In cryptography, RC4 (Rivest Cipher 4 also known as ARC4 or ARCFOUR meaning Alleged RC4, see below) is a stream cipher. While it is remarkable for its simplicity and speed in software, multiple vulnerabilities have been discovered in RC4, rendering it insecure. It is especially vulnerable when the beginning of the output keystream is not discarded, or when nonrandom or related keys are used. Particularly problematic uses of RC4 have led to very insecure protocols such as WEP.
|Designers||Ron Rivest (RSA Security)|
|First published||Leaked in 1994|
(designed in 1987)
|Key sizes||40–2048 bits|
|State size||2064 bits (1684 effective)|
|Speed||7 cycles per byte on original Pentium|
Modified Alleged RC4 on Intel Core 2: 13.9 cycles per byte
As of 2015[update], there is speculation that some state cryptologic agencies may possess the capability to break RC4 when used in the TLS protocol. IETF has published RFC 7465 to prohibit the use of RC4 in TLS; Mozilla and Microsoft have issued similar recommendations.
A number of attempts have been made to strengthen RC4, notably Spritz, RC4A, VMPC, and RC4+.
RC4 was designed by Ron Rivest of RSA Security in 1987. While it is officially termed "Rivest Cipher 4", the RC acronym is alternatively understood to stand for "Ron's Code" (see also RC2, RC5 and RC6).
RC4 was initially a trade secret, but in September 1994 a description of it was anonymously posted to the Cypherpunks mailing list. It was soon posted on the sci.crypt newsgroup, where it was analyzed within days by Bob Jenkins. From there it spread to many sites on the Internet. The leaked code was confirmed to be genuine as its output was found to match that of proprietary software using licensed RC4. Because the algorithm is known, it is no longer a trade secret. The name RC4 is trademarked, so RC4 is often referred to as ARCFOUR or ARC4 (meaning alleged RC4) to avoid trademark problems. RSA Security has never officially released the algorithm; Rivest has, however, linked to the English Wikipedia article on RC4 in his own course notes in 2008 and confirmed the history of RC4 and its code in a 2014 paper by him.
RC4 became part of some commonly used encryption protocols and standards, such as WEP in 1997 and WPA in 2003/2004 for wireless cards; and SSL in 1995 and its successor TLS in 1999, until it was prohibited for all versions of TLS by RFC 7465 in 2015, due to the RC4 attacks weakening or breaking RC4 used in SSL/TLS. The main factors in RC4's success over such a wide range of applications have been its speed and simplicity: efficient implementations in both software and hardware were very easy to develop.
RC4 generates a pseudorandom stream of bits (a keystream). As with any stream cipher, these can be used for encryption by combining it with the plaintext using bit-wise exclusive-or; decryption is performed the same way (since exclusive-or with given data is an involution). This is similar to the one-time pad except that generated pseudorandom bits, rather than a prepared stream, are used.
To generate the keystream, the cipher makes use of a secret internal state which consists of two parts:
- A permutation of all 256 possible bytes (denoted "S" below).
- Two 8-bit index-pointers (denoted "i" and "j").
The permutation is initialized with a variable length key, typically between 40 and 2048 bits, using the key-scheduling algorithm (KSA). Once this has been completed, the stream of bits is generated using the pseudo-random generation algorithm (PRGA).
Key-scheduling algorithm (KSA)Edit
The key-scheduling algorithm is used to initialize the permutation in the array "S". "keylength" is defined as the number of bytes in the key and can be in the range 1 ≤ keylength ≤ 256, typically between 5 and 16, corresponding to a key length of 40 – 128 bits. First, the array "S" is initialized to the identity permutation. S is then processed for 256 iterations in a similar way to the main PRGA, but also mixes in bytes of the key at the same time.
for i from 0 to 255 S[i] := i endfor j := 0 for i from 0 to 255 j := (j + S[i] + key[i mod keylength]) mod 256 swap values of S[i] and S[j] endfor
Pseudo-random generation algorithm (PRGA)Edit
For as many iterations as are needed, the PRGA modifies the state and outputs a byte of the keystream. In each iteration, the PRGA:
- increments i
- looks up the ith element of S, S[i], and adds that to j
- exchanges the values of S[i] and S[j] then uses the sum S[i] + S[j] (modulo 256) as an index to fetch a third element of S (the keystream value K below)
- then bitwise exclusive ORed (XORed) with the next byte of the message to produce the next byte of either ciphertext or plaintext.
Each element of S is swapped with another element at least once every 256 iterations.
i := 0 j := 0 while GeneratingOutput: i := (i + 1) mod 256 j := (j + S[i]) mod 256 swap values of S[i] and S[j] K := S[(S[i] + S[j]) mod 256] output K endwhile
Thus, this produces a stream of K,K,... which are XOR'ed with the plaintext to obtain the ciphertext. So ciphertext[l] = plaintext[l] ⊕ K[l] .
RC4-based random number generatorsEdit
Several operating systems include
arc4random, an API originating in OpenBSD providing access to a random number generator originally based on RC4. In OpenBSD 5.5, released in May 2014,
arc4random was modified to use ChaCha20. The implementations of arc4random in FreeBSD, NetBSD and Linux's libbsd also use ChaCha20. According to manual pages shipped with the operating system, in the 2017 release of its desktop and mobile operating systems, Apple replaced RC4 with AES in its implementation of arc4random. Man pages for the new arc4random include the backronym "A Replacement Call for Random" for ARC4 as a mnemonic, as it provides better random data than rand() does.
Many stream ciphers are based on linear-feedback shift registers (LFSRs), which, while efficient in hardware, are less so in software. The design of RC4 avoids the use of LFSRs and is ideal for software implementation, as it requires only byte manipulations. It uses 256 bytes of memory for the state array, S through S, k bytes of memory for the key, key through key[k-1], and integer variables, i, j, and K. Performing a modular reduction of some value modulo 256 can be done with a bitwise AND with 255 (which is equivalent to taking the low-order byte of the value in question).
|Secret||04D46B053CA87B59…||Attack at dawn||45A01F645FC35B383552544B9BF5|
Unlike a modern stream cipher (such as those in eSTREAM), RC4 does not take a separate nonce alongside the key. This means that if a single long-term key is to be used to securely encrypt multiple streams, the protocol must specify how to combine the nonce and the long-term key to generate the stream key for RC4. One approach to addressing this is to generate a "fresh" RC4 key by hashing a long-term key with a nonce. However, many applications that use RC4 simply concatenate key and nonce; RC4's weak key schedule then gives rise to related key attacks, like the Fluhrer, Mantin and Shamir attack (which is famous for breaking the WEP standard).
Because RC4 is a stream cipher, it is more malleable than common block ciphers. If not used together with a strong message authentication code (MAC), then encryption is vulnerable to a bit-flipping attack. The cipher is also vulnerable to a stream cipher attack if not implemented correctly.
It is noteworthy, however, that RC4, being a stream cipher, was for a period of time the only common cipher that was immune to the 2011 BEAST attack on TLS 1.0. The attack exploits a known weakness in the way cipher block chaining mode is used with all of the other ciphers supported by TLS 1.0, which are all block ciphers.
In March 2013, there were new attack scenarios proposed by Isobe, Ohigashi, Watanabe and Morii, as well as AlFardan, Bernstein, Paterson, Poettering and Schuldt that use new statistical biases in RC4 key table to recover plaintext with large number of TLS encryptions.
The use of RC4 in TLS is prohibited by RFC 7465 published in February 2015.
Roos' biases and key reconstruction from permutationEdit
In 1995, Andrew Roos experimentally observed that the first byte of the keystream is correlated to the first three bytes of the key and the first few bytes of the permutation after the KSA are correlated to some linear combination of the key bytes. These biases remained unexplained until 2007, when Goutam Paul, Siddheshwar Rathi and Subhamoy Maitra proved the keystream–key correlation and in another work Goutam Paul and Subhamoy Maitra proved the permutation–key correlations. The latter work also used the permutation–key correlations to design the first algorithm for complete key reconstruction from the final permutation after the KSA, without any assumption on the key or initialization vector. This algorithm has a constant probability of success in a time which is the square root of the exhaustive key search complexity. Subsequently, many other works have been performed on key reconstruction from RC4 internal states. Subhamoy Maitra and Goutam Paul also showed that the Roos-type biases still persist even when one considers nested permutation indices, like S[S[i]] or S[S[S[i]]]. These types of biases are used in some of the later key reconstruction methods for increasing the success probability.
Biased outputs of the RC4Edit
The keystream generated by the RC4 is biased to varying degrees towards certain sequences making it vulnerable to distinguishing attacks. The best such attack is due to Itsik Mantin and Adi Shamir who showed that the second output byte of the cipher was biased toward zero with probability 1/128 (instead of 1/256). This is due to the fact that if the third byte of the original state is zero, and the second byte is not equal to 2, then the second output byte is always zero. Such bias can be detected by observing only 256 bytes.
The complete characterization of a single step of RC4 PRGA was performed by Riddhipratim Basu, Shirshendu Ganguly, Subhamoy Maitra, and Goutam Paul. Considering all the permutations, they prove that the distribution of the output is not uniform given i and j, and as a consequence, information about j is always leaked into the output.
Fluhrer, Mantin and Shamir attackEdit
In 2001, a new and surprising discovery was made by Fluhrer, Mantin and Shamir: over all the possible RC4 keys, the statistics for the first few bytes of output keystream are strongly non-random, leaking information about the key. If the nonce and long-term key are simply concatenated to generate the RC4 key, this long-term key can be discovered by analysing a large number of messages encrypted with this key. This and related effects were then used to break the WEP ("wired equivalent privacy") encryption used with 802.11 wireless networks. This caused a scramble for a standards-based replacement for WEP in the 802.11 market, and led to the IEEE 802.11i effort and WPA.
Protocols can defend against this attack by discarding the initial portion of the keystream. Such a modified algorithm is traditionally called "RC4-drop[n]", where n is the number of initial keystream bytes that are dropped. The SCAN default is n = 768 bytes, but a conservative value would be n = 3072 bytes.
The Fluhrer, Mantin and Shamir attack does not apply to RC4-based SSL, since SSL generates the encryption keys it uses for RC4 by hashing, meaning that different SSL sessions have unrelated keys.
In 2005, Andreas Klein presented an analysis of the RC4 stream cipher showing more correlations between the RC4 keystream and the key. Erik Tews, Ralf-Philipp Weinmann, and Andrei Pychkine used this analysis to create aircrack-ptw, a tool which cracks 104-bit RC4 used in 128-bit WEP in under a minute. Whereas the Fluhrer, Mantin, and Shamir attack used around 10 million messages, aircrack-ptw can break 104-bit keys in 40,000 frames with 50% probability, or in 85,000 frames with 95% probability.
A combinatorial problem related to the number of inputs and outputs of the RC4 cipher was first posed by Itsik Mantin and Adi Shamir in 2001, whereby, of the total 256 elements in the typical state of RC4, if x number of elements (x ≤ 256) are only known (all other elements can be assumed empty), then the maximum number of elements that can be produced deterministically is also x in the next 256 rounds. This conjecture was put to rest in 2004 with a formal proof given by Souradyuti Paul and Bart Preneel.
Royal Holloway attackEdit
In 2013, a group of security researchers at the Information Security Group at Royal Holloway, University of London reported an attack that can become effective using only 234 encrypted messages. While yet not a practical attack for most purposes, this result is sufficiently close to one that it has led to speculation that it is plausible that some state cryptologic agencies may already have better attacks that render RC4 insecure. Given that, as of 2013[update], a large amount of TLS traffic uses RC4 to avoid attacks on block ciphers that use cipher block chaining, if these hypothetical better attacks exist, then this would make the TLS-with-RC4 combination insecure against such attackers in a large number of practical scenarios.
In March 2015 researcher to Royal Holloway announced improvements to their attack, providing a 226 attack against passwords encrypted with RC4, as used in TLS.
In 2015, security researchers from KU Leuven presented new attacks against RC4 in both TLS and WPA-TKIP. Dubbed the Numerous Occurrence MOnitoring & Recovery Exploit (NOMORE) attack, it is the first attack of its kind that was demonstrated in practice. Their attack against TLS can decrypt a secure HTTP cookie within 75 hours. The attack against WPA-TKIP can be completed within an hour, and allows an attacker to decrypt and inject arbitrary packets.
As mentioned above, the most important weakness of RC4 comes from the insufficient key schedule; the first bytes of output reveal information about the key. This can be corrected by simply discarding some initial portion of the output stream. This is known as RC4-dropN, where N is typically a multiple of 256, such as 768 or 1024.
A number of attempts have been made to strengthen RC4, notably Spritz, RC4A, VMPC, and RC4+.
RC4A uses two state arrays S1 and S2, and two indexes j1 and j2. Each time i is incremented, two bytes are generated:
- First, the basic RC4 algorithm is performed using S1 and j1, but in the last step, S1[i]+S1[j1] is looked up in S2.
- Second, the operation is repeated (without incrementing i again) on S2 and j2, and S1[S2[i]+S2[j2]] is output.
Thus, the algorithm is:
All arithmetic is performed modulo 256 i := 0 j1 := 0 j2 := 0 while GeneratingOutput: i := i + 1 j1 := j1 + S1[i] swap values of S1[i] and S1[j1] output S2[S1[i] + S1[j1]] j2 := j2 + S2[i] swap values of S2[i] and S2[j2] output S1[S2[i] + S2[j2]] endwhile
Although the algorithm required the same number of operations per output byte, there is greater parallelism than RC4, providing a possible speed improvement.
Variably Modified Permutation Composition (VMPC) is another RC4 variant. It uses similar key schedule as RC4, with j := S[(j + S[i] + key[i mod keylength]) mod 256] iterating 3 × 256 = 768 times rather than 256, and with an optional additional 768 iterations to incorporate an initial vector. The output generation function operates as follows:
All arithmetic is performed modulo 256. i := 0 while GeneratingOutput: a := S[i] j := S[j + a] output S[S[S[j] + 1]] Swap S[i] and S[j] (b := S[j]; S[i] := b; S[j] := a)) i := i + 1 endwhile
RC4+ is a modified version of RC4 with a more complex three-phase key schedule (taking about three times as long as RC4, or the same as RC4-drop512), and a more complex output function which performs four additional lookups in the S array for each byte output, taking approximately 1.7 times as long as basic RC4.
All arithmetic modulo 256. << and >> are left and right shift, ⊕ is exclusive OR while GeneratingOutput: i := i + 1 a := S[i] j := j + a Swap S[i] and S[j] (b := S[j]; S[j] := S[i]; S[i] := b;) c := S[i<<5 ⊕ j>>3] + S[j<<5 ⊕ i>>3] output (S[a+b] + S[c⊕0xAA]) ⊕ S[j+b] endwhile
This algorithm has not been analyzed significantly.
In 2014, Ronald Rivest gave a talk and co-wrote a paper on an updated redesign called Spritz. A hardware accelerator of Spritz was published in Secrypt, 2016 and shows that due to multiple nested calls required to produce output bytes, Spritz performs rather slowly compared to other hash functions such as SHA-3 and the best known hardware implementation of RC4.
The algorithm is:
All arithmetic is performed modulo 256 while GeneratingOutput: i := i + w j := k + S[j + S[i]] k := k + i + S[j] swap values of S[i] and S[j] output z := S[j + S[i + S[z + k]]] endwhile
The value w, is relatively prime to the size of the S array. So after 256 iterations of this inner loop, the value i (incremented by w every iteration) has taken on all possible values 0...255, and every byte in the S array has been swapped at least once.
Like other sponge functions, Spritz can be used to build a cryptographic hash function, a deterministic random bit generator (DRBG), an encryption algorithm that supports authenticated encryption with associated data (AEAD), etc.
In 2016, Banik and Isobe proposed an attack that can distinguish Spritz from random noise.
- WPA (default algorithm, but can be configured to use AES-CCMP instead of RC4)
- BitTorrent protocol encryption
- Microsoft Office XP (insecure implementation since nonce remains unchanged when documents get modified)
- Microsoft Point-to-Point Encryption
- Transport Layer Security / Secure Sockets Layer (was optional and then the use of RC4 was prohibited in RFC 7465)
- Secure Shell (optionally)
- Remote Desktop Protocol (optionally)
- Kerberos (optionally)
- SASL Mechanism Digest-MD5 (optionally, historic, obsoleted in RFC 6331)
- Gpcode.AK, an early June 2008 computer virus for Microsoft Windows, which takes documents hostage for ransom by obscuring them with RC4 and RSA-1024 encryption
- Skype (in modified form)
Where a protocol is marked with "(optionally)", RC4 is one of multiple ciphers the system can be configured to use.
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