Ieeepro techno solutions 2014 ieee java project - decentralized access control with anonymous authentication of data stored in clouds

Decentralized Access Control with Anonymous
Authentication of Data Stored in Clouds
Sushmita Ruj‡, Milos Stojmenovic†, Amiya Nayak∗
‡CSE, Indian Institute of Technology, IIT, Indore, India, – sush@iiti.ac.in
†Singidunum University, Belgrade, Serbia – mstojmenovic@singidunum.ac.rs
∗SEECS, University of Ottawa, Canada – anayak@site.uottawa.ca
Abstract—We propose a new decentralized access control scheme
for secure data storage in clouds, that supports anonymous authenti-
cation. In the proposed scheme, the cloud verifies the authenticity of
the ser without knowing the user’s identity before storing data. Our
scheme also has the added feature of access control in which only
valid users are able to decrypt the stored information. The scheme
prevents replay attacks and supports creation, modification, and
reading data stored in the cloud. We also address user revocation.
Moreover, our authentication and access control scheme is decen-
tralized and robust, unlike other access control schemes designed
for clouds which are centralized. The communication, computation,
and storage overheads are comparable to centralized approaches.
Keywords: Access control, Authentication, Attribute-based
signatures, Attribute-based encryption, Cloud storage.
I. INTRODUCTION
Research in cloud computing is receiving a lot of attention
from both academic and industrial worlds. In cloud computing,
users can outsource their computation and storage to servers (also
called clouds) using Internet. This frees users from the hassles of
maintaining resources on-site. Clouds can provide several types of
services like applications (e.g., Google Apps, Microsoft online),
infrastructures (e.g., Amazon’s EC2, Eucalyptus, Nimbus), and
platforms to help developers write applications (e.g., Amazon’s
S3, Windows Azure).
Much of the data stored in clouds is highly sensitive, for
example, medical records and social networks. Security and
privacy are thus very important issues in cloud computing. In
one hand, the user should authenticate itself before initiating any
transaction, and on the other hand, it must be ensured that the
cloud does not tamper with the data that is outsourced. User
privacy is also required so that the cloud or other users do
not know the identity of the user. The cloud can hold the user
accountable for the data it outsources, and likewise, the cloud is
itself accountable for the services it provides. The validity of the
user who stores the data is also verified. Apart from the technical
solutions to ensure security and privacy, there is also a need for
law enforcement.
Recently, Wang et al. [2] addressed secure and dependable
cloud storage. Cloud servers prone to Byzantine failure, where
a storage server can fail in arbitrary ways [2]. The cloud is also
prone to data modification and server colluding attacks. In server
colluding attack, the adversary can compromise storage servers,
so that it can modify data files as long as they are internally
consistent. To provide secure data storage, the data needs to be
encrypted. However, the data is often modified and this dynamic
property needs to be taken into account while designing efficient
secure storage techniques.
Efficient search on encrypted data is also an important concern
in clouds. The clouds should not know the query but should be
able to return the records that satisfy the query. This is achieved
by means of searchable encryption [3], [4]. The keywords are sent
to the cloud encrypted, and the cloud returns the result without
knowing the actual keyword for the search. The problem here is
that the data records should have keywords associated with them
to enable the search. The correct records are returned only when
searched with the exact keywords.
Security and privacy protection in clouds are being explored by
many researchers. Wang et al. [2] addressed storage security using
Reed-Solomon erasure-correcting codes. Authentication of users
using public key cryptographic techniques has been studied in [5].
Many homomorphic encryption techniques have been suggested
[6], [7] to ensure that the cloud is not able to read the data
while performing computations on them. Using homomorphic
encryption, the cloud receives ciphertext of the data and performs
computations on the ciphertext and returns the encoded value of
the result. The user is able to decode the result, but the cloud does
not know what data it has operated on. In such circumstances, it
must be possible for the user to verify that the cloud returns
correct results.
Accountability of clouds is a very challenging task and involves
technical issues and law enforcement. Neither clouds nor users
should deny any operations performed or requested. It is impor-
tant to have log of the transactions performed; however, it is an
important concern to decide how much information to keep in the
log. Accountability has been addressed in TrustCloud [8]. Secure
provenance has been studied in [9].
Considering the following situation: A Law student, Alice,
wants to send a series of reports about some malpractices by
authorities of University X to all the professors of University
X, Research chairs of universities in the country, and students
belonging to Law department in all universities in the province.
She wants to remain anonymous while publishing all evidence
of malpractice. She stores the information in the cloud. Access
control is important in such case, so that only authorized users
can access the data. It is also important to verify that the
information comes from a reliable source. The problems of access
control, authentication, and privacy protection should be solved
IEEE TRANSACTIONS ON PARALLEL AND DISTRIBUTED SYSTEMS VOL:25 NO:2 YEAR 2014

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simultaneously. We address this problem in its entirety in this
paper.
Access control in clouds is gaining attention because it is
important that only authorized users have access to valid service.
A huge amount of information is being stored in the cloud, and
much of this is sensitive information. Care should be taken to
ensure access control of this sensitive information which can often
be related to health, important documents (as in Google Docs or
Dropbox) or even personal information (as in social networking).
There are broadly three types of access control: User Based
Access Control (UBAC), Role Based Access Control (RBAC), and
Attribute Based Access Control (ABAC). In UBAC, the access
control list (ACL) contains the list of users who are authorized
to access data. This is not feasible in clouds where there are
many users. In RBAC (introduced by [10]), users are classified
based on their individual roles. Data can be accessed by users
who have matching roles. The roles are defined by the system.
For example, only faculty members and senior secretaries might
have access to data but not the junior secretaries. ABAC is more
extended in scope, in which users are given attributes, and the data
has attached access policy. Only users with valid set of attributes,
satisfying the access policy, can access the data. For instance, in
the above example certain records might be accessible by faculty
members with more than 10 years of research experience or by
senior secretaries with more than 8 years experience. The pros and
cons of RBAC and ABAC are discussed in [11]. There has been
some work on ABAC in clouds (for example, [12], [13], [14],
[15], [16]). All these work use a cryptographic primitive known
as Attribute Based Encryption (ABE). The The eXtensible Access
Control Markup Language (XACML) [17] has been proposed for
ABAC in clouds [18].
An area where access control is widely being used is health
care. Clouds are being used to store sensitive information about
patients to enable access to medical professionals, hospital staff,
researchers, and policy makers. It is important to control the
access of data so that only authorized users can access the data.
Using ABE, the records are encrypted under some access policy
and stored in the cloud. Users are given sets of attributes and
corresponding keys. Only when the users have matching set of
attributes, can they decrypt the information stored in the cloud.
Access control in health care has been studied in [12], [13].
Access control is also gaining importance in online social net-
working where users (members) store their personal information,
pictures, videos and share them with selected groups of users
or communities they belong to. Access control in online social
networking has been studied in [19]. Such data are being stored
in clouds. It is very important that only the authorized users are
given access to those information. A similar situation arises when
data is stored in clouds, for example in Dropbox, and shared with
certain groups of people.
It is just not enough to store the contents securely in the cloud
but it might also be necessary to ensure anonymity of the user. For
example, a user would like to store some sensitive information
but does not want to be recognized. The user might want to post
a comment on an article, but does not want his/her identity to
be disclosed. However, the user should be able to prove to the
other users that he/she is a valid user who stored the information
without revealing the identity. There are cryptographic protocols
like ring signatures [20], mesh signatures [21], group signatures
[22], which can be used in these situations. Ring signature is not a
feasible option for clouds where there are a large number of users.
Group signatures assume the pre-existence of a group which
might not be possible in clouds. Mesh signatures do not ensure
if the message is from a single user or many users colluding
together. For these reasons, a new protocol known as Attribute
Based Signature (ABS) has been applied. ABS was proposed by
Maji et al. [23]. In ABS, users have a claim predicate associated
with a message. The claim predicate helps to identify the user
as an authorized one, without revealing its identity. Other users
or the cloud can verify the user and the validity of the message
stored. ABS can be combined with ABE to achieve authenticated
access control without disclosing the identity of the user to the
cloud.
Existing work [38], [18], [12], [13], [14], [15], [16] on access
control in cloud are centralized in nature. Except [38] and [18], all
other schemes use attribute based encryption (ABE). The scheme
in [38] uses a symmetric key approach and does not support
authentication. The schemes [12], [13], [16] do not support
authentication as well. Earlier work by Zhao et al. [15] provides
privacy preserving authenticated access control in cloud. How-
ever, the authors take a centralized approach where a single key
distribution center (KDC) distributes secret keys and attributes to
all users. Unfortunately, a single KDC is not only a single point
of failure but difficult to maintain because of the large number of
users that are supported in a cloud environment. We, therefore,
emphasize that clouds should take a decentralized approach while
distributing secret keys and attributes to users. It is also quite
natural for clouds to have many KDCs in different locations in
the world. Although Yang et al. [34] proposed a decentralized
approach, their technique does not authenticate users, who want to
remain anonymous while accessing the cloud. In an earlier work,
Ruj et al. [16] proposed a distributed access control mechanism in
clouds. However, the scheme did not provide user authentication.
The other drawback was that a user can create and store a file and
other users can only read the file. Write access was not permitted
to users other than the creator. In the preliminary version of
this paper [1], we extend our previous work with added features
which enables to authenticate the validity of the message without
revealing the identity of the user who has stored information in
the cloud. In this version we also address user revocation, that
was not addressed in [1]. We use attribute based signature scheme
[24] to achieve authenticity and privacy. Unlike [24], our scheme
is resistant to replay attacks, in which a user can replace fresh
data with stale data from a previous write, even if it no longer
has valid claim policy. This is an important property because a
user, revoked of its attributes, might no longer be able to write
to the cloud. We therefore add this extra feature in our scheme
and modify [24] appropriately. Our scheme also allows writing
multiple times which was not permitted in our earlier work [16].

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A. Our Contributions
The main contributions of this paper are the following:
1) Distributed access control of data stored in cloud so that
only authorized users with valid attributes can access them.
2) Authentication of users who store and modify their data on
the cloud.
3) The identity of the user is protected from the cloud during
authentication.
4) The architecture is decentralized, meaning that there can be
several KDCs for key management.
5) The access control and authentication are both collusion
resistant, meaning that no two users can collude and access
data or authenticate themselves, if they are individually not
authorized.
6) Revoked users cannot access data after they have been
revoked.
7) The proposed scheme is resilient to replay attacks. A writer
whose attributes and keys have been revoked cannot write
back stale information.
8) The protocol supports multiple read and write on the data
stored in the cloud.
9) The costs are comparable to the existing centralized ap-
proaches, and the expensive operations are mostly done by
the cloud.
B. Organization
The paper is organized as follows. Related work is presented
in Section II. The mathematical background and assumptions are
detailed in Section III. We present our privacy preserving access
control scheme in Section IV followed by a real life example in
Section V. The security is analyzed in Section VI. Computation
complexity is discussed in Section VII, and comparison with other
work is presented in Section VIII. We conclude in Section IX.
II. RELATED WORK
ABE was proposed by Sahai and Waters [26]. In ABE, a user
has a set of attributes in addition to its unique ID. There are two
classes of ABEs. In Key-policy ABE or KP-ABE (Goyal et al.
[27]), the sender has an access policy to encrypt data. A writer
whose attributes and keys have been revoked cannot write back
stale information. The receiver receives attributes and secret keys
from the attribute authority and is able to decrypt information
if it has matching attributes. In Ciphertext-policy, CP-ABE ([28],
[29]), the receiver has the access policy in the form of a tree, with
attributes as leaves and monotonic access structure with AND, OR
and other threshold gates.
All the approaches take a centralized approach and allow only
one KDC, which is a single point of failure. Chase [30] proposed
a multi-authority ABE, in which there are several KDC authorities
(coordinated by a trusted authority) which distribute attributes and
secret keys to users. Multi-authority ABE protocol was studied
in [31], [32], which required no trusted authority which requires
every user to have attributes from at all the KDCs. Recently,
Lewko and Waters [35] proposed a fully decentralized ABE where
users could have zero or more attributes from each authority and
did not require a trusted server. In all these cases, decryption at
user’s end is computation intensive. So, this technique might be
inefﬁcient when users access using their mobile devices. To get
over this problem, Green et al. [33] proposed to outsource the
decryption task to a proxy server, so that the user can compute
with minimum resources (for example, hand held devices). How-
ever, the presence of one proxy and one key distribution center
makes it less robust than decentralized approaches. Both these
approaches had no way to authenticate users, anonymously. Yang
et al. [34] presented a modiﬁcation of [33], authenticate users,
who want to remain anonymous while accessing the cloud.
To ensure anonymous user authentication Attribute Based Sig-
natures were introduced by Maji et al. [23]. This was also a
centralized approach. A recent scheme by the same authors [24]
takes a decentralized approach and provides authentication with-
out disclosing the identity of the users. However, as mentioned
earlier in the previous section it is prone to replay attack.
III. BACKGROUND
In this section, we present our cloud storage model, adversary
model and the assumptions we have made in the paper. Table I
presents the notations used throughout the paper. We also describe
mathematical background used in our proposed solution.
TABLE I
NOTATIONS
Symbols Meanings
Uu u-th User/Owner
Aj j-th KDC
A Set of KDCs
Lj Set of attributes that KDC Aj possesses
lj = |Lj| Number of attributes that KDC Aj possesses
I[j, u] Set of attributes that Aj gives to user Uu
for encryption/decryption
Iu Set of attributes that user Uu possesses
J[j, u] Set of attributes that Aj gives to user Uu
for claim attributes
Ju Set of attributes that user Uu possesses
as claim attributes
AT[j] KDC which has attribute j
P K[j]/SK[j] Public key/secret key of KDC Aj
for encryption/decryption
ski,u Secret key given by Aj corresponding to
attribute i given to user Uu
T P K/P SK Trustee public key/secret key
AP K[j]/ASK[j] Public key/secret key of KDC Aj
for verifying claim
X Boolean access structure
Y Claim policy
τ Time instant
R Access matrix of dimension m × h
M Matrix of dimension l × t corresponding
to the claim predicate
MSG Message
|MSG| Size of message MSG
C Ciphertext
H, H Hash functions, example SHA-1
A. Assumptions
We make the following assumptions in our work.
1) The cloud is honest-but-curious, which means that the
cloud administrators can be interested in viewing user’s

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content, but cannot modify it. This is a valid assumption
that has been made in [12], [13]. Honest-but-curious model
of adversaries do not tamper with data so that they can keep
the system functioning normally and remain undetected.
2) Users can have either read or write or both accesses to a
file stored in the cloud.
3) All communications between users/clouds are secured by
Secure Shell Protocol, SSH.
B. Formats of access policies
Access policies can be in any of the following formats: 1)
Boolean functions of attributes, 2) Linear Secret Sharing Scheme
(LSSS) matrix, or 3) Monotone span programs. Any access struc-
ture can be converted into a Boolean function [35]. An example
of a Boolean function is ((a1 ∧a2 ∧a3)∨(a4 ∧a5))∧(a6 ∨a7)),
where a1, a2, . . . , a7 are attributes.
Let Y : {0, 1}n
→ {0, 1} be a monotone Boolean function [24].
A monotone span program for Y over a field F is an l × t matrix
M with entries in F, along with a labeling function a : [l] → [n]
that associates each row of M with an input variable of Y, such
that, for every (x1, x2 . . . , xn) ∈ {0, 1}n
, the following condition
is satisfied:
Y(x1, x2, . . . , xn) = 1 ⇔ ∃v ∈ F1×l
: vM = [1, 0, 0, . . ., 0]
and (∀i : xa(i) = 0 ⇒ vi = 0)
In other words, Y(x1, x2, . . . , xn) = 1 if and only if the rows of
M indexed by {i|xa(i) = 1} span the vector [1, 0, 0, . . ., 0]. Span
programs can be constructed from Boolean functions in a similar
way as shown later in Section V.
C. Mathematical background
We will use bilinear pairings on elliptic curves. Let G be a
cyclic group of prime order q generated by g. Let GT be a group
of order q. We can define the map e : G × G → GT . The map
satisfies the following properties:
1) e(aP, bQ) = e(P, Q)ab
for all P, Q ∈ G and a, b ∈ Zq,
Zq = {0, 1, 2, . . ., q − 1}.
2) Non-degenerate: e(g, g) = 1.
Bilinear pairing on elliptic curves groups are used. We do not
discuss the pairing functions which mainly use Weil and Tate
pairings [36] and computed using Miller’s algorithm. The choice
of curve is an important consideration because it determines the
complexity of pairing operations.
D. Attribute based encryption
Attribute based encryption with multiple authorities as pro-
posed by Lewko and Waters [35] proceeds as follows [16]:
1) System Initialization: Select a prime q, generator g of G0,
groups G0 and GT of order q, a map e : G0 × G0 → GT , and
a hash function H : {0, 1}∗
→ G0 which maps the identities
of users to G0. The hash function used here is SHA-1. Each
KDC Aj ∈ A has a set of attributes Lj. The attributes disjoint
(Li Lj = φ for i = j). Each KDC also chooses two random
exponents αi, yi ∈ Zq. The secret key of KDC Aj is
SK[j] = {αi, yi, i ∈ Lj}. (1)
The public key of KDC Aj is published:
PK[j] = {e(g, g)αi
, gyi
, i ∈ Lj}. (2)
2) Key generation and distribution by KDCs: User Uu receives
a set of attributes I[j, u] from KDC Aj, and corresponding secret
key ski,u for each i ∈ I[j, u]
ski,u = gαi
H(u)yi
, (3)
where αi, yi ∈ SK[j]. Note that all keys are delivered to the user
securely using the user’s public key, such that only that user can
decrypt it using its secret key.
3) Encryption by sender: The encryption function is
ABE.Encrypt(MSG, X). Sender decides about the access tree
X. LSSS matrix R can be derived as described in III-B. Sender
encrypts message MSG as follows:
1) Choose a random seed s ∈ Zq and a random vector
v ∈ Zh
q , with s as its first entry; h is the number of leaves
in the access tree (equal to the number of rows in the
corresponding matrix R).
2) Calculate λx = Rx · v, where Rx is a row of R.
3) Choose a random vector w ∈ Zh
q with 0 as the first entry.
4) Calculate ωx = Rx · w.
5) For each row Rx of R, choose a random ρx ∈ Zq.
6) The following parameters are calculated:
C0 = MSGe(g, g)s
C1,x = e(g, g)λx
e(g, g)απ(x)ρx
, ∀x
C2,x = gρx
∀x
C3,x = gyπ(x)ρx
gωx
∀x,
(4)
where π(x) is mapping from Rx to the attribute i that is
located at the corresponding leaf of the access tree.
7) The ciphertext C is sent by the sender (it also includes the
access tree via R matrix):
C = R, π, C0, {C1,x, C2,x, C3,x, ∀x} . (5)
4) Decryption by receiver: The decryption function is
ABE.Decrypt(C, {ski,u}), where C is given by equation (13).
Receiver Uu takes as input ciphertext C, secret keys {ski,u},
group G0, and outputs message msg. It obtains the access matrix
R and mapping π from C. It then executes the following steps:
1) Uu calculates the set of attributes {π(x) : x ∈ X} Iu that
are common to itself and the access matrix. X is the set of
rows of R.
2) For each of these attributes, it checks if there is a subset
X of rows of R, such that the vector (1, 0 . . ., 0) is their
linear combination. If not, decryption is impossible. If yes,
it calculates constants cx ∈ Zq, such that x∈X cxRx =
(1, 0, . . . , 0).
3) Decryption proceeds as follows:
a) For each x ∈ X , dec(x) =
C1,xe(H(u),C3,x)
e(skπ(x),u,C2,x)
b) Uu computes MSG = C0/Πx∈X dec(x).
E. Attribute based signature scheme
Attribute based signature scheme [24] has the following steps.

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1) System Initialization: Select a prime q, and groups G1 and
G2, which are of order q. We define the mapping ê : G1 × G1 →
G2. Let g1, g2 be generators of G1 and hj be generators of G2,
for j ∈ [tmax], for arbitrary tmax. Let H be a hash function. Let
A0 = ha0
0 , where a0 ∈ Z∗
q is chosen at random. (T Sig, T V er)
mean T Sig is the private key with which a message is signed
and T V er is the public key used for verification. The secret key
for the trustee is T SK = (a0, T Sig) and public key is T PK =
(G1, G2, H, g1, A0, h0, h1, . . . , htmax , g2, T V er).
2) User registration: For a user with identity Uu the KDC
draws at random Kbase ∈ G. Let K0 = K
1/a0
base . The following
token γ is output
γ = (u, Kbase, K0, ρ), (6)
where ρ is signature on u||Kbase using the signing key T Sig.
3) KDC setup: Choose a, b ∈ Z∗
q randomly and compute:
Aij = ha
j , Bij = hb
j, for Ai ∈ A, j ∈ [tmax]. The private
key of i-th KDC is ASK[i] = (a, b) and public key APK[i] =
(Aij, Bij|j ∈ [tmax]).
4) Attribute generation: The token verification algorithm ver-
ifies the signature contained in γ using the signature verification
key T V er in T PK. This algorithm extracts Kbase from γ
using (a, b) from ASK[i] and computes Kx = K
1/(a+bx)
base ,
x ∈ J[i, u]. The key Kx can be checked for consistency
using algorithm ABS.KeyCheck(T PK, APK[i], γ, Kx), which
checks ê(Kx, AijBx
ij) = ê(Kbase, hj), for all x ∈ J[i, u] and
j ∈ [tmax].
5) Sign: The algorithm ABS.Sign(T PK, {APK[i] : i ∈
AT [u]}, γ, {Kx : x ∈ Ju}, MSG, Y), has input the public key of
the trustee, the secret key of the signer, the message to be signed
and the policy claim Y. The policy claim is first converted into
the span program M ∈ Zl×t
q , with rows labeled with attributes.
Mx denotes row x of M. Let π denote the mapping from
rows to the attributes. So, π (x) is the mapping from Mx to
attribute x. A vector v is computed which satisfies the assignment
{x : x ∈ J[i, u]}. Compute μ = H(MSG||Y). Choose r0 ∈ Z∗
q
and ri ∈ Zq, i ∈ Ju, and compute:
Y = Kr0
base,Si = (Kvi
i )r0
.(g2gμ
1 )ri
(∀i ∈ Ju) (7)
W = Kr0
0 ,Pj = Πi∈AT [u](AijB
π (i)
ij )Mij ri
(∀j ∈ [t]) (8)
The signature is calculated as
σ = (Y, W, S1, S2, . . . , St, P1, P2, . . . , Pt). (9)
6) Verify: Algorithm ABS.V erify(T PK,
σ = (Y, W, S1, S2, . . . , St, P1, P2, . . . , Pt), MSG, Y),
converts Y to the corresponding monotone program M ∈ Zl×t
q ,
with rows labeled with attributes. Compute μ = H(MSG||Y).
If Y = 1, ABS.V erify = 0 meaning false. Otherwise, the
following constraints are checked.
ê(W, A0)
?
= ê(Y, h0) (10)
Πi∈lê(Si, Ai jB
π (i)
i j )Mij
)
?
=
ê(Y, h1)ê(g2gμ
1 , P1), j = 1
ê(g2gμ
1 , Pj), j > 1,
(11)
where i = AT [i].
Fig. 1. Our secure cloud storage model
IV. PROPOSED PRIVACY PRESERVING AUTHENTICATED
ACCESS CONTROL SCHEME
In this section we propose our privacy preserving authenticated
access control scheme. According to our scheme a user can create
a file and store it securely in the cloud. This scheme consists of
use of the two protocols ABE and ABS, as discussed in Section
III-D and III-E respectively. We will first discuss our scheme
in details and then provide a concrete example to demonstrate
how it works. We refer to the Fig. 1. There are three users, a
creator, a reader and writer. Creator Alice receives a token γ
from the trustee, who is assumed to be honest. A trustee can
be someone like the federal government who manages social
insurance numbers etc. On presenting her id (like health/social
insurance number), the trustee gives her a token γ. There are
multiple KDCs (here 2), which can be scattered. For example,
these can be servers in different parts of the world. A creator
on presenting the token to one or more KDCs receives keys for
encryption/decryption and signing. In the Fig. 1, SKs are secret
keys given for decryption, Kx are keys for signing. The message
MSG is encrypted under the access policy X. The access policy
decides who can access the data stored in the cloud. The creator
decides on a claim policy Y, to prove her authenticity and signs
the message under this claim. The ciphertext C with signature is
c, and is sent to the cloud. The cloud verifies the signature and
stores the ciphertext C. When a reader wants to read, the cloud
sends C. If the user has attributes matching with access policy,
it can decrypt and get back original message.
Write proceeds in the same way as file creation. By designating
the verification process to the cloud, it relieves the individual users
from time consuming verifications. When a reader wants to read
some data stored in the cloud, it tries to decrypt it using the
secret keys it receives from the KDCs. If it has enough attributes
matching with the access policy, then it decrypts the information
stored in the cloud.

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A. Data storage in clouds
A user Uu first registers itself with one or more trustees. For
simplicity we assume there is one trustee. The trustee gives it a
token γ = (u, Kbase, K0, ρ), where ρ is the signature on u||Kbase
signed with the trustees private key T Sig (By Equation 6). The
KDCs are given keys PK[i], SK[i] for encryption/decryption and
ASK[i], APK[i] for signing/verifying. The user on presenting
this token obtains attributes and secret keys from one or more
KDCs. A key for an attribute x belonging to KDC Ai is calculated
as Kx = K
1/(a+bx)
base , where (a, b) ∈ ASK[i]. The user also
receives secret keys skx,u for encrypting messages. The user then
creates an access policy X which is a monotone Boolean function.
The message is then encrypted under the access policy as
C = ABE.Encrypt(MSG, X) (12)
The user also constructs a claim policy Y to enable the cloud
to authenticate the user. The creator does not send the message
MSG as is, but uses the time stamp τ and creates H(C)||τ. This
is done to prevent replay attacks. If the time stamp is not sent,
then the user can write previous stale message back to the cloud
with a valid signature, even when its claim policy and attributes
have been revoked. The original work by Maji et al. [24] suffers
from replay attacks. In their scheme, a writer can send its message
and correct signature even when it no longer has access rights.
In our scheme a writer whose rights have been revoked cannot
create a new signature with new time stamp and thus cannot write
back stale information. It then signs the message and calculates
the message signature as
σ = ABS.Sign(Public key of trustee, Public key of KDCs,
token, signing key, message, access claim)
The following information is then sent in the cloud.
c = (C, τ, σ, Y). (13)
The cloud on receiving the information verifies the access claim
using the algorithm ABS.verify. The creator checks the value of
V = ABS.V erify(T PK, σ, c, Y). If V = 0, then authentication
has failed and the message is discarded. Else, the message (C, τ)
is stored in the cloud.
B. Reading from the cloud
When a user requests data from the cloud, the cloud sends
the ciphertext C using SSH protocol. Decryption proceeds using
algorithm ABE.Decrypt(C, {ski,u}) and the message MSG is
calculated as given in Section III-D4.
C. Writing to the cloud
To write to an already existing file, the user must send its
message with the claim policy as done during file creation. The
cloud verifies the claim policy, and only if the user is authentic,
is allowed to write on the file.
Fig. 2. Example of claim policy
D. User revocation
We have just discussed how to prevent replay attacks. We will
now discuss how to handle user revocation. It should be ensured
that users must not have the ability to access data, even if they
possess matching set of attributes. For this reason, the owners
should change the stored data and send updated information to
other users. The set of attributes Iu possessed by the revoked
user Uu is noted and all users change their stored data that have
attributes i ∈ Iu. In [13], revocation involved changing the public
and secret keys of the minimal set of attributes which are required
to decrypt the data. We do not consider this approach because
here different data are encrypted by the same set of attributes, so
such a minimal set of attributes is different for different users.
Therefore, this does not apply to our model. Once the attributes
Iu are identified, all data that possess the attributes are collected.
For each such data record, the following steps are then carried
out:
1) A new value of s, snew ∈ Zq is selected.
2) The first entry of vector vnew is changed to new snew.
3) λx = Rxvnew is calculated, for each row x corresponding
to leaf attributes in Iu.
4) C1,x is recalculated for x.
5) New value of C1,x is securely transmitted to the cloud.
6) New C0 = Me(g, g)snew
is calculated and stored in the
cloud
7) New value of C1,x is not stored with the data, but is
transmitted to users, who wish to decrypt the data.
We note here that the new value of C1,x is not stored in the
cloud but transmitted to the non-revoked users who have attribute
corresponding to x. This prevents a revoked user to decrypt the
new value of C0 and get back the message.
V. REAL LIFE EXAMPLE
We now revisit the problem we stated in the introduction. We
will use a relaxed setting. Suppose Alice is a Law student and
wants to send a series of reports about malpractices by authorities
of University X to all the professors of University X, Research
chairs of universities X, Y, Z and students belonging to Law
department in university X. She wants to remain anonymous,
while publishing all evidence. All information is stored in the
cloud. It is important that users should not be able to know her

7
identity, but must trust that the information is from a valid source.
For this reason she also sends a claim message which states that
she “Is a law student” or “Is a student counselor” or “Professor
at university X”. The tree corresponding to the claim policy is
shown in Figure 2.
The leaves of the tree consists of attributes and the intermediary
nodes consists of Boolean operators. In this example the attributes
are “Student”, “Prof”, “Dept Law”, “Uni X”, “Counselor”. The
above claim policy can be written as a Boolean function of
attributes as
((Student AND Dept Law) OR (Prof AND Uni X)) OR (Student
Counselor).
Boolean functions can also be represented by access tree,
with attributes at the leaves and AND(∧) and OR(∨) as the
intermediate nodes and root. Boolean functions can be converted
to LSSS matrix as below: Let v[x] be parents vector. If node
x = AND, then the left child is (v[x]|1), and the right child is
(0, . . . , 1). If x = OR, then both children also have unchanged
vector v[x]. Finally, pad with 0s in front, such that all vectors are
of equal length. The proof of validity of the algorithm is given
in [25]. We do not present it here due to lack of space.
Using this algorithm, the span program for this policy is
M =
⎛
⎜
⎜
⎜
⎜
⎝
1 1
0 −1
1 1
0 −1
1 0
⎞
⎟
⎟
⎟
⎟
⎠
.
An assignment v = (v1, v2, v3, v4, v5) satisfies this span program
if vM = (1, 0).
The cloud should verify that Alice indeed satisfies this claim.
Since she is a Law student, v = (1, 1, 0, 0, 0) and is a valid
assignment. As a valid user she can then store all the encrypted
records under the set of access policy that she has decided. The
access policy in case of Alice is
((Prof AND Uni. X) OR
(Research Chair AND ((Uni X OR Uni Y) OR Uni Z)) OR
((Student AND Dept Law)AND Uni X)
Later when a valid user, say Bob wants to modify any of these
reports he also attaches a set of claims which the cloud verifies.
For example, Bob is a research chair and might send a claim
“Research chair” or “Department head” which is then verified by
the cloud. It then sends the encrypted data to the Bob. Since Bob
is a valid user and has matching attributes, he can decrypt and
get back the information.
If Bob wants to read the contents without modifying them, then
there is no need to attach a claim. He will be able to decrypt only
if he is a Professor in University X or a Research chair in one
of the universities X, Y, Z or a student belonging to Department
of Law in university X.
Here it is to be noted that the attributes can belong to several
KDCs. For example the Professors belonging to university X have
credentials given by the university X, and a Ph. D. degree from
a University P, the student counselor might be a psychologist au-
thorized by the Canadian Psychological Association and assigned
an employee number by a university, the research chairs can be
jointly appointed by the universities X, Y , Z and the government.
The students can have credentials from the university and also a
department.
Initially Alice goes to a trustee for example the Canadian health
service and presents her a health insurance number or federal
agency presents her a social insurance number. Either or both
of these trustees can give her token(s) γ = (u, Kbase, K0, ρ).
With the token she approaches the KDCs in the university X
and department D and obtains the secret keys for decryption and
for keys Kx and Ky for signing the assess policy. She can also
access the public keys APK[i] of other KDCs. The entire process
is carried on in the following way:
A. Data Storage in clouds
Let the data be denoted by MSG, X is the access policy-
((Prof AND Uni. X) OR
(Research Chair AND ((Uni X OR Uni Y) OR Uni Z)) OR
((Student AND Dept Law)AND Uni X)
Alice encrypts the data and obtains the ciphertext
C = Enc(MSG, X).
Alice also decides on a claim policy Y which is shown in
Figure 2. From the matrix, v = (1, 1, 0, 0, 0) can be calculated.
The values of Y, W, S1, S2, S3, S4, S5, P1, P2 can be calculated.
μ = H(MSG||Y). The current time stamp τ is attached to the
ciphertext to prevent replay attacks. The signature σ is calculated
as ABS.Sign. The ciphertext
c = (C, τ, σ, Y)
is then send to the cloud. The cloud verifies the signature using
the function ABS.V erify as given in Equation (11). If Alice
has valid credentials then the ciphertext (C, τ) is stored, else it
is discarded.
B. Reading from the cloud and modifying data
Suppose Bob wants to access the records stored by Alice. Bob
then decrypts the message MSG using his secret keys using
function ABE.Decrypt. Writing proceeds like file creation. It
is to be noted that the time τ is added to the data so that even if
Bob’s credentials are revoked, he cannot write stale data in the
cloud.
VI. SECURITY OF THE PROTOCOL
In this section we will prove the security of the protocol. We
will show that our scheme authenticates a user who wants to write
to the cloud. A user can only write provided the cloud is able to
validate its access claim. An invalid user cannot receive attributes
from a KDC, if it does not have the credentials from the trustee.
If a user’s credentials are revoked, then it cannot replace data
with previous stale data, thus preventing replay attacks.

8
Theorem 1: Our access control scheme is secure (no outsider
or cloud can decrypt ciphertexts), collusion resistant and allows
access only to authorized users.
Proof: We first show that no unauthorized user can access
data from the cloud. We will first prove the validity of our scheme.
A user can decrypt data if and only if it has a matching set
of attributes. This follows from the fact that access structure S
(and hence matrix R) is constructed if and only if there exists a
set of rows X in R, and linear linear constants cx ∈ Zq, such
that x∈X cxRx = (1, 0, . . ., 0). A proof of this appear in [25,
Chapter 4].
We note that
dec(x) =
C1,xe(H(u),C3,x)
e(skπ(x),u,C2,x) = e(g, g)λx
e(H(u), g)ωx
(14)
Thus,
Πx∈X dec(x)
= Πx∈X (e(g, g)λx
e(H(u), g)ωx
)cx
= e(g, g)s
(15)
Equation (15) above holds because λx = Rx · v and ωx =
Rx · w, where v · (1, 0, . . . , 0) = r and ω · (1, 0, . . . , 0) = 0.
C0/Πx∈X dec(x) = C0/e(g, g)s
= M.
For an invalid user, there does not exists attributes correspond-
ing to rows x, such that x∈X cxRx = (1, 0, . . . , 0). Thus
e(g, g)s
cannot be calculated.
We next show that two or more users cannot collude and gain
access to data that they are not individually supposed to access.
Suppose that there exist attributes π(x) from the colluders, such
that x∈X cxRx = (1, 0, . . ., 0). However, e(H(u), g)ωx
needs
to be calculated according to Eq. (15). Since different users
have different values of e(H(u), g), even if they combine their
attributes, they cannot decrypt the message.
We next observe that the cloud cannot decode stored data. This
is because it does not posses the secret keys ski,u (by Eq.(3)).
Even if it colludes with other users, it cannot decrypt data which
the users cannot themselves decrypt, because of the above reason
(same as collusion of users). The KDCs are located in different
servers and are not owned by the cloud. For this reason, even
if some (but not all) KDCs are compromised, the cloud cannot
decode data.
Theorem 2: Our authentication scheme is correct, collusion
secure, resistant to replay attacks, and protects privacy of the
user.
Proof: We first note that only valid users registered with
the trustee(s) receive attributes and keys from the KDCs. A
user’s token is γ = (u, Kbase, K0, ρ), where ρ is signature on
u||Kbase with T Sig belonging to the trustee. An invalid user
with a different user-id cannot create the same signature because
it does not know T Sig.
We next show that only a valid user with valid access claim is
only able to store the message in the cloud. This follows from the
functions ABS.Sign and ABS.V erify given in Section III-E.
A user who wants to create a file and tries to make a false access
claim, cannot do so, because it will not have attribute keys Kx
from the related KDCs. At the same time since the message is
encrypted, a user without valid access policy cannot decrypt and
change the information.
Two users cannot collude and create an access policy consisting
of attributes shared between them. Suppose, there are two users
A and B who have attributes xA and xB respectively. They
have the following information KbaseA , KxA and KbaseB , KxB ,
respectively. A new value of KxB = K
1/(a+bx )
baseA
cannot be
calculated by B, because it does not know the values of (a, b).
Thus the authentication is collusion secure.
Our scheme is resistant to replay attacks. If a writer’s access
claims are revoked, it cannot replace a data with stale information
from previous writes. This is because it has to attach a new time
stamp τ and sign the message H(C)||τ again. Since it does not
have attributes, it cannot have a valid signature.
The mathematical proofs of security of our scheme follows
from the security proofs of [35], [23] and has been omitted for
the lack of space.
VII. COMPUTATION COMPLEXITY
In this section we present the computation complexity of the
privacy preserving access control protocol. We will calculate
the computations required by users (creator, reader, writer) and
that by the cloud. Table II presents notations used for different
operations.
TABLE II
NOTATIONS
Symbols Computation
Ex Exponentiation in group Gx
τH Time to hash using function H
τH Time to hash using function H
τP /τ ˆP
Time taken to perform 1 pairing operation in e/ê
|G| Size of group G
a Number of KDCs which contribute keys to user
The creator needs to encrypt the message and sign it. Creator
needs to calculate one pairing e(g, g). Encryption takes 2 ex-
ponentiations to calculate each of C1,x. So this requires 2mET
time, where m is the number of attributes. User needs to calculate
3 exponentiation to calculate C2,x and C3,x. So time taken for
encryption is (3m + 1)E0 + 2mET + τP . To sign the message,
Y, W, Sis and Pjs have to be calculated as well as H(C). So,
time taken to sign is (2l + 2)E1 + 2tE2 + τH.
The cloud needs to verify the signature. This requires checking
for equation (11). Time taken to verify is (l + 2t)τ ˆP + l(E1 +
E2) + τH. To read, a user needs only to decrypt the cipher-
text. This requires 2m pairings to calculate e(H(u), C3,x) and
e(skπ(x),u, C2,x) and O(mh) to find the vector c. Decryption
takes 2mτP +τH +O(mh). Writing is similar to creating a record.
The size of ciphertext with signature is 2m|G0|+m|GT |+m2
+
|MSG| + (l + t + 2)|G1|.
When revocation is required, C0 needs to be recalculated.
e(g, g) is previously calculated. So, only one scalar multiplication
is needed. If the user revoked is Uu, then for each x, C1,x has
to be recomputed. e(g, g) is already computed. Thus, only two
scalar multiplication needs to be done, for each x. So a total of

9
TABLE III
COMPARISON OF OUR SCHEME WITH EXISTING ACCESS CONTROL SCHEMES
Schemes Fine-grained Centralized/ Write/read Type of Privacy preserving User
access control Decentralized access access control authentication revocation?
[38] Yes Centralized 1-W-M-R Symmetric key cryptography No authentication No
[12] Yes Centralized 1-W-M-R ABE No authentication No
[16] Yes Decentralized 1-W-M-R ABE No authentication Yes
[34] Yes Decentralized 1-W-M-R ABE Not privacy preserving Yes
[15] Yes Centralized M-W-M-R ABE Authentication No
Ours Yes Decentralized M-W-M-R ABE Authentication Yes
TABLE IV
COMPARISON OF COMPUTATION AND SIZE OF CIPHERTEXT WHILE CREATING A FILE
Schemes Computation by creator Computation by cloud Size of ciphertext
[12] (m + 2)E0 0 m log |G0| + |GT | + m log m + |MSG|
[13] (m + 2)E0 0 m log |G0| + |G1| + |MSG|
[16] (3m + 1)E0 + 2mET + τP (encrypt) 0 2m|G0| + m|GT | + m2
+ |MSG|
[33] (2m + 1)E0 + ET + τP (encrypt) mE0 + mET + (m + 1)Tp (2m + 1)|G0| + |GT | + m2
+ |MSG|
[34] (4m + 1)E0 + 2aET + τP (encrypt) 3maET + (3ma + 1)τP (3m + 1)|G0| + |GT | + m2
+ |MSG|
[15] E1 + (2m + 1)E0 + mτH (encrypt) (l + 2t)τ ˆP + l(E1 + E2) + τH (verify) |G2| + (2m + 1)|G1| + |MSG|
(2l + 2)E1 + 2tE2 + τH (sign) +(l + t + 2)|G1| + m2
Our approach (3m + 1)E0 + 2mET + τP (encrypt) (l + 2t)τ ˆP + l(E1 + E2) + τH (verify) 2m|G0| + m|GT | + m2
+ |MSG|
(2l + 2)E1 + 2tE2 + τH (sign) +(l + t + 2)|G1|
TABLE V
COMPARISON OF COMPUTATION DURING READ AND WRITE BY USER AND CLOUD
Schemes Computation by user while write Computation by user while read Computation by cloud while write
[12] No write access mτP No write access
[13] No write access mτP No write access
[16] No write access 2mτP + τH + O(mh) No write access
[33] No write access E0 + τH + O(mh) No write access
[34] No write access E0 + τH + O(mh) No write access
[15] E1 + (2m + 1)E0 + mτH (encrypt) (2m + 1)τP (decrypt) (l + 2t)τ ˆP + l(E1 + E2) + τH (verify)
(2l + 2)E1 + 2tE2 + τH (sign)
Our approach (3m + 1)E0 + 2mET + τP (encrypt) 2mτP + τH + O(mh) (decrypt) (l + 2t)τ ˆP + l(E1 + E2) + τH (verify)
(2l + 2)E1 + 2tE2 + τH (sign)
2m + 1 scalar multiplications are done by the cloud, where m
is the number of attributes belonging to all revoked users. Users
need not compute any scalar multiplication or pairing operations.
Additional communication overhead is O((m + 1)|GT |).
The curves chosen are either MNT curves (proposed by Miyaji,
Nakabayashi and Takano) or supersingular curves. Considering
the requirements, elliptic curve group of size 159, with an
embedding degree 6 (type d curves of Pairing based Cryptography
- PBC [36]) can be used. Pairing takes 14 ms on Intel Pentium
D, 3.0GHz CPU [16]. Such operations are very suitable for a
cloud computing environment. A new library for attribute based
encryption is also available at [37].
PBC library (Pairing Based Cryptography) [36] is a C library
which is built above GNU GMP (GNU Math Precision) library
and contains functions to implement elliptic curves and pairing
operations. Each element of G needs 512 bits at an 80-bit security
level and 1536 bits when 128-bit of security are chosen [39].
Each cryptographic operation was implemented using the PBC
library ver. 0.4.18 on a 3.0 GHZ processor PC. The public
key parameters were selected to provide 80-bit security level.
According to [39], implementation uses 160-bit elliptic curve
group on the supersingular curve y2
= x3
+ x over a 512-bit
ﬁnite ﬁeld. The computational cost for a pairing operation is 2.9
ms and that of exponentiation on G (and G0) and GT (and G2)
are 1 ms and 0.2 ms respectively.
We will compare our computation costs with existing schemes
like [13], [12], [15] in next Section VIII.
VIII. COMPARISON WITH OTHER ACCESS CONTROL SCHEMES
IN CLOUD
We compare our scheme with other access control schemes
(in Table III) and show that our scheme supports many features
that the other schemes did not support. 1-W-M-R means that
only one user can write while many users can read. M-W-

10
M-R means that many users can write and read. We see that
most schemes do not support many writes which is supported
by our scheme. Our scheme is robust and decentralized, most
of the others are centralized. Our scheme also supports privacy
preserving authentication, which is not supported by others. Most
of the schemes do not support user revocation, which our scheme
does. In Tables IV and V we compare the computation and
communication costs incurred by the users and clouds and show
that our distributed approach has comparable costs to centralized
approaches. The most expensive operations involving pairings and
is done by the cloud. If we compare the computation load of user
during read we see that our scheme has comparable costs. Our
scheme also compares well with the other authenticated scheme
of [15].
IX. CONCLUSION
We have presented a decentralized access control technique
with anonymous authentication, which provides user revocation
and prevents replay attacks. The cloud does not know the identity
of the user who stores information, but only verifies the user’s
credentials. Key distribution is done in a decentralized way. One
limitation is that the cloud knows the access policy for each record
stored in the cloud. In future, we would like to hide the attributes
and access policy of a user.
ACKNOWLEDGEMENT
This work is partially supported by NSERC Grant
CRDPJ386874-09 and the grant: “Digital signal processing, and
the synthesis of an information security system”, TR32054,
Serbian Ministry of Science and Education.
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IEEE TRANSACTIONS ON PARALLEL AND DISTRIBUTED SYSTEMS
This article has been accepted for publication in a future issue of this journal, but has not been fully edited. Content may change prior to final publication.

11
Sushmita Ruj received her B.E. degree in Computer Science
from Bengal Engineering and Science University, Shibpur, India
in 2004, and Masters and Ph D in Computer Science from Indian
Statistical Institute, India in 2006 and 2010, respectively. Between
2009 and 2010, she was a Erasmus Mundus Post Doctoral Fellow
at Lund University, Sweden and between 2010 and 2012, she was
a Post Doctoral Fellow at University of Ottawa, Canada. She is
currently an Assistant Professor at Indian Institute of Technology,
Indore, India. Her research interests are in security in mobile
ad hoc networks, vehicular networks, cloud security, security
in smart grids, combinatorics and cryptography. She is on the
Editorial Board of Ad Hoc and Sensor Wireless Networks.
Milos Stojmenovic received the Bachelor of Computer Science
degree at the School of Information Technology and Engineering,
University of Ottawa, in 2003. He obtained his Masters degree
in computer science at Carleton University in Ottawa, Canada in
2005, and completed his PhD in the same field at the University
of Ottawa, Canada in 2008. Currently he is an Assistant Professor
at the Singidunum University, Serbia. He was a visiting researcher
at Japans National Institute of Advanced Industrial Science and
Technology in 2009. He published over thirty articles in the fields
of computer vision, image processing, and wireless networks. His
work implements machine learning techniques such as AdaBoost
and SVM classification which in turn use Higher order Auto-
correlation features (HLAC) to perform Image segmentation and
classification.
Amiya Nayak received his B.Math. degree in Computer
Science and Combinatorics & Optimization from University of
Waterloo in 1981, and Ph.D. in Systems and Computer En-
gineering from Carleton University in 1991. He has over 17
years of industrial experience in software engineering, avionics
and navigation systems, simulation and system level performance
analysis. He is in the Editorial Board of several journals, in-
cluding IEEE Transactions on Parallel & Distributed Systems,
International Journal of Parallel, Emergent and Distributed Sys-
tems, International Journal of Computers and Applications, and
EURASIP Journal of Wireless Communications and Networking.
Currently, he is a Full Professor at the School of Electrical
Engineering and Computer Science at the University of Ottawa.
His research interests are in the area of fault tolerance, distributed
systems/algorithms, and mobile ad hoc networks with over 150
publications in refereed journals and conference proceedings.

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