2, X3;
int i, j;
sm4_key_schedule(key, rk);
X0 = load_u32_be(ciphertext, 0);
X1 = load_u32_be(ciphertext, 1);
X2 = load_u32_be(ciphertext, 2);
X3 = load_u32_be(ciphertext, 3);
SM4_ROUNDS(31, 30, 29, 28, sm4_t);
SM4_ROUNDS(27, 26, 25, 24, sm4_t);
SM4_ROUNDS(23, 22, 21, 20, sm4_t);
SM4_ROUNDS(19, 18, 17, 16, sm4_t);
SM4_ROUNDS(15, 14, 13, 12, sm4_t);
SM4_ROUNDS(11, 10, 9, 8, sm4_t);
SM4_ROUNDS( 7, 6, 5, 4, sm4_t);
SM4_ROUNDS( 3, 2, 1, 0, sm4_t);
store_u32_be(X3, plaintext);
store_u32_be(X2, plaintext + 4);
store_u32_be(X1, plaintext + 8);
store_u32_be(X0, plaintext + 12);
}
<CODE ENDS>
B.3. sm4_main.c
"sm4_main.c" is used to run the examples provided in this document
and print out internal state for implementation reference.
<CODE BEGINS>
#include <stdlib.h>
#include <string.h>
#include <stdbool.h>
#include "sm4.h"
#include "print.h"
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typedef struct {
unsigned char* key;
unsigned char* message;
unsigned char* expected;
int iterations;
bool encrypt;
} test_case;
int sm4_run_example(test_case tc)
{
unsigned char input[SM4_BLOCK_SIZE] = {0};
unsigned char output[SM4_BLOCK_SIZE] = {0};
int i;
debug_print("-----------------------"
" Message Input m Begin "
"-------------------------\n");
print_bytes((unsigned int*)tc.message, SM4_BLOCK_SIZE);
debug_print("----------------------- "
"Message Input m End "
"---------------------------\n");
if (tc.encrypt)
{
debug_print("----------------------- "
"Encrypt "
"---------------------------\n");
memcpy(input, tc.message, SM4_BLOCK_SIZE);
for (i = 0; i != tc.iterations; ++i)
{
sm4_encrypt(tc.key,
(unsigned char*)input,
(unsigned char*)output);
memcpy(input, output, SM4_BLOCK_SIZE);
}
}
else
{
debug_print("----------------------- "
"Decrypt "
"---------------------------\n");
memcpy(input, tc.message, SM4_BLOCK_SIZE);
for (i = 0; i != tc.iterations; ++i)
{
sm4_decrypt(tc.key,
(unsigned char*)input,
(unsigned char*)output);
memcpy(input, output, SM4_BLOCK_SIZE);
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}
}
debug = 1;
debug_print("+++++++++++++++++++++++++++++++"
" RESULT "
"++++++++++++++++++++++++++++++++\n");
debug_print("RESULTS:\n");
debug_print(" Expected:\n");
print_bytes((unsigned int*)tc.expected, SM4_BLOCK_SIZE);
debug_print(" Output:\n");
print_bytes((unsigned int*)output, SM4_BLOCK_SIZE);
debug = 0;
return memcmp(
(unsigned char*)output,
(unsigned char*)tc.expected,
SM4_BLOCK_SIZE
);
}
int main(int argc, char **argv)
{
int i;
unsigned char key[SM4_BLOCK_SIZE];
unsigned char block[SM4_BLOCK_SIZE];
test_case tests[8] = {0};
/*
* This test vector comes from Example 1 of GB/T 32907-2016,
*/
static const unsigned int gbt32907k1[SM4_BLOCK_SIZE] = {
0x01234567, 0x89abcdef,
0xfedcba98, 0x76543210
};
static const unsigned int gbt32907m1[SM4_BLOCK_SIZE] = {
0x01234567, 0x89abcdef,
0xfedcba98, 0x76543210
};
static const unsigned int gbt32907e1[SM4_BLOCK_SIZE] = {
0x681edf34, 0xd206965e,
0x86b3e94f, 0x536e4246
};
test_case gbt32907t1 = {
(unsigned char*)gbt32907k1,
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(unsigned char*)gbt32907m1,
(unsigned char*)gbt32907e1,
1,
true
};
tests[0] = gbt32907t1;
/*
* This test vector comes from Example 2 from GB/T 32907-2016.
* After 1,000,000 iterations.
*/
static const unsigned int gbt32907e2[SM4_BLOCK_SIZE] = {
0x595298c7, 0xc6fd271f,
0x0402f804, 0xc33d3f66
};
test_case gbt32907t2 = {
(unsigned char*)gbt32907k1,
(unsigned char*)gbt32907m1,
(unsigned char*)gbt32907e2,
1000000,
true
};
tests[1] = gbt32907t2;
/*
* This test vector reverses Example 1 of GB/T 32907-2016.
* After decrypting 1 iteration.
*/
test_case gbt32907t3 = {
(unsigned char*)gbt32907k1,
(unsigned char*)gbt32907e1,
(unsigned char*)gbt32907m1,
1,
false
};
tests[2] = gbt32907t3;
/*
* This test vector reverses Example 2 of GB/T 32907-2016.
* After decrypting 1,000,000 iterations.
*/
test_case gbt32907t4 = {
(unsigned char*)gbt32907k1,
(unsigned char*)gbt32907e2,
(unsigned char*)gbt32907m1,
1000000,
false
};
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tests[3] = gbt32907t4;
/*
* Newly added examples to demonstrate key changes.
*/
static const unsigned int newexamplek1[SM4_BLOCK_SIZE] = {
0xfedcba98, 0x76543210,
0x01234567, 0x89abcdef
};
static const unsigned int newexamplem1[SM4_BLOCK_SIZE] = {
0x00010203, 0x04050607,
0x08090a0b, 0x0c0d0e0f
};
static const unsigned int newexamplee1[SM4_BLOCK_SIZE] = {
0xf766678f, 0x13f01ade,
0xac1b3ea9, 0x55adb594
};
/*
*/
test_case newexample1 = {
(unsigned char*)newexamplek1,
(unsigned char*)newexamplem1,
(unsigned char*)newexamplee1,
1,
true
};
tests[4] = newexample1;
test_case newexample2 = {
(unsigned char*)newexamplek1,
(unsigned char*)newexamplee1,
(unsigned char*)newexamplem1,
1,
false
};
tests[5] = newexample2;
/*
* After 1,000,000 iterations.
*/
static const unsigned int newexamplee2[SM4_BLOCK_SIZE] = {
0x379a96d0, 0xa6a5a506,
0x0fb460c7, 0x5d1879ed
};
test_case newexample3 = {
(unsigned char*)newexamplek1,
(unsigned char*)newexamplem1,
(unsigned char*)newexamplee2,
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1000000,
true
};
tests[6] = newexample3;
for (i = 0; i < 7; ++i)
{
if (i == 1 || i == 3)
continue;
printf("sm4_example[%2i]: %s\n", i,
sm4_run_example(tests[i]) ? "FAIL" : "PASS");
}
return 0;
}
<CODE ENDS>
B.4. print.c and print.h
"print.c" and "print.h" are used to provide pretty formatting used to
print out the examples for this document.
"print.h"
<CODE BEGINS>
#ifndef SM4PRINT_H
#define SM4PRINT_H
#define DEBUG 0
#define debug_print(...) \
do { if (DEBUG) fprintf(stderr, __VA_ARGS__); } while (0)
#include <stdio.h>
void print_bytes(unsigned* buf, int n);
#endif
<CODE ENDS>
"print.c"
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<CODE BEGINS>
#include <stdio.h>
#include "print.h"
void print_bytes(unsigned int* buf, int n)
{
unsigned char* ptr = (unsigned char*)buf;
int i, j;
for (i = 0; i <= n/4; i++) {
if (i > 0 && i % 8 == 0) {
debug_print("\n");
}
for (j = 1; j <= 4; j++) {
if ((i*4+4-j) < n) {
debug_print("%.2X", ptr[(i*4)+4-j]);
}
}
debug_print(" ");
}
debug_print("\n");
}
<CODE ENDS>
Appendix C. Acknowledgements
The authors would like to thank the following persons for their
valuable advice and input.
o Erick Borsboom, for assisting the lengthy review of this document;
o Jack Lloyd and Daniel Wyatt, of the Ribose RNP team, for their
input and implementation;
o Paul Yang, for reviewing and proposing improvements to readability
of this document.
Authors' Addresses
Ronald Henry Tse
Ribose
Suite 1111, 1 Pedder Street
Central, Hong Kong
People's Republic of China
Email: ronald.tse@ribose.com
URI: https://www.ribose.com
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Wai Kit Wong
Hang Seng Management College
Hang Shin Link, Siu Lek Yuen
Shatin, Hong Kong
People's Republic of China
Email: wongwk@hsmc.edu.hk
URI: https://www.hsmc.edu.hk
Markku-Juhani O. Saarinen
Independent Consultant
Email: mjos@iki.fi
URI: https://mjos.fi/
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